We discuss versions of isolation lemma for problems in NP and NL. We then show that improving the success probability of the isolation lemma is equivalent to some complexity theoretic collapses such as NP is in P/poly and NL is in L/poly. Basic familiarity with complexity classes such as NP, P/poly, NL will be assumed. All the other notions used in the talk will be introduced during the talk.
Deterministic Finite State Automata (DFAs) are machines that read input strings and determine whether to accept or reject them based on their state transitions. A DFA is defined as a 5-tuple (Q, Σ, δ, q0, F) where Q is a finite set of states, Σ is a finite input alphabet, q0 is the starting state, F is the set of accepting states, and δ is the transition function that maps a state and input symbol to the next state. The language accepted by a DFA is the set of strings that cause the DFA to enter an accepting state. Nondeterministic Finite State Automata (NFAs) are similar but δ maps to sets of states rather
This document provides an overview of deterministic finite automata (DFA) through examples and practice problems. It begins with defining the components of a DFA, including states, alphabet, transition function, start state, and accepting states. An example DFA is given to recognize strings ending in "00". Additional practice problems involve drawing minimal DFAs, determining the minimum number of states for a language, and completing partially drawn DFAs. The document aims to help students learn and practice working with DFA models.
This document contains notes from a course on theory of computation taught by Professor Michael Sipser at MIT in Fall 2012. The notes were taken by Holden Lee and cover 25 lectures on topics including finite automata, regular expressions, context-free grammars, pushdown automata, Turing machines, decidability, and complexity theory. In particular, the notes summarize key definitions, theorems, and problems discussed in each lecture, with the overarching goal of understanding what types of problems can and cannot be solved by a computer.
The document describes the syllabus for the course "Formal Languages and Automata Theory". It contains:
- 8 units covering topics like introduction to finite automata, regular expressions, context-free grammars, pushdown automata, Turing machines, and more.
- Details of each unit including hours, chapters covered from the textbook, and topics discussed.
- Information about internal assessment and exams, including marks distribution.
- Names of two recommended textbooks and their relevant chapters.
- A table of contents listing the topics covered in each unit and their page numbers.
This document contains questions and answers related to finite automata theory. It begins with definitions of finite automata and their uses in text processing, compiler design, and hardware design. It then provides the formal definition of a deterministic finite automaton (DFA) and explains how a DFA processes strings using the transition function. Examples of DFAs are given for specific languages. Extended transition functions are described, along with examples of using them to represent languages. Specific languages are also given with their corresponding DFA diagrams and formal definitions.
Introduction to the theory of computationprasadmvreddy
This document provides an introduction and overview of topics in the theory of computation including automata, computability, and complexity. It discusses the following key points in 3 sentences:
Automata theory, computability theory, and complexity theory examine the fundamental capabilities and limitations of computers. Different models of computation are introduced including finite automata, context-free grammars, and Turing machines. The document then provides definitions and examples of regular languages and context-free grammars, the basics of finite automata and regular expressions, properties of regular languages, and limitations of finite state machines.
Formal Languages and Automata Theory Unit 1Srimatre K
The document describes the minimization of a deterministic finite automaton (DFA) using the equivalence theorem. It involves partitioning the states into sets where states in the same set are indistinguishable based on their transitions. The initial partition P0 separates final and non-final states. Subsequent partitions P1, P2, etc. further split sets if states within are distinguishable. The process stops when the partition no longer changes, resulting in the minimized DFA with states merged within each final set. An example application of the steps to a 6-state DFA is also provided.
Deterministic Finite State Automata (DFAs) are machines that read input strings and determine whether to accept or reject them based on their state transitions. A DFA is defined as a 5-tuple (Q, Σ, δ, q0, F) where Q is a finite set of states, Σ is a finite input alphabet, q0 is the starting state, F is the set of accepting states, and δ is the transition function that maps a state and input symbol to the next state. The language accepted by a DFA is the set of strings that cause the DFA to enter an accepting state. Nondeterministic Finite State Automata (NFAs) are similar but δ maps to sets of states rather
This document provides an overview of deterministic finite automata (DFA) through examples and practice problems. It begins with defining the components of a DFA, including states, alphabet, transition function, start state, and accepting states. An example DFA is given to recognize strings ending in "00". Additional practice problems involve drawing minimal DFAs, determining the minimum number of states for a language, and completing partially drawn DFAs. The document aims to help students learn and practice working with DFA models.
This document contains notes from a course on theory of computation taught by Professor Michael Sipser at MIT in Fall 2012. The notes were taken by Holden Lee and cover 25 lectures on topics including finite automata, regular expressions, context-free grammars, pushdown automata, Turing machines, decidability, and complexity theory. In particular, the notes summarize key definitions, theorems, and problems discussed in each lecture, with the overarching goal of understanding what types of problems can and cannot be solved by a computer.
The document describes the syllabus for the course "Formal Languages and Automata Theory". It contains:
- 8 units covering topics like introduction to finite automata, regular expressions, context-free grammars, pushdown automata, Turing machines, and more.
- Details of each unit including hours, chapters covered from the textbook, and topics discussed.
- Information about internal assessment and exams, including marks distribution.
- Names of two recommended textbooks and their relevant chapters.
- A table of contents listing the topics covered in each unit and their page numbers.
This document contains questions and answers related to finite automata theory. It begins with definitions of finite automata and their uses in text processing, compiler design, and hardware design. It then provides the formal definition of a deterministic finite automaton (DFA) and explains how a DFA processes strings using the transition function. Examples of DFAs are given for specific languages. Extended transition functions are described, along with examples of using them to represent languages. Specific languages are also given with their corresponding DFA diagrams and formal definitions.
Introduction to the theory of computationprasadmvreddy
This document provides an introduction and overview of topics in the theory of computation including automata, computability, and complexity. It discusses the following key points in 3 sentences:
Automata theory, computability theory, and complexity theory examine the fundamental capabilities and limitations of computers. Different models of computation are introduced including finite automata, context-free grammars, and Turing machines. The document then provides definitions and examples of regular languages and context-free grammars, the basics of finite automata and regular expressions, properties of regular languages, and limitations of finite state machines.
Formal Languages and Automata Theory Unit 1Srimatre K
The document describes the minimization of a deterministic finite automaton (DFA) using the equivalence theorem. It involves partitioning the states into sets where states in the same set are indistinguishable based on their transitions. The initial partition P0 separates final and non-final states. Subsequent partitions P1, P2, etc. further split sets if states within are distinguishable. The process stops when the partition no longer changes, resulting in the minimized DFA with states merged within each final set. An example application of the steps to a 6-state DFA is also provided.
FellowBuddy.com is an innovative platform that brings students together to share notes, exam papers, study guides, project reports and presentation for upcoming exams.
We connect Students who have an understanding of course material with Students who need help.
Benefits:-
# Students can catch up on notes they missed because of an absence.
# Underachievers can find peer developed notes that break down lecture and study material in a way that they can understand
# Students can earn better grades, save time and study effectively
Our Vision & Mission – Simplifying Students Life
Our Belief – “The great breakthrough in your life comes when you realize it, that you can learn anything you need to learn; to accomplish any goal that you have set for yourself. This means there are no limits on what you can be, have or do.”
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Formal Languages and Automata Theory unit 5Srimatre K
This document summarizes key concepts from Unit 5, including types of Turing machines, undecidability, recursively enumerable languages, Post's correspondence problem, and counter machines. It defines undecidable problems as those with no algorithm to solve them. Examples of undecidable problems include the halting problem and determining if a Turing machine accepts a language that is not recursively enumerable. Post's correspondence problem and its modified version are presented with examples. Recursively enumerable languages are defined and properties like concatenation, Kleene closure, union, and intersection are described. Counter machines are defined as having states, input alphabet, start/final states, and transitions that allow incrementing, decrementing, and checking if a
This document defines and provides examples of non-deterministic finite automata (NFA). It states that in an NFA, the transition to the next state for an input symbol is non-deterministic, meaning it can be any combination of states, unlike a DFA which transitions to a single state. An NFA is formally defined as a 5-tuple with states, input symbols, transition function, initial state, and final states. The document provides an example NFA and compares NFAs to DFAs. It concludes with practice problems for designing NFAs for different languages.
This document provides an overview of nondeterministic finite automata (NFAs). It begins by explaining how NFAs relax the requirement in deterministic finite automata (DFAs) that there be exactly one transition from each state on each input symbol. An NFA may have multiple possible transitions from a state on a given symbol. The document then discusses how NFAs use nondeterminism and spontaneous transitions to define the languages they accept. It introduces the concept of instantaneous descriptions to formally define how an NFA transitions between configurations and accepts strings. The language an NFA accepts is the set of strings where at least one sequence of transitions reaches an accepting state.
This document discusses rule-based systems and logic programming. It contains the following key points in 3 sentences:
The document introduces rule-based systems that represent knowledge as IF-THEN rules and facts, and describes forward chaining which applies rules to derive new facts from initial facts, and backward chaining which starts with a goal and looks for rules to prove the goal. It explains Horn clause logic and how Prolog implements backward chaining using Horn clauses. It also discusses how forward chaining can be used to dynamically add facts to a knowledge base and apply rules to derive new facts.
This document discusses finite automata and provides definitions and examples. It defines deterministic finite automata (DFA) and nondeterministic finite automata (NFA) and their components. It describes how strings are processed by DFAs using transition functions. Notations for finite automata like transition diagrams and tables are presented. The reasons for nondeterminism and how to convert NFAs to equivalent DFAs are summarized. Examples of finite automata design are provided.
This document discusses theory of computation and finite automata. It begins by defining theory of computation as dealing with the logic of computation using abstract machines called automata. It then defines basic terminology like symbols, alphabets, strings, and languages. Next, it introduces finite automata as the simplest machines that recognize patterns using a finite set of states. Deterministic finite automata and nondeterministic finite automata are described as the two types of finite automata, differing in their transition functions. Transition diagrams and tables are also presented as ways to represent finite automata.
1. Automata theory is the study of abstract machines and the problems they are able to solve. It is closely related to formal language theory as automata are often classified by the formal languages they can recognize.
2. A finite automaton is an abstract machine that consists of a finite number of states. It reads an input string and based on its current state and the next input symbol, transitions to the next state according to its transition function. If it ends in an accepting state, the input is accepted.
3. Deterministic finite automata (DFAs) are a type of finite automaton where the transition function maps each state-symbol pair to a unique next state. DFAs can be represented
This document discusses inference in first-order logic and various proof strategies. It begins by describing a general proof procedure that uses binary resolution and represents proofs as trees. It then discusses different proof strategies like unit preference, set of support strategy, input resolution, linear resolution, and SLD-resolution. SLD-resolution is described as a sound and complete proof procedure for definite clauses. The document also introduces the concepts of non-monotonic reasoning and default reasoning, describing both non-monotonic logic and default logic as approaches to modeling this type of reasoning.
This document provides an overview of the Propositional Calculus. It discusses:
- The language of propositional calculus using atoms, connectives, and well-formed formulas
- Rules of inference like modus ponens, conjunction introduction, and disjunction introduction
- Defining proofs and theorems based on applying rules of inference
- Semantics by associating logical elements with truth values under interpretations
- Important concepts like validity, equivalence, entailment, and the soundness and completeness of rules of inference.
- The propositional satisfiability (PSAT) problem and solving techniques like exhaustive search and GSAT.
Generazione Automatica di Test - S. Vuotto (Università di Sassari)Sardegna Ricerche
Presentazione di Simone Vuotto (Università di Sassari) in occasione della riunione del 7 giugno 2019 sul progetto PROSSIMO - PROgettazione, Sviluppo e ottimizzazione di Sistemi Intelligenti MultiOggetto.
This document provides an overview of topics that will be covered in a course on formal methods in software, including finite state machines, stack machines, specification languages, category theory, logic, and more. It discusses the need for formal methods in safety-critical domains like medical devices and aviation but not for applications like social media. As an example, it walks through a proof of the Euclidean algorithm for finding the greatest common divisor. It also covers important concepts in the field like Gödel's incompleteness theorems, the Entscheidungsproblem, the halting problem, and the Collatz conjecture. Finally, it discusses limitations of formal methods and approaches like unit testing.
The document provides information about a course on the theory of automata. It includes details such as the course title, prerequisites, duration, lectures, laboratories, and topics to be covered. The topics include finite automata, deterministic finite automata, non-deterministic finite automata, regular expressions, properties of regular languages, context-free grammars, pushdown automata, and Turing machines. It also lists reference books and textbooks, and the marking scheme for the course.
The document discusses finite automata and provides examples. It begins by defining a finite automaton as a machine with a finite number of states. It then discusses deterministic finite automata (DFAs) and non-deterministic finite automata (NFAs). The document provides an example of designing a finite automaton to control a toll gate. It also discusses representations of finite automata including state diagrams, transition diagrams, and transition tables.
This document provides an introduction to automata theory and finite automata. It defines an automaton as an abstract computing device that follows a predetermined sequence of operations automatically. A finite automaton has a finite number of states and can be deterministic or non-deterministic. The document outlines the formal definitions and representations of finite automata. It also discusses related concepts like alphabets, strings, languages, and the conversions between non-deterministic and deterministic finite automata. Methods for minimizing deterministic finite automata using Myhill-Nerode theorem and equivalence theorem are also introduced.
This document discusses regular expressions and finite automata. It begins by defining regular expressions over an alphabet and the basic operations of union, concatenation, and Kleene closure. Examples of regular expressions are given for various languages. Thompson's construction is described for converting a regular expression to a finite automaton. Arden's theorem and the equivalence of regular expressions and finite automata are discussed. The document then covers applications of regular expressions, algebraic laws for regular expressions, and ways to prove that languages are not regular. Finally, closure properties of regular languages under operations like union, intersection, and homomorphisms are proved.
The document discusses various concepts related to finite automata. It begins by defining a finite automaton as a mathematical model of a system with discrete inputs and outputs that can be in a finite number of states. A finite automaton consists of a finite set of states and transitions between states based on input symbols. The document then discusses formal languages, the functions of a head pointer and finite control, the two main types of finite automata (DFA and NFA), ways to represent automata, definitions of languages and transitions, regular expressions and languages, two-way finite automata, epsilon closure, equivalence of NFAs and DFAs, Moore and Mealy machines, and applications of finite automata such as lexical analysis.
Undecidability refers to problems that cannot be solved algorithmically. Alan Turing first proved the existence of undecidable problems in 1936. There are decidable problems that can be solved by a Turing machine in finite time, and undecidable problems for which no Turing machine can provide a definitive yes or no answer. Examples of undecidable problems include determining if a context-free grammar is ambiguous or if two context-free languages are equal. Rice's theorem states that any non-trivial semantic property of a language recognized by a Turing machine is undecidable. Undecidability has important implications in language theory and for analyzing programs and computational problems.
The document discusses context-free languages and pushdown automata. It defines context-free grammars and languages, and provides examples of grammars and the strings they generate. It also defines pushdown automata formally as a 6-tuple with states, input alphabet, stack alphabet, transition function, start state, and accept states. Pushdown automata are similar to finite automata but have an additional stack which allows them to recognize some non-regular languages.
The document summarizes a presentation about implementing form-based codes in New England. It discusses challenges and myths around using form-based codes in small New England towns, and provides examples of communities that have successfully adopted form-based codes, including Newport, VT, the Hamilton Canal District in Lowell, MA, and Simsbury, CT. The examples show how these towns used public workshops and consultants to develop regulations tailored to their visions for walkable mixed-use development.
The document is an acknowledgement by an intern thanking Allah for giving them the ability to complete their internship. They also thank their parents for their support, their supervisor Abdul Ahad from the Finance Department of PEL for guiding them, and the staff members who took time to help them learn about finance department processes and dealing with the bank. The intern is grateful for all the support without which they would have faced difficulties during their internship.
FellowBuddy.com is an innovative platform that brings students together to share notes, exam papers, study guides, project reports and presentation for upcoming exams.
We connect Students who have an understanding of course material with Students who need help.
Benefits:-
# Students can catch up on notes they missed because of an absence.
# Underachievers can find peer developed notes that break down lecture and study material in a way that they can understand
# Students can earn better grades, save time and study effectively
Our Vision & Mission – Simplifying Students Life
Our Belief – “The great breakthrough in your life comes when you realize it, that you can learn anything you need to learn; to accomplish any goal that you have set for yourself. This means there are no limits on what you can be, have or do.”
Like Us - https://www.facebook.com/FellowBuddycom
Formal Languages and Automata Theory unit 5Srimatre K
This document summarizes key concepts from Unit 5, including types of Turing machines, undecidability, recursively enumerable languages, Post's correspondence problem, and counter machines. It defines undecidable problems as those with no algorithm to solve them. Examples of undecidable problems include the halting problem and determining if a Turing machine accepts a language that is not recursively enumerable. Post's correspondence problem and its modified version are presented with examples. Recursively enumerable languages are defined and properties like concatenation, Kleene closure, union, and intersection are described. Counter machines are defined as having states, input alphabet, start/final states, and transitions that allow incrementing, decrementing, and checking if a
This document defines and provides examples of non-deterministic finite automata (NFA). It states that in an NFA, the transition to the next state for an input symbol is non-deterministic, meaning it can be any combination of states, unlike a DFA which transitions to a single state. An NFA is formally defined as a 5-tuple with states, input symbols, transition function, initial state, and final states. The document provides an example NFA and compares NFAs to DFAs. It concludes with practice problems for designing NFAs for different languages.
This document provides an overview of nondeterministic finite automata (NFAs). It begins by explaining how NFAs relax the requirement in deterministic finite automata (DFAs) that there be exactly one transition from each state on each input symbol. An NFA may have multiple possible transitions from a state on a given symbol. The document then discusses how NFAs use nondeterminism and spontaneous transitions to define the languages they accept. It introduces the concept of instantaneous descriptions to formally define how an NFA transitions between configurations and accepts strings. The language an NFA accepts is the set of strings where at least one sequence of transitions reaches an accepting state.
This document discusses rule-based systems and logic programming. It contains the following key points in 3 sentences:
The document introduces rule-based systems that represent knowledge as IF-THEN rules and facts, and describes forward chaining which applies rules to derive new facts from initial facts, and backward chaining which starts with a goal and looks for rules to prove the goal. It explains Horn clause logic and how Prolog implements backward chaining using Horn clauses. It also discusses how forward chaining can be used to dynamically add facts to a knowledge base and apply rules to derive new facts.
This document discusses finite automata and provides definitions and examples. It defines deterministic finite automata (DFA) and nondeterministic finite automata (NFA) and their components. It describes how strings are processed by DFAs using transition functions. Notations for finite automata like transition diagrams and tables are presented. The reasons for nondeterminism and how to convert NFAs to equivalent DFAs are summarized. Examples of finite automata design are provided.
This document discusses theory of computation and finite automata. It begins by defining theory of computation as dealing with the logic of computation using abstract machines called automata. It then defines basic terminology like symbols, alphabets, strings, and languages. Next, it introduces finite automata as the simplest machines that recognize patterns using a finite set of states. Deterministic finite automata and nondeterministic finite automata are described as the two types of finite automata, differing in their transition functions. Transition diagrams and tables are also presented as ways to represent finite automata.
1. Automata theory is the study of abstract machines and the problems they are able to solve. It is closely related to formal language theory as automata are often classified by the formal languages they can recognize.
2. A finite automaton is an abstract machine that consists of a finite number of states. It reads an input string and based on its current state and the next input symbol, transitions to the next state according to its transition function. If it ends in an accepting state, the input is accepted.
3. Deterministic finite automata (DFAs) are a type of finite automaton where the transition function maps each state-symbol pair to a unique next state. DFAs can be represented
This document discusses inference in first-order logic and various proof strategies. It begins by describing a general proof procedure that uses binary resolution and represents proofs as trees. It then discusses different proof strategies like unit preference, set of support strategy, input resolution, linear resolution, and SLD-resolution. SLD-resolution is described as a sound and complete proof procedure for definite clauses. The document also introduces the concepts of non-monotonic reasoning and default reasoning, describing both non-monotonic logic and default logic as approaches to modeling this type of reasoning.
This document provides an overview of the Propositional Calculus. It discusses:
- The language of propositional calculus using atoms, connectives, and well-formed formulas
- Rules of inference like modus ponens, conjunction introduction, and disjunction introduction
- Defining proofs and theorems based on applying rules of inference
- Semantics by associating logical elements with truth values under interpretations
- Important concepts like validity, equivalence, entailment, and the soundness and completeness of rules of inference.
- The propositional satisfiability (PSAT) problem and solving techniques like exhaustive search and GSAT.
Generazione Automatica di Test - S. Vuotto (Università di Sassari)Sardegna Ricerche
Presentazione di Simone Vuotto (Università di Sassari) in occasione della riunione del 7 giugno 2019 sul progetto PROSSIMO - PROgettazione, Sviluppo e ottimizzazione di Sistemi Intelligenti MultiOggetto.
This document provides an overview of topics that will be covered in a course on formal methods in software, including finite state machines, stack machines, specification languages, category theory, logic, and more. It discusses the need for formal methods in safety-critical domains like medical devices and aviation but not for applications like social media. As an example, it walks through a proof of the Euclidean algorithm for finding the greatest common divisor. It also covers important concepts in the field like Gödel's incompleteness theorems, the Entscheidungsproblem, the halting problem, and the Collatz conjecture. Finally, it discusses limitations of formal methods and approaches like unit testing.
The document provides information about a course on the theory of automata. It includes details such as the course title, prerequisites, duration, lectures, laboratories, and topics to be covered. The topics include finite automata, deterministic finite automata, non-deterministic finite automata, regular expressions, properties of regular languages, context-free grammars, pushdown automata, and Turing machines. It also lists reference books and textbooks, and the marking scheme for the course.
The document discusses finite automata and provides examples. It begins by defining a finite automaton as a machine with a finite number of states. It then discusses deterministic finite automata (DFAs) and non-deterministic finite automata (NFAs). The document provides an example of designing a finite automaton to control a toll gate. It also discusses representations of finite automata including state diagrams, transition diagrams, and transition tables.
This document provides an introduction to automata theory and finite automata. It defines an automaton as an abstract computing device that follows a predetermined sequence of operations automatically. A finite automaton has a finite number of states and can be deterministic or non-deterministic. The document outlines the formal definitions and representations of finite automata. It also discusses related concepts like alphabets, strings, languages, and the conversions between non-deterministic and deterministic finite automata. Methods for minimizing deterministic finite automata using Myhill-Nerode theorem and equivalence theorem are also introduced.
This document discusses regular expressions and finite automata. It begins by defining regular expressions over an alphabet and the basic operations of union, concatenation, and Kleene closure. Examples of regular expressions are given for various languages. Thompson's construction is described for converting a regular expression to a finite automaton. Arden's theorem and the equivalence of regular expressions and finite automata are discussed. The document then covers applications of regular expressions, algebraic laws for regular expressions, and ways to prove that languages are not regular. Finally, closure properties of regular languages under operations like union, intersection, and homomorphisms are proved.
The document discusses various concepts related to finite automata. It begins by defining a finite automaton as a mathematical model of a system with discrete inputs and outputs that can be in a finite number of states. A finite automaton consists of a finite set of states and transitions between states based on input symbols. The document then discusses formal languages, the functions of a head pointer and finite control, the two main types of finite automata (DFA and NFA), ways to represent automata, definitions of languages and transitions, regular expressions and languages, two-way finite automata, epsilon closure, equivalence of NFAs and DFAs, Moore and Mealy machines, and applications of finite automata such as lexical analysis.
Undecidability refers to problems that cannot be solved algorithmically. Alan Turing first proved the existence of undecidable problems in 1936. There are decidable problems that can be solved by a Turing machine in finite time, and undecidable problems for which no Turing machine can provide a definitive yes or no answer. Examples of undecidable problems include determining if a context-free grammar is ambiguous or if two context-free languages are equal. Rice's theorem states that any non-trivial semantic property of a language recognized by a Turing machine is undecidable. Undecidability has important implications in language theory and for analyzing programs and computational problems.
The document discusses context-free languages and pushdown automata. It defines context-free grammars and languages, and provides examples of grammars and the strings they generate. It also defines pushdown automata formally as a 6-tuple with states, input alphabet, stack alphabet, transition function, start state, and accept states. Pushdown automata are similar to finite automata but have an additional stack which allows them to recognize some non-regular languages.
The document summarizes a presentation about implementing form-based codes in New England. It discusses challenges and myths around using form-based codes in small New England towns, and provides examples of communities that have successfully adopted form-based codes, including Newport, VT, the Hamilton Canal District in Lowell, MA, and Simsbury, CT. The examples show how these towns used public workshops and consultants to develop regulations tailored to their visions for walkable mixed-use development.
The document is an acknowledgement by an intern thanking Allah for giving them the ability to complete their internship. They also thank their parents for their support, their supervisor Abdul Ahad from the Finance Department of PEL for guiding them, and the staff members who took time to help them learn about finance department processes and dealing with the bank. The intern is grateful for all the support without which they would have faced difficulties during their internship.
The document discusses the benefits of exercise for mental health. Regular physical activity can help reduce anxiety and depression and improve mood and cognitive function. Exercise causes chemical changes in the brain that may help protect against mental illness and improve symptoms.
This document explains the Euler characteristic theorem, which states that for any connected planar graph, the number of vertices (V) minus the number of edges (E) plus the number of faces (F) equals 2. It provides examples of doodling and origami to demonstrate that V - E + F = 2. It also discusses Leonhard Euler's proof of this theorem, building on earlier observations by René Descartes. Examples of the theorem applied to the five Platonic solids are given.
The document discusses what it means to be an Agile Coach. It outlines that an Agile Coach takes a neutral stance and helps teams without imposing direct solutions. The document contrasts the roles of a Scrum Master and Coach, noting a Coach is an outsider who distinguishes between competencies like teaching and mentoring. It also reviews coaching models like StrengthsFinder and Organization & Relationship Systems Coaching which assess strengths without specifying agile practices. Finally, it emphasizes there is no "one-size-fits-all" for coaching and the needs depend on the organization and situation.
The document summarizes a study on using predictive talent analytics to transform youth employment. Over 600 opportunity youth participated in games measuring job-relevant skills. Their scores were compared to current employees' scores in 4 roles. The results debunked myths: 1) Many youth demonstrated skills above average/top performers, showing potential to outperform in entry-level jobs. 2) The youths' skill distributions were similar to the general population, not systematically different. The study provides evidence that talent analytics can unlock access to talented youth by identifying skills beyond traditional qualifications like education. This approach could improve hiring and benefit both youth employment and business needs for entry-level talent.
This document discusses the Lisp programming language. It provides an introduction to Lisp, describes some of its key features like rich arithmetic, generic functions, and macros. It explains that Lisp is well-suited for artificial intelligence programs. The document also gives some examples of Lisp code and applications that use Lisp like Yahoo Store, AutoCAD, and Emacs.
LISP Language, LISP Introduction, List Processing, LISP Syntax, Lisp Comparison Structures, Lisp Applications. Using of LISP language in Artificial Intelligence
The document discusses built-in self-testing (BIST) for testing integrated circuits. BIST uses on-chip pattern generators and response compactors to test circuits without needing expensive external automatic test equipment. It reduces costs associated with test generation, storage, application and diagnosis. The document covers BIST architectures, linear feedback shift registers for pseudo-random pattern generation, response compaction, and fault coverage analysis of BIST.
Dynamic Parameterized Problems - Algorithms and Complexitycseiitgn
In this talk, we will discuss the parameterized complexity of various classical graph-theoretic problems in the dynamic framework where the input graph is being updated by a sequence of edge additions and deletions. We will describe fixed-parameter tractable algorithms and lower bounds on the running time of algorithms for these problems.
Killing Agile Software Development : Presented by Rizky Syaiful oGuild .
Last month (June 2016), I helped a well-known higher education institute in Indonesia. I train the lecturers there, so that their students can practice agile software development.
[I show the audience some photos and videos as the proofs]
Can you imagine a condition when all our CS/IT students already get the real experiences of proper Scrum, Automated Testing, etc?
In that imaginary world, agile software development is already the norm! In the other side, there is no more room for Waterfall’s Big-Design-Up-Front style. Because we know that any software problem is inherently a design problem—or complex problem in Cynefin framework. You can’t solve that kind of problem by designing a big-fixed solution up in the front.
And if almost every software development is already agile—as it was visioned back then in 2001 manifesto, why would we still use ‘agile’ term?
We invent words to categorize things. Before ‘agile’ was proposed in the 2001 manifesto, they called it ‘lightweight’. Because it’s different with the previous heavy weight Waterfall.
Now, when I say the word ‘computer’, what would your brain emulate? A mainframe computer? Or a personal computer? Both of them are literally a computing machine. I put my money on personal computer. Because almost everyone see personal computer in daily basis. And they haven’t seen any mainframe computer once in their life.
Just as the dead of ‘personal’ term, in ‘personal computer’—I don’t count PC because that’s an abbreviation—‘agile’ in ‘agile software development’ will also be dead.
Not because it’s bad. On the contrary, that’s because agility the best option for software development.
In 2026 I, believe, we will call it simply as ‘software development’.
Please help the world to reach that kind of utopia, at least by telling your ex-lecturers, “you should teach agile software development properly”.
We should be so proud for standing here. Being a part of agile software development movement, of the 21st century.
Why?
Because a good movement always has a goal,
this agile software development movement also has a clear end.
The document is a service certificate from DESCON Engineering in Abu Dhabi, UAE for Muhammad Nazir. It certifies that Muhammad Nazir worked as a Rigging Supervisor from June 22, 2008 to December 20, 2014 for a total of 7 years. It states that he was a hard working and obedient employee who proved to be a valued member of DESCON Engineering's project execution team.
fluig Fórum Serviços #2 - Integração do fluig com o ProtheusFluig
Nesta edição discutimos sobre a integração do fluig com o Protheus, e apresentamos o passo a passo e as boas práticas para a troca de informações entre o ERP e a plataforma.
Assista o evento: https://youtu.be/ksEnyXnIoRo
fluig Webinar #9 - Como produzir mais e melhor com os mesmos recursos?Fluig
Mais do que um desafio, essa é uma necessidade para o setor de Construção & Projetos. Por isso, no último dia 14 de abril, o fluig apresentou um webinar especial para o segmento. Conduzido pelo especialista Petrus Evangelista, o webinar foi uma excelente oportunidade para entender como a tecnologia fluida pode levar mais eficiência à gestão de processos das construtoras.
Councils in the West of England Council want people's views on future plans for new homes and transport. This presentation by David Turner at the Bristol Planning and Law Conference provides an overview.
The Deputy Director General (Transport Projects) of Transport for NSW gave this presentation at our 2012 Rail Logistics Workshop.
The information was correct at March 19, 2012.
This document discusses the complexity classes P, NP, and NP-completeness. It begins by explaining why determining if P=NP is important, as it has implications for many practical problems. It then defines the classes P and NP formally and provides examples of problems in each class. It establishes that P is a subset of NP and that NP is a subset of EXP. The document concludes by introducing the concept of NP-completeness and stating the Cook-Levin theorem, which shows that the satisfiability problem (SAT) is NP-complete.
The document discusses the theory of NP-completeness. It begins by classifying problems as solvable, unsolvable, tractable, or intractable. It then defines deterministic and nondeterministic algorithms, and how nondeterministic algorithms can be expressed. The document introduces the complexity classes P and NP. It discusses reducing one problem to another to prove NP-completeness via transitivity. Several classic NP-complete problems are proven to be NP-complete, such as 3SAT, 3-coloring, and subset sum. The document also discusses how to cope with NP-complete problems in practice by sacrificing optimality, generality, or efficiency.
The Russian Doll Search algorithm improves upon the Depth First Branch and Bound algorithm for solving constraint optimization problems. It does this by performing n successive searches on nested subproblems, where n is the number of variables in the problem. Each search solves a subproblem involving a subset of the variables and records the optimal solution. This recorded information is then used to improve the lower bound estimate for partial assignments during subsequent searches on larger subproblems, allowing earlier pruning of search branches. On benchmark problems, this approach yields better results than a standard Depth First Branch and Bound.
This document provides an overview of NP-completeness and polynomial time reductions. It defines the classes P and NP, and explains that the core question is whether P=NP. NP-complete problems are the hardest problems in NP, and to prove a problem is NP-complete it must be shown to be in NP and there must be a polynomial time reduction from a known NP-complete problem like 3-SAT. Examples of NP-complete problems discussed include Clique, Independent Set, and Minesweeper. The document outlines the method for proving a problem is NP-complete using a reduction from 3-SAT.
NP completeness. Classes P and NP are two frequently studied classes of problems in computer science. Class P is the set of all problems that can be solved by a deterministic Turing machine in polynomial time.
UNIT-V.pdf daa unit material 5 th unit pptJyoReddy9
This document outlines topics related to NP-hard and NP-complete problems. It begins by defining optimization and decision problems, and the complexity classes P, NP, and NP-hard. It then discusses non-deterministic algorithms and provides examples. The document also covers Cook's theorem, which states that any NP problem can be converted to the satisfiability problem (SAT) in polynomial time. Finally, it gives examples of NP-hard graph problems like the clique and Hamiltonian cycle problems.
Propositional resolution is a powerful rule of inference for propositional logic that allows building a sound and complete theorem prover. The chapter covers clausal form, which expressions must be converted to for resolution to apply. A simple set of conversion rules is provided. Resolution works by cancelling out literals and their negations from two clauses to infer a new clause. Several examples are worked through. Validity checking and proving entailment using resolution are also discussed.
This document discusses reductions in complexity theory. It begins with definitions of reductions, completeness, and hardness. It then provides examples of NP-complete problems like SAT and 3SAT. The document shows reductions between problems like SAT ≤p 3SAT and Hamiltonian Circuit ≤p TSP. It explains the Cook-Levin theorem that SAT is NP-complete. Overall, the document introduces reductions and uses examples to illustrate how reductions can be used to prove completeness results.
1) NP refers to problems that can be solved by a non-deterministic Turing machine in polynomial time. This includes problems where a potential solution can be verified in polynomial time.
2) Examples of NP-complete problems include the Hamiltonian cycle problem and the traveling salesman problem. These problems are among the hardest problems in NP.
3) It is a major open question whether P=NP, which would mean that NP-complete problems could be solved in polynomial time by a deterministic machine. Most experts believe P≠NP but there is no proof.
Variational inference is a technique for estimating Bayesian models that provides similar precision to MCMC at a greater speed, and is one of the main areas of current research in Bayesian computation. In this introductory talk, we take a look at the theory behind the variational approach and some of the most common methods (e.g. mean field, stochastic, black box). The focus of this talk is the intuition behind variational inference, rather than the mathematical details of the methods. At the end of this talk, you will have a basic grasp of variational Bayes and its limitations.
Graph Methods for Generating Test Cases with Universal and Existential Constr...Sylvain Hallé
We introduce a generalization of the t -way test case generation problem, where parameter t is replaced by a set Φ of Boolean conditions on attribute values. We then present two reductions of this problem to graphs; first, to graph colouring, where we link the the minimal number of tests to the chromatic number of some graph; second, to hypergraph vertex covering. This latter formalization allows us to handle problems with constraints of two kinds: those that must be true for every generated test case, and those that must be true for at least one test case. Experimental results show that the proposed solution produces test suites of slightly smaller sizes than a range of existing tools, while being more general: to the best of our knowledge, our work is the first to allow existential constraints over test cases.
To make Reinforcement Learning Algorithms work in the real-world, one has to get around (what Sutton calls) the "deadly triad": the combination of bootstrapping, function approximation and off-policy evaluation. The first step here is to understand Value Function Vector Space/Geometry and then make one's way into Gradient TD Algorithms (a big breakthrough to overcome the "deadly triad").
The document discusses weighted secure domination in graphs. It begins by defining domination number and weighted domination number. It proposes a greedy algorithm that provides a 1 + log(n) approximation for weighted domination number. The algorithm works by iteratively selecting the unselected vertex with the minimum ratio of weight to number of uncovered neighbors. This achieves an approximation ratio of H(n), which is at most 1 + log(n). The algorithm runs in polynomial time.
This document summarizes key concepts from a lecture on decidability in formal language theory:
- Context-free languages (CFLs) are decidable as their acceptability can be determined by a Turing machine that simulates a pushdown automaton.
- The acceptability problem for context-free grammars (ACFG) - determining if a string is in the language of a given CFG - is decidable using a algorithm that lists all derivations.
- This shows that the class of languages recognized by Turing machines is decidable.
- However, diagonalization arguments show that some problems are undecidable, such as the halting problem of determining if an arbitrary Turing machine
The document discusses Boolean satisfiability (SAT) problems and whether they exhibit genuine phase transitions. It summarizes that while 2-SAT has a proven discontinuous phase transition, the conjectured transition for 3-SAT at α ≈ 4.2 has not been proven. A toy model is presented showing that 3-SAT may not display a real phase transition but only a threshold phenomenon induced by statistics. The model supports investigating quantitative parameters like number of solutions instead of just existence of a solution. The document questions whether k-SAT problems truly exhibit phase transitions or if usage of the term needs clarification.
This document provides information about an upcoming midterm exam and lecture topics related to complexity theory. It discusses:
- The HW and midterm being due next week, with the HW preparing students for the exam.
- Topics from recent and upcoming lectures that will be covered on the midterm, including definitions of P, NP, NP-hard, and NP-complete problems.
- Complexity classes like P and NP and examples of problems in each, such as the complexity of primality testing. Reducibility between problems is also covered.
- Upcoming lecture topics on complexity examples and analyzing exponential time complexity through examples like computing Fibonacci numbers.
This document provides information about an upcoming midterm exam and lecture topics related to complexity theory. It notes that the homework is due next week and is important preparation for the midterm on Tuesday. Today's and parts of Thursday's lecture will be covered in the midterm. Upcoming lectures will focus on definitions of P, NP, NP-hard and NP-complete problems, and examples of complexity classes like polynomial time. The document concludes with examples of reducing problems like 3-SAT to CLIQUE to show NP-completeness.
This document provides an overview of complexity theory, including:
- Asymptotic notation like Big-O, Big-Omega, and Big-Theta for analyzing algorithm runtime.
- Deterministic algorithms that always produce the same output for a given input.
- Non-deterministic algorithms that may produce different outputs for the same input.
- The classes P and NP, where P contains problems solvable in polynomial time and NP contains problems verifiable in polynomial time.
- NP-complete problems, the hardest problems in NP, like 3-Satisfiability and the Hamiltonian Cycle problem.
This document provides an overview of complexity theory concepts including:
- Asymptotic notation like Big-O, Big-Omega, and Big-Theta for analyzing algorithm runtime.
- The difference between deterministic and non-deterministic algorithms, with deterministic algorithms always providing the same output for a given input, and non-deterministic algorithms possibly providing different outputs.
- The classes P and NP, with P containing problems solvable in polynomial time by a deterministic algorithm, and NP containing problems verifiable in polynomial time by a non-deterministic algorithm.
- NP-complete problems being the hardest problems in NP, with examples like the knapsack problem, Hamiltonian path problem, and Boolean satisfiability problem.
Similar to Isolation Lemma for Directed Reachability and NL vs. L (20)
A Quest for Subexponential Time Parameterized Algorithms for Planar-k-Path: F...cseiitgn
The document summarizes a talk on obtaining subexponential time algorithms for NP-hard problems on planar graphs. It discusses using treewidth and tree decompositions to solve problems like 3-coloring in 2O(√n) time on n-vertex planar graphs. It also discusses the exponential time hypothesis and how it implies lower bounds, showing these algorithms are optimal up to constant factors in the exponent. The document outlines several chapters, including using grid minors and bidimensionality to obtain 2O(√k) algorithms for problems like k-path, even for some W[1]-hard problems parameterized by k.
Much of the early work on parameterized complexity considered the solution size as the parameter when parameterizing optimization problems, with a possible exception of treewidth. This talk will survey results and open problems on *alternate parameterizations*, where the parameter is typically some structure of the input or the distance of the output size from a guarantee.
Space-efficient Approximation Scheme for Maximum Matching in Sparse Graphscseiitgn
We present a Logspace Approximation Scheme (LSAS), i.e. an approximation algorithm for maximum matching in planar graphs (not necessarily bipartite) that achieves an approximation ratio arbitrarily close to one, in Logspace This deviates from the well known Baker’s approach for approximation in planar graphs by avoiding the use of distance computation - which is not known to be in Logspace. Our algorithm actually works for any “recursively sparse” graph class which contains a linear size matching.The scheme is based on an LSAS in bounded degree graphs which are not known to be amenable to Baker’s method. We solve the bounded degree case by parallel augmentation of short augmenting paths. Finding a large number of such disjoint paths can, in turn, be reduced to finding a large independent set in a bounded degree graph. This is joint work with Samir Datta and Raghav Kulkarni.
A multiple choice problem consists of a set of color classes P = {C1 , C2 , . . . , Cn }. Each color class Ci consists of a pair of objects typically a pair of points. Objective of such a problem, is to select one object from each color class such that certain optimality criteria is satisfied. One example of such problem is rainbow minmax gap problem(RMGP). In RMGP, given P, the objective is to select exactly one point from each color class, such that the maximum distance between a pair of consecutive selected points is minimized. This problem was studied by Consuegra and Narasimhan. We show that the problem is NP-hard. For our proof we also describe an auxiliary result on satisfiability. A 3-SAT formula is an LSAT formula if each clause (viewed as a set of literals) intersects at most one other clause, and, moreover, if two clauses intersect, then they have exactly one literal in common. We show that the problem of deciding whether an LSAT formula is satisfiable or not is NP-complete. We also briefly describe some approximation results of some multiple choice problems.
The Chasm at Depth Four, and Tensor Rank : Old results, new insightscseiitgn
Agrawal and Vinay [FOCS 2008] showed how any polynomial size arithmetic circuit can be thought of as a depth four arithmetic circuit of subexponential size. The resulting circuit size in this simulation was more carefully analyzed by Koiran [TCS 2012] and subsequently by Tavenas [MFCS 2013]. We provide a simple proof of this chain of results. We then abstract the main ingredient to apply it to formulas and constant depth circuits, and show more structured depth reductions for them.In an apriori surprising result, Raz [STOC 2010] showed that for any $n$ and $d$, such that $\omega(1) \leq d \leq O(logn/loglogn)$, constructing explicit tensors $T: [n] \rightarrow F$ of high enough rank would imply superpolynomial lower bounds for arithmetic formulas over the field F. Using the additional structure we obtain from our proof of the depth reduction for arithmetic formulas, we give a new and arguably simpler proof of this connection. We also extend this result for homogeneous formulas to show that, in fact, the connection holds for any d such that $\omega(1) \leq d \leq n^{o(1)}$. Joint work with Mrinal Kumar, Ramprasad Saptharishi and V Vinay.
Unbounded Error Communication Complexity of XOR Functionscseiitgn
The document discusses unbounded error communication complexity of XOR functions. It presents a main theorem that for any MODm function, where m is expressed as j2k with j odd or 4, the unbounded error protocol complexity of MODm ∘ XOR is Ω(n/jm). The proof outline involves relating complexity to the spectral norm of the communication matrix using Fourier analysis of MODm functions for odd m. An upper bound is also presented along with prior work on characterizing complexity of symmetric XOR functions.
Narrow sieves, representative sets and divide-and-color are three breakthrough techniques related to color coding, which led to the design of extremely fast parameterized algorithms. In this talk, I will discuss the power and limitations of these techniques. I will also briefly address some recent developments related to these techniques, including general schemes for mixing them.
Solving connectivity problems via basic Linear Algebracseiitgn
Directed reachability and undirected connectivity are well studied problems in Complexity Theory. Reachability/Connectivity between distinct pairs of vertices through disjoint paths are well known but hard variations. We talk about recent algorithms to solve variants and restrictions of these problems in the static and dynamic settings by reductions to the determinant.
We study communication cost of computing functions when inputs are distributed among k processors, each of which is located at one vertex of a network/graph called a terminal. Every other node of the network also has a processor, with no input. The communication is point-to-point and the cost is the total number of bits exchanged by the protocol, in the worst case, on all edges. Our results show the effect of topology of the network on the total communication cost. We prove tight bounds for simple functions like Element-Distinctness (ED), which depend on the 1-median of the graph. On the other hand, we show that for a large class of natural functions like Set-Disjointness the communication cost is essentially n times the cost of the optimal Steiner tree connecting the terminals. Further, we show for natural composed functions like ED∘XOR and XOR∘ED, the naive protocols suggested by their definition is optimal for general networks. Interestingly, the bounds for these functions depend on more involved topological parameters that are a combination of Steiner tree and 1-median costs. To obtain our results, we use some tools like metric embeddings and linear programming whose use in the context of communication complexity is novel as far as we know. (Based on joint works with Jaikumar Radhakrishnan and Atri Rudra)
Space-efficient Approximation Scheme for Maximum Matching in Sparse Graphscseiitgn
This document describes a space efficient approximation scheme for maximum matching in sparse graphs. It begins with an introduction to matching problems and Baker's algorithm for approximating problems on planar graphs. It notes that computing distances is difficult in logspace for planar graphs. The document then outlines previous work on matching algorithms and complexity, and states that the goal is to obtain an approximation scheme for maximum matching that runs in logspace.
Efficiently decoding Reed-Muller codes from random errorscseiitgn
"Consider the following setting. Suppose we are given as input a ""corrupted"" truth-table of a polynomial f(x1,..,xm) of degree r = o(√m), with a random set of 1/2 - o(1) fraction of the evaluations flipped. Can the polynomial f be recovered? Turns out we can, and we can do it efficiently! The above question is a demonstration of the reliability of Reed-Muller codes under the random error model. For Reed-Muller codes over F_2, the message is thought of as an m-variate polynomial of degree r, and its encoding is just the evaluation over all of F_2^m.
In this talk, we shall study the resilience of RM codes in the *random error* model. We shall see that under random errors, RM codes can efficiently decode many more errors than its minimum distance. (For example, in the above toy example, minimum distance is about 1/2^{√m} but we can correct close to 1/2-fraction of random errors). This builds on a recent work of [Abbe-Shpilka-Wigderson-2015] who established strong connections between decoding erasures and decoding errors. The main result in this talk would be constructive versions of those connections that yield efficient decoding algorithms. This is joint work with Amir Shpilka and Ben Lee Volk."
Complexity Classes and the Graph Isomorphism Problemcseiitgn
The Graph Isomorphism problem is one of the few problems in NP, but not expected to be NP complete and not known to be in P.In this talk I will review some of the attempts that have been made in order to provide a better classification of the problem in terms of complexity classes reviewing upper and lower bounds and illustrating in this way the utility of several complexity classes.
ISO/IEC 27001, ISO/IEC 42001, and GDPR: Best Practices for Implementation and...PECB
Denis is a dynamic and results-driven Chief Information Officer (CIO) with a distinguished career spanning information systems analysis and technical project management. With a proven track record of spearheading the design and delivery of cutting-edge Information Management solutions, he has consistently elevated business operations, streamlined reporting functions, and maximized process efficiency.
Certified as an ISO/IEC 27001: Information Security Management Systems (ISMS) Lead Implementer, Data Protection Officer, and Cyber Risks Analyst, Denis brings a heightened focus on data security, privacy, and cyber resilience to every endeavor.
His expertise extends across a diverse spectrum of reporting, database, and web development applications, underpinned by an exceptional grasp of data storage and virtualization technologies. His proficiency in application testing, database administration, and data cleansing ensures seamless execution of complex projects.
What sets Denis apart is his comprehensive understanding of Business and Systems Analysis technologies, honed through involvement in all phases of the Software Development Lifecycle (SDLC). From meticulous requirements gathering to precise analysis, innovative design, rigorous development, thorough testing, and successful implementation, he has consistently delivered exceptional results.
Throughout his career, he has taken on multifaceted roles, from leading technical project management teams to owning solutions that drive operational excellence. His conscientious and proactive approach is unwavering, whether he is working independently or collaboratively within a team. His ability to connect with colleagues on a personal level underscores his commitment to fostering a harmonious and productive workplace environment.
Date: May 29, 2024
Tags: Information Security, ISO/IEC 27001, ISO/IEC 42001, Artificial Intelligence, GDPR
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it describes the bony anatomy including the femoral head , acetabulum, labrum . also discusses the capsule , ligaments . muscle that act on the hip joint and the range of motion are outlined. factors affecting hip joint stability and weight transmission through the joint are summarized.
A review of the growth of the Israel Genealogy Research Association Database Collection for the last 12 months. Our collection is now passed the 3 million mark and still growing. See which archives have contributed the most. See the different types of records we have, and which years have had records added. You can also see what we have for the future.
हिंदी वर्णमाला पीपीटी, hindi alphabet PPT presentation, hindi varnamala PPT, Hindi Varnamala pdf, हिंदी स्वर, हिंदी व्यंजन, sikhiye hindi varnmala, dr. mulla adam ali, hindi language and literature, hindi alphabet with drawing, hindi alphabet pdf, hindi varnamala for childrens, hindi language, hindi varnamala practice for kids, https://www.drmullaadamali.com
This presentation was provided by Steph Pollock of The American Psychological Association’s Journals Program, and Damita Snow, of The American Society of Civil Engineers (ASCE), for the initial session of NISO's 2024 Training Series "DEIA in the Scholarly Landscape." Session One: 'Setting Expectations: a DEIA Primer,' was held June 6, 2024.
Physiology and chemistry of skin and pigmentation, hairs, scalp, lips and nail, Cleansing cream, Lotions, Face powders, Face packs, Lipsticks, Bath products, soaps and baby product,
Preparation and standardization of the following : Tonic, Bleaches, Dentifrices and Mouth washes & Tooth Pastes, Cosmetics for Nails.
This presentation includes basic of PCOS their pathology and treatment and also Ayurveda correlation of PCOS and Ayurvedic line of treatment mentioned in classics.
The simplified electron and muon model, Oscillating Spacetime: The Foundation...RitikBhardwaj56
Discover the Simplified Electron and Muon Model: A New Wave-Based Approach to Understanding Particles delves into a groundbreaking theory that presents electrons and muons as rotating soliton waves within oscillating spacetime. Geared towards students, researchers, and science buffs, this book breaks down complex ideas into simple explanations. It covers topics such as electron waves, temporal dynamics, and the implications of this model on particle physics. With clear illustrations and easy-to-follow explanations, readers will gain a new outlook on the universe's fundamental nature.
Introduction to AI for Nonprofits with Tapp NetworkTechSoup
Dive into the world of AI! Experts Jon Hill and Tareq Monaur will guide you through AI's role in enhancing nonprofit websites and basic marketing strategies, making it easy to understand and apply.
A Strategic Approach: GenAI in EducationPeter Windle
Artificial Intelligence (AI) technologies such as Generative AI, Image Generators and Large Language Models have had a dramatic impact on teaching, learning and assessment over the past 18 months. The most immediate threat AI posed was to Academic Integrity with Higher Education Institutes (HEIs) focusing their efforts on combating the use of GenAI in assessment. Guidelines were developed for staff and students, policies put in place too. Innovative educators have forged paths in the use of Generative AI for teaching, learning and assessments leading to pockets of transformation springing up across HEIs, often with little or no top-down guidance, support or direction.
This Gasta posits a strategic approach to integrating AI into HEIs to prepare staff, students and the curriculum for an evolving world and workplace. We will highlight the advantages of working with these technologies beyond the realm of teaching, learning and assessment by considering prompt engineering skills, industry impact, curriculum changes, and the need for staff upskilling. In contrast, not engaging strategically with Generative AI poses risks, including falling behind peers, missed opportunities and failing to ensure our graduates remain employable. The rapid evolution of AI technologies necessitates a proactive and strategic approach if we are to remain relevant.
How to Fix the Import Error in the Odoo 17Celine George
An import error occurs when a program fails to import a module or library, disrupting its execution. In languages like Python, this issue arises when the specified module cannot be found or accessed, hindering the program's functionality. Resolving import errors is crucial for maintaining smooth software operation and uninterrupted development processes.
How to Build a Module in Odoo 17 Using the Scaffold MethodCeline George
Odoo provides an option for creating a module by using a single line command. By using this command the user can make a whole structure of a module. It is very easy for a beginner to make a module. There is no need to make each file manually. This slide will show how to create a module using the scaffold method.
How to Build a Module in Odoo 17 Using the Scaffold Method
Isolation Lemma for Directed Reachability and NL vs. L
1. Isolation Lemma for Directed Reachability and NL vs. L
Nutan Limaye (IIT Bombay)
Joint work with Vaibhav Krishan
Indian National Mathematics Initiative
Workshop on Complexity Theory
Nov 04 - Nov 06, 2016
2. Isolation lemma for NP
SAT
Given a Boolean formula φ determine whether φ has a satisfying
assignment.
3. Isolation lemma for NP
SAT
Given a Boolean formula φ determine whether φ has a satisfying
assignment.
Isolation Procedure for SAT
4. Isolation lemma for NP
SAT
Given a Boolean formula φ determine whether φ has a satisfying
assignment.
Isolation Procedure for SAT
Given: a Boolean forumla φ on n input variables,
5. Isolation lemma for NP
SAT
Given a Boolean formula φ determine whether φ has a satisfying
assignment.
Isolation Procedure for SAT
Given: a Boolean forumla φ on n input variables,
Output: a new formula ψ on the same n variables such that
6. Isolation lemma for NP
SAT
Given a Boolean formula φ determine whether φ has a satisfying
assignment.
Isolation Procedure for SAT
Given: a Boolean forumla φ on n input variables,
Output: a new formula ψ on the same n variables such that
every satisfying assignment of ψ also satisfies φ
7. Isolation lemma for NP
SAT
Given a Boolean formula φ determine whether φ has a satisfying
assignment.
Isolation Procedure for SAT
Given: a Boolean forumla φ on n input variables,
Output: a new formula ψ on the same n variables such that
every satisfying assignment of ψ also satisfies φ
This implies that if φ is not satisfiable then ψ is also not satisfiable.
8. Isolation lemma for NP
SAT
Given a Boolean formula φ determine whether φ has a satisfying
assignment.
Isolation Procedure for SAT
Given: a Boolean forumla φ on n input variables,
Output: a new formula ψ on the same n variables such that
every satisfying assignment of ψ also satisfies φ
This implies that if φ is not satisfiable then ψ is also not satisfiable.
if φ is satisfiable, then ψ has exactly one satisfying assignment.
9. Isolation lemma for NP
SAT
Given a Boolean formula φ determine whether φ has a satisfying
assignment.
Isolation Procedure for SAT
Given: a Boolean forumla φ on n input variables,
Output: a new formula ψ on the same n variables such that
every satisfying assignment of ψ also satisfies φ
This implies that if φ is not satisfiable then ψ is also not satisfiable.
if φ is satisfiable, then ψ has exactly one satisfying assignment.
Valiant Vazirani Isolation Lemma
10. Isolation lemma for NP
SAT
Given a Boolean formula φ determine whether φ has a satisfying
assignment.
Isolation Procedure for SAT
Given: a Boolean forumla φ on n input variables,
Output: a new formula ψ on the same n variables such that
every satisfying assignment of ψ also satisfies φ
This implies that if φ is not satisfiable then ψ is also not satisfiable.
if φ is satisfiable, then ψ has exactly one satisfying assignment.
Valiant Vazirani Isolation Lemma
There is a randomized polynomial time isolation procedure for SAT
with success probability Ω(1
n )
11. Bumping up the success probability
Determinizing Isolation Procedure for SAT
Can one get rid of the randomness in the Isolation Procedure for
SAT?
12. Bumping up the success probability
Determinizing Isolation Procedure for SAT
Can one get rid of the randomness in the Isolation Procedure for
SAT? Open!
Success probability of the Isolation Procedure for SAT
13. Bumping up the success probability
Determinizing Isolation Procedure for SAT
Can one get rid of the randomness in the Isolation Procedure for
SAT? Open!
Success probability of the Isolation Procedure for SAT
Can one make the success probability of the Isolation Procedure
higher?
14. Bumping up the success probability
Determinizing Isolation Procedure for SAT
Can one get rid of the randomness in the Isolation Procedure for
SAT? Open!
Success probability of the Isolation Procedure for SAT
Can one make the success probability of the Isolation Procedure
higher?
The success probability of the Isolation Procedure for SAT can be
made greater than 2/3 if and only if NP ⊆ P/poly.
15. Bumping up the success probability
Determinizing Isolation Procedure for SAT
Can one get rid of the randomness in the Isolation Procedure for
SAT? Open!
Success probability of the Isolation Procedure for SAT
Can one make the success probability of the Isolation Procedure
higher?
The success probability of the Isolation Procedure for SAT can be
made greater than 2/3 if and only if NP ⊆ P/poly.
[DKvMW] Is Valiant Vazinai’s isolation probability improvable? Dell, Kabanets, van
Melkebeek, Watanabe, Computational Complexity, 2013.
17. NL, L, Directed Reachability, L/poly
Complexity classes NL, L, L/poly
L: the class of decision problems decidable by dereministic Turing
machines using O(log n) space, where n is the length of the input.
18. NL, L, Directed Reachability, L/poly
Complexity classes NL, L, L/poly
L: the class of decision problems decidable by dereministic Turing
machines using O(log n) space, where n is the length of the input.
NL: the class of decision problems decidable by non-dereministic
Turing machine using O(log n) space, where n is the length of the
input.
19. NL, L, Directed Reachability, L/poly
Complexity classes NL, L, L/poly
L: the class of decision problems decidable by dereministic Turing
machines using O(log n) space, where n is the length of the input.
NL: the class of decision problems decidable by non-dereministic
Turing machine using O(log n) space, where n is the length of the
input.
L/poly: the class of decision problems decidable by dereministic
Turing machine using O(log n) space and poly(n) amount of advice,
where n is the length of the input.
20. NL, L, Directed Reachability, L/poly
Complexity classes NL, L, L/poly
L: the class of decision problems decidable by dereministic Turing
machines using O(log n) space, where n is the length of the input.
NL: the class of decision problems decidable by non-dereministic
Turing machine using O(log n) space, where n is the length of the
input.
L/poly: the class of decision problems decidable by dereministic
Turing machine using O(log n) space and poly(n) amount of advice,
where n is the length of the input.
Directed Reachability, Reach
Given: A directed graph G = (V , E) and two designated vertices s, t
21. NL, L, Directed Reachability, L/poly
Complexity classes NL, L, L/poly
L: the class of decision problems decidable by dereministic Turing
machines using O(log n) space, where n is the length of the input.
NL: the class of decision problems decidable by non-dereministic
Turing machine using O(log n) space, where n is the length of the
input.
L/poly: the class of decision problems decidable by dereministic
Turing machine using O(log n) space and poly(n) amount of advice,
where n is the length of the input.
Directed Reachability, Reach
Given: A directed graph G = (V , E) and two designated vertices s, t
Output: yes if and only if there is a directed path from s to t in G.
23. Our result
Isolation Procedure for Directed Reachability
Given: a graph G on n input vertices, and two designated vertices s, t
24. Our result
Isolation Procedure for Directed Reachability
Given: a graph G on n input vertices, and two designated vertices s, t
Output: a new graph H on the same n variables such that
25. Our result
Isolation Procedure for Directed Reachability
Given: a graph G on n input vertices, and two designated vertices s, t
Output: a new graph H on the same n variables such that
every s to t path in H is also a path in G
26. Our result
Isolation Procedure for Directed Reachability
Given: a graph G on n input vertices, and two designated vertices s, t
Output: a new graph H on the same n variables such that
every s to t path in H is also a path in G
This implies that in G if t is not reachable from s then in H as well
there is no s to t path.
27. Our result
Isolation Procedure for Directed Reachability
Given: a graph G on n input vertices, and two designated vertices s, t
Output: a new graph H on the same n variables such that
every s to t path in H is also a path in G
This implies that in G if t is not reachable from s then in H as well
there is no s to t path.
if G has an s to t path, then H has exactly one s to t path.
28. Our result
Isolation Procedure for Directed Reachability
Given: a graph G on n input vertices, and two designated vertices s, t
Output: a new graph H on the same n variables such that
every s to t path in H is also a path in G
This implies that in G if t is not reachable from s then in H as well
there is no s to t path.
if G has an s to t path, then H has exactly one s to t path.
Success probability of the Isolation Procedure for Reach
Theorem (Main result)
There exists a randomized isolation procedure for Reach with success
probability greater than 2/3 if and only if NL ⊆ L/poly.
30. Isolation for other classes
Isolation for LogCFL
There exists a randomized isolation procedure for a hard problem in
LogCFL that runs in L/poly with success probability greater than 2/3
if and only if LogCFL ⊆ L/poly.
31. Isolation for other classes
Isolation for LogCFL
There exists a randomized isolation procedure for a hard problem in
LogCFL that runs in L/poly with success probability greater than 2/3
if and only if LogCFL ⊆ L/poly.
Isolation for NP
There exists a randomized isolation procedure for SAT that runs in
L/poly with success probability greater than 2/3 if and only if NP ⊆
L/poly.
33. Proof outline
The proofs follows a similar structure as in [DKvMW]
We will start with some definitions.
34. Proof outline
The proofs follows a similar structure as in [DKvMW]
We will start with some definitions.
Definition (Promise sets for a version of Reach)
35. Proof outline
The proofs follows a similar structure as in [DKvMW]
We will start with some definitions.
Definition (Promise sets for a version of Reach)
YesReach = {(G, s, t) | unique reachable path between s and t},
36. Proof outline
The proofs follows a similar structure as in [DKvMW]
We will start with some definitions.
Definition (Promise sets for a version of Reach)
YesReach = {(G, s, t) | unique reachable path between s and t}, and
NoReach = {(G, s, t) | no path between s and t}
37. Proof outline
The proofs follows a similar structure as in [DKvMW]
We will start with some definitions.
Definition (Promise sets for a version of Reach)
YesReach = {(G, s, t) | unique reachable path between s and t}, and
NoReach = {(G, s, t) | no path between s and t}
Definition (PrUReach)
38. Proof outline
The proofs follows a similar structure as in [DKvMW]
We will start with some definitions.
Definition (Promise sets for a version of Reach)
YesReach = {(G, s, t) | unique reachable path between s and t}, and
NoReach = {(G, s, t) | no path between s and t}
Definition (PrUReach)
Given: G ∈ YesReach ∪ NoReach
39. Proof outline
The proofs follows a similar structure as in [DKvMW]
We will start with some definitions.
Definition (Promise sets for a version of Reach)
YesReach = {(G, s, t) | unique reachable path between s and t}, and
NoReach = {(G, s, t) | no path between s and t}
Definition (PrUReach)
Given: G ∈ YesReach ∪ NoReach
Output: yes if and only if G ∈ YesReach.
41. Proof outline
Recall the statement we wish to prove
Theorem (Main result)
There exists a randomized isolation procedure for Reach with success
probability greater than 2/3 if and only if NL ⊆ L/poly.
42. Proof outline
Recall the statement we wish to prove
Theorem (Main result)
There exists a randomized isolation procedure for Reach with success
probability greater than 2/3 if and only if NL ⊆ L/poly.
Step 1 Prove that NL ⊆ L/poly if and only if PrUReach ∈ L/poly.
43. Proof outline
Recall the statement we wish to prove
Theorem (Main result)
There exists a randomized isolation procedure for Reach with success
probability greater than 2/3 if and only if NL ⊆ L/poly.
Step 1 Prove that NL ⊆ L/poly if and only if PrUReach ∈ L/poly.
Step 2 Prove the following statement:
44. Proof outline
Recall the statement we wish to prove
Theorem (Main result)
There exists a randomized isolation procedure for Reach with success
probability greater than 2/3 if and only if NL ⊆ L/poly.
Step 1 Prove that NL ⊆ L/poly if and only if PrUReach ∈ L/poly.
Step 2 Prove the following statement:
There exists a randomized isolation procedure for Reach with success
probability greater than 2/3 if and only if PrUReach ∈ L/poly.
45. Proof outline
Recall the statement we wish to prove
Theorem (Main result)
There exists a randomized isolation procedure for Reach with success
probability greater than 2/3 if and only if NL ⊆ L/poly.
Step 1 Prove that NL ⊆ L/poly if and only if PrUReach ∈ L/poly.
Step 2 Prove the following statement:
There exists a randomized isolation procedure for Reach with success
probability greater than 2/3 if and only if PrUReach ∈ L/poly.
47. Details of Step 1
NL ⊆ L/poly ⇔ PrUReach ∈ L/poly
⇒ This direction is trivial.
48. Details of Step 1
NL ⊆ L/poly ⇔ PrUReach ∈ L/poly
⇒ This direction is trivial.
⇐ Uses an algorithm developed in the following work.
49. Details of Step 1
NL ⊆ L/poly ⇔ PrUReach ∈ L/poly
⇒ This direction is trivial.
⇐ Uses an algorithm developed in the following work.
[RA] Making Nondeterminism Unambiguous, Reinhardt, Allender, SIAM Journal of
Computing, 2000.
50. Details of Step 1
NL ⊆ L/poly ⇔ PrUReach ∈ L/poly
⇒ This direction is trivial.
⇐ Uses an algorithm developed in the following work.
[RA] Making Nondeterminism Unambiguous, Reinhardt, Allender, SIAM Journal of
Computing, 2000.
We need one more definition.
51. Details of Step 1
NL ⊆ L/poly ⇔ PrUReach ∈ L/poly
⇒ This direction is trivial.
⇐ Uses an algorithm developed in the following work.
[RA] Making Nondeterminism Unambiguous, Reinhardt, Allender, SIAM Journal of
Computing, 2000.
We need one more definition.
Definition (Min-unique graph [GW, RA] )
52. Details of Step 1
NL ⊆ L/poly ⇔ PrUReach ∈ L/poly
⇒ This direction is trivial.
⇐ Uses an algorithm developed in the following work.
[RA] Making Nondeterminism Unambiguous, Reinhardt, Allender, SIAM Journal of
Computing, 2000.
We need one more definition.
Definition (Min-unique graph [GW, RA] )
A weighted directed graph G = (V , E) with weight function w : E → N is said to
be min-unique if between every pair of vertices the minimum weight path is
unique.
54. Breaking down Step 1
Step 1.1: Generating min-unique graph using advice
Given a graph G on n vertices a procedure P1 generates graphs
G1, G2, . . . , Gn2
For all 1 ≤ i ≤ n2
, Gi is on the same set of vertices as G.
55. Breaking down Step 1
Step 1.1: Generating min-unique graph using advice
Given a graph G on n vertices a procedure P1 generates graphs
G1, G2, . . . , Gn2
For all 1 ≤ i ≤ n2
, Gi is on the same set of vertices as G.
G has an s to t path iff ∀i ∈ [n2
], Gi has an s to t path.
56. Breaking down Step 1
Step 1.1: Generating min-unique graph using advice
Given a graph G on n vertices a procedure P1 generates graphs
G1, G2, . . . , Gn2
For all 1 ≤ i ≤ n2
, Gi is on the same set of vertices as G.
G has an s to t path iff ∀i ∈ [n2
], Gi has an s to t path.
If G has an s to t path then ∃i ∈ [n2
] : such that Gi is min-unique.
57. Breaking down Step 1
Step 1.1: Generating min-unique graph using advice
Given a graph G on n vertices a procedure P1 generates graphs
G1, G2, . . . , Gn2
For all 1 ≤ i ≤ n2
, Gi is on the same set of vertices as G.
G has an s to t path iff ∀i ∈ [n2
], Gi has an s to t path.
If G has an s to t path then ∃i ∈ [n2
] : such that Gi is min-unique.
P1 has an L/poly algorithm.
58. Breaking down Step 1
Step 1.1: Generating min-unique graph using advice
Given a graph G on n vertices a procedure P1 generates graphs
G1, G2, . . . , Gn2
For all 1 ≤ i ≤ n2
, Gi is on the same set of vertices as G.
G has an s to t path iff ∀i ∈ [n2
], Gi has an s to t path.
If G has an s to t path then ∃i ∈ [n2
] : such that Gi is min-unique.
P1 has an L/poly algorithm.
P1
advice string
G1, G2, . . . , Gn2
G
59. Breaking down Step 1
Step 1.2: Generating G ∈ YesReach ∪ NoReach given a min-unique G
60. Breaking down Step 1
Step 1.2: Generating G ∈ YesReach ∪ NoReach given a min-unique G
Given a min-unique graph G on n vertices a procedure P2 generates a
graph CG
61. Breaking down Step 1
Step 1.2: Generating G ∈ YesReach ∪ NoReach given a min-unique G
Given a min-unique graph G on n vertices a procedure P2 generates a
graph CG
On input (G, s, t), (CG , s , t ) is produced.
62. Breaking down Step 1
Step 1.2: Generating G ∈ YesReach ∪ NoReach given a min-unique G
Given a min-unique graph G on n vertices a procedure P2 generates a
graph CG
On input (G, s, t), (CG , s , t ) is produced.
G has an s to t path if and only if CG has an s to t path.
63. Breaking down Step 1
Step 1.2: Generating G ∈ YesReach ∪ NoReach given a min-unique G
Given a min-unique graph G on n vertices a procedure P2 generates a
graph CG
On input (G, s, t), (CG , s , t ) is produced.
G has an s to t path if and only if CG has an s to t path.
If G is min-unique and has an s to t path then there is a unique path
from s to t .
64. Breaking down Step 1
Step 1.2: Generating G ∈ YesReach ∪ NoReach given a min-unique G
Given a min-unique graph G on n vertices a procedure P2 generates a
graph CG
On input (G, s, t), (CG , s , t ) is produced.
G has an s to t path if and only if CG has an s to t path.
If G is min-unique and has an s to t path then there is a unique path
from s to t .
P2 has an L/poly algorithm.
65. Breaking down Step 1
Step 1.2: Generating G ∈ YesReach ∪ NoReach given a min-unique G
Given a min-unique graph G on n vertices a procedure P2 generates a
graph CG
On input (G, s, t), (CG , s , t ) is produced.
G has an s to t path if and only if CG has an s to t path.
If G is min-unique and has an s to t path then there is a unique path
from s to t .
P2 has an L/poly algorithm.
P2
advice string
(CG , s , t )
(G, s, t)
67. Breaking down Step 1
Step 1.3: Using P1, P2 to solve Reach.
P be the algorithm that solves PrUReach in L/poly.
68. Breaking down Step 1
Step 1.3: Using P1, P2 to solve Reach.
P be the algorithm that solves PrUReach in L/poly.
G P1
G1
G2
P2 CG1
P2 CG2
...
...
...
Gn2 P2 CGn2
P
Yes iff P ac-
cepts one of
the graphs
69. Breaking down Step 1
Step 1.3: Using P1, P2 to solve Reach.
P be the algorithm that solves PrUReach in L/poly.
G P1
G1
G2
P2 CG1
P2 CG2
...
...
...
Gn2 P2 CGn2
P
Yes iff P ac-
cepts one of
the graphs
If G does not have an s to t path, we reject.
70. Breaking down Step 1
Step 1.3: Using P1, P2 to solve Reach.
P be the algorithm that solves PrUReach in L/poly.
G P1
G1
G2
P2 CG1
P2 CG2
...
...
...
Gn2 P2 CGn2
P
Yes iff P ac-
cepts one of
the graphs
If G does not have an s to t path, we reject.
If G has an s to t path,
71. Breaking down Step 1
Step 1.3: Using P1, P2 to solve Reach.
P be the algorithm that solves PrUReach in L/poly.
G P1
G1
G2
P2 CG1
P2 CG2
...
...
...
Gn2 P2 CGn2
P
Yes iff P ac-
cepts one of
the graphs
If G does not have an s to t path, we reject.
If G has an s to t path,
at least one of the Gi is min-unique.
72. Breaking down Step 1
Step 1.3: Using P1, P2 to solve Reach.
P be the algorithm that solves PrUReach in L/poly.
G P1
G1
G2
P2 CG1
P2 CG2
...
...
...
Gn2 P2 CGn2
P
Yes iff P ac-
cepts one of
the graphs
If G does not have an s to t path, we reject.
If G has an s to t path,
at least one of the Gi is min-unique.
The corresponding CGi
∈ YesReach.
73. Details about Step 1.2
Step 1.2: Generating G ∈ YesReach ∪ NoReach given a min-unique G
74. Details about Step 1.2
Step 1.2: Generating G ∈ YesReach ∪ NoReach given a min-unique G
Given a min-unique graph G on n vertices
On input (G, s, t), (CG , s , t ) is produced.
G has an s to t path if and only if CG has an s to t path.
75. Details about Step 1.2
Step 1.2: Generating G ∈ YesReach ∪ NoReach given a min-unique G
Given a min-unique graph G on n vertices
On input (G, s, t), (CG , s , t ) is produced.
G has an s to t path if and only if CG has an s to t path.
If G is min-unique then there is a unique path from s to t .
76. Details about Step 1.2
Step 1.2: Generating G ∈ YesReach ∪ NoReach given a min-unique G
Given a min-unique graph G on n vertices
On input (G, s, t), (CG , s , t ) is produced.
G has an s to t path if and only if CG has an s to t path.
If G is min-unique then there is a unique path from s to t .
[RA] If G is min-unqiue then there is a UL algorithm that decides the
reachability in G.
77. Details about Step 1.2
Step 1.2: Generating G ∈ YesReach ∪ NoReach given a min-unique G
Given a min-unique graph G on n vertices
On input (G, s, t), (CG , s , t ) is produced.
G has an s to t path if and only if CG has an s to t path.
If G is min-unique then there is a unique path from s to t .
[RA] If G is min-unqiue then there is a UL algorithm that decides the
reachability in G.
CG is the configuration graph of the UL algorithm on input G.
78. Details about Step 1.2
Step 1.2: Generating G ∈ YesReach ∪ NoReach given a min-unique G
Given a min-unique graph G on n vertices
On input (G, s, t), (CG , s , t ) is produced.
G has an s to t path if and only if CG has an s to t path.
If G is min-unique then there is a unique path from s to t .
[RA] If G is min-unqiue then there is a UL algorithm that decides the
reachability in G.
CG is the configuration graph of the UL algorithm on input G.
CG can be computed in L.
80. Proof outline
Recall the statement we wish to prove
Theorem (Main result)
There exists a randomized isolation procedure for Reach with success
probability greater than 2/3 if and only if NL ⊆ L/poly.
81. Proof outline
Recall the statement we wish to prove
Theorem (Main result)
There exists a randomized isolation procedure for Reach with success
probability greater than 2/3 if and only if NL ⊆ L/poly.
Step 1 Prove that NL ⊆ L/poly if and only if PrUReach ∈ L/poly.
82. Proof outline
Recall the statement we wish to prove
Theorem (Main result)
There exists a randomized isolation procedure for Reach with success
probability greater than 2/3 if and only if NL ⊆ L/poly.
Step 1 Prove that NL ⊆ L/poly if and only if PrUReach ∈ L/poly.
Step 2 Prove the following statement:
83. Proof outline
Recall the statement we wish to prove
Theorem (Main result)
There exists a randomized isolation procedure for Reach with success
probability greater than 2/3 if and only if NL ⊆ L/poly.
Step 1 Prove that NL ⊆ L/poly if and only if PrUReach ∈ L/poly.
Step 2 Prove the following statement:
There exists a randomized isolation procedure for Reach with success
probability greater than 2/3 if and only if PrUReach ∈ L/poly.
84. Proof outline
Recall the statement we wish to prove
Theorem (Main result)
There exists a randomized isolation procedure for Reach with success
probability greater than 2/3 if and only if NL ⊆ L/poly.
Step 1 Prove that NL ⊆ L/poly if and only if PrUReach ∈ L/poly.
Step 2 Prove the following statement:
There exists a randomized isolation procedure for Reach with success
probability greater than 2/3 if and only if PrUReach ∈ L/poly.
85. Details about Step 2
From the hypothesis we can show that there is an L/poly procedure,
say B s.t.
86. Details about Step 2
From the hypothesis we can show that there is an L/poly procedure,
say B s.t.
Given a graph G as input, it outputs G1, G2, . . . , Gt such that
> 2/3 fraction of the Gi s have unique s to t paths.
87. Details about Step 2
From the hypothesis we can show that there is an L/poly procedure,
say B s.t.
Given a graph G as input, it outputs G1, G2, . . . , Gt such that
> 2/3 fraction of the Gi s have unique s to t paths.
B
advice string
G1, G2, . . . , Gt
G
88. Details about Step 2
From the hypothesis we can show that there is an L/poly procedure,
say B s.t.
Given a graph G as input, it outputs G1, G2, . . . , Gt such that
> 2/3 fraction of the Gi s have unique s to t paths.
B
advice string
G1, G2, . . . , Gt
G
H be a graph with π as its s to t path.
89. Details about Step 2
From the hypothesis we can show that there is an L/poly procedure,
say B s.t.
Given a graph G as input, it outputs G1, G2, . . . , Gt such that
> 2/3 fraction of the Gi s have unique s to t paths.
B
advice string
G1, G2, . . . , Gt
G
H be a graph with π as its s to t path.
For two graph G, H we say that (G, H) is good if π is a reachable
path in < 2/3 fraction of graphs in B(G + H).
90. Details about Step 2
From the hypothesis we can show that there is an L/poly procedure,
say B s.t.
Given a graph G as input, it outputs G1, G2, . . . , Gt such that
> 2/3 fraction of the Gi s have unique s to t paths.
B
advice string
G1, G2, . . . , Gt
G
H be a graph with π as its s to t path.
For two graph G, H we say that (G, H) is good if π is a reachable
path in < 2/3 fraction of graphs in B(G + H).
Let B(G + H) = G1, G2, . . . , Gt .
92. Details about Step 2
Properties of a good pair (G, H)
If (G, H) is good then G ∈ YesReach.
93. Details about Step 2
Properties of a good pair (G, H)
If (G, H) is good then G ∈ YesReach.
If (G, H) good then there is a ρ such that ρ = π
94. Details about Step 2
Properties of a good pair (G, H)
If (G, H) is good then G ∈ YesReach.
If (G, H) good then there is a ρ such that ρ = π and ρ is a unique
reachable path in some Gi
95. Details about Step 2
Properties of a good pair (G, H)
If (G, H) is good then G ∈ YesReach.
If (G, H) good then there is a ρ such that ρ = π and ρ is a unique
reachable path in some Gi , that ρ is a reachable path in G.
96. Details about Step 2
Properties of a good pair (G, H)
If (G, H) is good then G ∈ YesReach.
If (G, H) good then there is a ρ such that ρ = π and ρ is a unique
reachable path in some Gi , that ρ is a reachable path in G. Therefore
G ∈ YesReach.
97. Details about Step 2
Properties of a good pair (G, H)
If (G, H) is good then G ∈ YesReach.
If (G, H) good then there is a ρ such that ρ = π and ρ is a unique
reachable path in some Gi , that ρ is a reachable path in G. Therefore
G ∈ YesReach.
If G, H are both in YesReach then either (G, H) or (H, G) is good.
Let π, ρ be unique s to t paths in H, G, respectively.
98. Details about Step 2
Properties of a good pair (G, H)
If (G, H) is good then G ∈ YesReach.
If (G, H) good then there is a ρ such that ρ = π and ρ is a unique
reachable path in some Gi , that ρ is a reachable path in G. Therefore
G ∈ YesReach.
If G, H are both in YesReach then either (G, H) or (H, G) is good.
Let π, ρ be unique s to t paths in H, G, respectively. (π = ρ).
99. Details about Step 2
Properties of a good pair (G, H)
If (G, H) is good then G ∈ YesReach.
If (G, H) good then there is a ρ such that ρ = π and ρ is a unique
reachable path in some Gi , that ρ is a reachable path in G. Therefore
G ∈ YesReach.
If G, H are both in YesReach then either (G, H) or (H, G) is good.
Let π, ρ be unique s to t paths in H, G, respectively. (π = ρ).
If neither good, then each π and ρ are reachable paths in 2/3 of the
Gi s.
100. Details about Step 2
Properties of a good pair (G, H)
If (G, H) is good then G ∈ YesReach.
If (G, H) good then there is a ρ such that ρ = π and ρ is a unique
reachable path in some Gi , that ρ is a reachable path in G. Therefore
G ∈ YesReach.
If G, H are both in YesReach then either (G, H) or (H, G) is good.
Let π, ρ be unique s to t paths in H, G, respectively. (π = ρ).
If neither good, then each π and ρ are reachable paths in 2/3 of the
Gi s.
This means > 1/3 of Gi s have two distinct s to t paths.
101. Details about Step 2
Properties of a good pair (G, H)
If (G, H) is good then G ∈ YesReach.
If (G, H) good then there is a ρ such that ρ = π and ρ is a unique
reachable path in some Gi , that ρ is a reachable path in G. Therefore
G ∈ YesReach.
If G, H are both in YesReach then either (G, H) or (H, G) is good.
Let π, ρ be unique s to t paths in H, G, respectively. (π = ρ).
If neither good, then each π and ρ are reachable paths in 2/3 of the
Gi s.
This means > 1/3 of Gi s have two distinct s to t paths.
This contradicts the hypothesis of B.
102. Details about Step 2
Properties of a good pair (G, H)
If (G, H) is good then G ∈ YesReach.
If (G, H) good then there is a ρ such that ρ = π and ρ is a unique
reachable path in some Gi , that ρ is a reachable path in G. Therefore
G ∈ YesReach.
If G, H are both in YesReach then either (G, H) or (H, G) is good.
Let π, ρ be unique s to t paths in H, G, respectively. (π = ρ).
If neither good, then each π and ρ are reachable paths in 2/3 of the
Gi s.
This means > 1/3 of Gi s have two distinct s to t paths.
This contradicts the hypothesis of B.
Given H, π as advice and G as input, whether (G, H) is good or not
can be decided in L/poly.
104. Wrap-up
Design the advice strings
As advice we need (H1, π1), (H2, π2), . . . , (H , π ).
The advice ensures that
105. Wrap-up
Design the advice strings
As advice we need (H1, π1), (H2, π2), . . . , (H , π ).
The advice ensures thatif G ∈ YesReach then there is an Hi such that
Hi ∈ YesReach and πi is corresponding path.
106. Wrap-up
Design the advice strings
As advice we need (H1, π1), (H2, π2), . . . , (H , π ).
The advice ensures thatif G ∈ YesReach then there is an Hi such that
Hi ∈ YesReach and πi is corresponding path.
If G ∈ NoReach, then each Hi ∈ NoReach.
107. Wrap-up
Design the advice strings
As advice we need (H1, π1), (H2, π2), . . . , (H , π ).
The advice ensures thatif G ∈ YesReach then there is an Hi such that
Hi ∈ YesReach and πi is corresponding path.
If G ∈ NoReach, then each Hi ∈ NoReach.
Putting it together
Overall, this gives a L/poly algorithm for PrUReach.