Pwl rewal-slideshare

Pwl rewal-slideshare
Ineluctable modality of the distributed On Joseph Halpern’s work on knowledge in distributed systems Peter Alvaro UC Berkeley
choose-your-own-adventure talk
Last time at PWL… •  The agreement problem(s) •  Impossibility results •  A “weakest” failure detector Today: knowledge
It’s not just for byzantine stuff I'm not a great fool, so I can clearly not choose the wine in front of you. But you must have known I was not a great fool; you would have counted on it, so I can clearly not choose the wine in front of me.
Why you should care A correct distributed program achieves (nontrivial) distributed property X. Some tricky questions before we start coding: 1.  Is X even attainable? 2.  Cheapest protocol that gets me X? 3.  How should I implement it?
A strong claim about distributed correctness properties Uncertainty is what makes reasoning about distributed systems difficult. Uncertainty is the abundance of possibilities. Knowledge is the dual of possibility
A strong statement about protocols How: Protocols just describe what actions to take based on local knowledge. Why: Protocols are just mechanisms to ensure that a group has shared knowledge of a fact.
A good paper about bridging the gap between properties and protocols
For example •  Commit protocols – each agent knows the commit/abort decision AND knows that all agents know the decision •  Distributed garbage collection – an agent knows that no remote references exist to a particular object, and that all other agents know
For example •  When the leader has received phase 2b messages for value v and ballot bal from a majority of the acceptors, it knows that the value v has been chosen. [paxos] •  a process takes a checkpoint when it knows that all processes on which it computationally depends took their checkpoints [An Efficient Protocol for Checkpointing Recovery in Distributed Systems, Kim and Park] •  and therefore a cohort with a later viewstamp for some view knows everything known to a cohort with an earlier viewstamp for that view. [viewstamped replication] •  Since each member of Si serves as an arbitrator, the requesting node knows that it is the only node that has been granted mutual exclusion [A sqrt(N) Algorithm for Mutual Exclusion in Decentralized Systems, Maekawa]
Warmup: RPC protocols Hi! Alice Bob
Warmup: RPC protocols Hi! Alice Bob Issue: uncertainty! Uncertain environment è Uncertain outcomes
Warmup: RPC protocols Alice Bob Issue: uncertainty! Uncertain environment è Uncertain outcomes
Warmup: RPC protocols Hi! Retry Alice Bob
Warmup: RPC protocols Hi! Issues: infinite (sender) behavior & state, at-least-once delivery Retry Alice Bob
Warmup: RPC protocols Hi! Retry with ACKS Hi! Alice Bob
Warmup: RPC protocols Hi! Retry with ACKS Hi!Hi! Alice Bob Hi!
Warmup: RPC protocols Hi! Hi yourself Retry with ACKS Hi! Issues: at-least once delivery Hi! Alice Bob Hi!
Warmup: RPC protocols Hi! Hi yourself Retry with ACKS Hi! Issues: at-least once delivery Hi! Alice Bob
Warmup: RPC protocols Retry with ACKS Issues: at-least once delivery Alice Bob Hi!
a good paper about principled distributed GC
Warmup: RPC protocols Hi! Issues: infinite receiver state Receiver buffers, dedups Alice Bob
Warmup: RPC protocols Issues: infinite receiver state Hi! Receiver buffers, dedups Alice Bob
Warmup: RPC protocols Hi! ACK-ACKing Hi! Alice Bob
Warmup: RPC protocols Hi! Hi yourself ACK-ACKing Hi! Issue: uncertainty Alice Bob
Warmup: RPC protocols Hi! Hi yourself ACK-ACKing Hi! Alice Bob
Warmup: RPC protocols ACK-ACKing Hi! Alice Bob Ahoy
Warmup: RPC protocols ACK-ACKing Hi! Alice Bob Ahoy
Warmup: RPC protocols ACK-ACKing Alice Bob
Warmup: RPC protocols ACK-ACKing Issue: uncertainty Alice Bob
Warmup: RPC protocols Issues: infinite hot potato Alice Bob
what does this remind me of? Refresher: the two generals problem
Logic time
(propositional) logic ϕ ϕ if ϕ is atomic ϕ ∧ ψ true if both ϕ and ψ are true ¬ϕ true if ϕ is false Sweet duality: ϕ ∨ ψ = ¬(¬ϕ ∧ ¬ψ) ϕ ⇒ ψ= ¬(ϕ ∧ ¬ψ) q ⇒ p p = “the write is stable” q = “the write is acknowledged”
modality, duality ∃xϕ === ¬∀x ¬ϕ ¯ϕ === ¬£¬ϕ Symbol Temporal Deon/c Epistemic ¯ Some8mes Is permi:ed Is possible £ Always Is obligatory Is known Knowledge is the dual of possibility
Epistemic modal logic ϕ = “the write is stable” Kaliceϕ = “alice knows ϕ” KaliceKbobϕ = “alice knows bob knows ϕ” KaliceKbobKcarolϕ = “alice knows bob knows carol knows ϕ” […]
Epistemic modal logic ϕ = “the write is stable” Eϕ = “everyone* knows ϕ” EEϕ = “everyone knows everyone knows ϕ” […] A driver will not feel safe going when he sees a green light unless he knows that everyone else knows and follows the rules.
Common knowledge ϕ = “the write is stable” Eϕ = “everyone* knows ϕ” EEϕ = “everyone knows everyone knows ϕ” […] Eiϕ = “(everyone knows * i) ϕ” Cϕ = E∞ϕ = “it is common knowledge that ϕ”
Distributed knowledge ϕ = “the write is stable” Dϕ = “ϕ is implicitly known by the group” Sϕ = “someone knows ϕ”
Protocols climb the hierarchy Cϕ […] Ek+1ϕ […] Eϕ Sϕ Dϕ ϕ
Protocols climb the hierarchy Cϕ […] Ek+1ϕ […] Eϕ Sϕ Dϕ ϕ Deadlock detection ϕ is distributed knowledge Someone knows ϕ
Protocols climb the hierarchy Cϕ […] Ek+1ϕ […] Eϕ Sϕ Dϕ ϕ Reliable broadcast Someone knows ϕ ϕ is distributed knowledge Everyone knows ϕ
Protocols climb the hierarchy Cϕ […] E3ϕ E2ϕ Eϕ Sϕ Dϕ ϕ Uniform Reliable broadcast Someone knows ϕ ϕ is distributed knowledge Everyone knows ϕ Everyone knows everyone knows ϕ
Protocols climb the hierarchy Cϕ […] E3ϕ E2ϕ Eϕ Sϕ Dϕ ϕ Someone knows ϕ ϕ is distributed knowledge Everyone knows ϕ Everyone knows everyone knows ϕ Some crazy BFT protocol (Everyone knows)k ϕ
Protocols climb the hierarchy Cϕ […] E3ϕ E2ϕ Eϕ Sϕ Dϕ ϕ Knowledge Highway E10ϕ 10 E100ϕ 100 Cϕ ∞
Applications of knowledge A correct distributed program achieves (nontrivial) distributed property X. Some tricky questions before we start coding: 1.  Is X even attainable? 2.  Cheapest protocol that gets me X? 3.  How should I implement it?
Applications: impossibility “in a system in which communication is not guaranteed, common knowledge of initially-undetermined facts is not attainable in any run of any protocol.” Corollary: the 2 generals problem is unsolvable
Let’s use knowledge to prove it! But first… lots of formalism to get through L
Road map for the proof: 1.  Semantics of modal logic 2.  Distributed system model 3.  A quick and easy lemma 4.  Big theorem: Common knowledge is not attainable via protocol 5.  Lemma 2: if the generals attack, they have common knowledge of the attack. 6.  Corollary: 2 generals is unsolvable
Semantics
Semantics: structures Formulae are well-formed, meaningless strings of symbols Structures give meaning to formulae (in the very narrow sense of making them all either true or false) S |= ϕ
Semantics: propositional structures Propositional formula: S |= p ∧ q Need: 1.  a map S from variable names to T/F 2.  rules; e.g. S |= ϕ ∧ ψ iff S |= ϕ and S |= ψ
Semantics: first-order structures First-order formula: S |= ∀x, dog(x) ⇒ big(x) ∧ likes(x, me) Need: 1.  S assigns “records” to dog, big and likes. 2.  Rules; e.g. S |= ∀xφ iff for all d ∈ |S|, S[x := d] |= φ
Semantics: first-order structures •  First-order logic: S |= ∀x, dog(x) ⇒ big(x) ∧ likes(x, me) dog Rex Fido Rover big Rex Fido me likes Rex me Fido me Rover me me me
couple good papers about using FO logic to program distributed systems
Semantics – modal logic S |= (£¬p) ∧ (q ⇒ ¯r) Need: a structure that can interpret the propositional formulae under different modalities Kripke structure: (W, π, R) •  W is a set of worlds •  For each element of W, π is a propositional structure •  R is an accessibility relation among elements of W S1 S3
Semantics – modal logic Temporal logic S |= (£¬p) ∧ (q ⇒ ¯r) q r r q S1 S3 S2 Kripke structure: (W, π, R)
Semantics – modal logic Epistemic logic S |= r ∧ ¬Kir ∧ Ki(Kjr or Kj¬r) ∧ Kjr ∧ ¬Kj¬Kir q r r q S1 S3 S2 i j Kripke structure: (W, π, Ri)
a model of distributed systems (r,t) p1 p2 p3 p4 Idealized time }h(p4,r,t) A run r ∈ R
Knowledge-based interpretations Knowledge interpretation: I = (R, π, {v1,v2,[..]}) Knowledge point: (I, r, t) R – a set of runs π – assigns a truth assignment to propositions for each point in R vi – A view function for R for some agent i (determined by h) Kripke structure: (W, π, R)
Truth in a knowledge interpretation (I,r,t) |= φ iff π(r,t)(φ) = true (If φ is a ground formula) (I,r,t) |= ¬φ iff (I,r,t) |= φ (I,r,t) |= φ ∧ ψ iff (I,r,t) |= φ and (I,r,t) |= ψ (I,r,t) |= Kiφ iff (I,r’,t’) |= φ for all (r’,t’) in R satisfying v(pi,r,t) = v(pi,r’,t’) (I,r,t) |= Eφ iff (I,r’,t’) |= Kiφ for all pi (I,r,t) |= Cφ iff (I,r’,t’) |= Ekφ for all k
choose-your-own-adventure •  If you’d like to gloss over the proof and skip to other applications of knowledge, turn to page 62 •  If you’d like to dive into the weeds, turn to page 54.
Truth in a knowledge interpretation (I,r,t) |= Cφ iff (I,r’,t’) |= Ekφ for all k Fixed point axiom: Cφ = E(φ ∧ Cφ) Induction rule: From φ ⇒ E(φ ∧ ψ) infer φ ⇒ Cψ
communication is not guaranteed NG1: For all runs r and times t, there exists a run r’ extending (r,t) such that […] no messages are received in r’ at or after time t. NG2: If in run r processor pi does not receive any messages in the interval (t’,t), then there is a run r’ extending (r,t’) such that […] h(pi,r,t’’) = h(pi,r’,t’’) for all t’’ < t, and no processor pj != pi receives a message in r’ in the interval (t’,t).
Lemma 1 If, in two different runs (r and r’) of the same protocol, some h(p, r, t) = h(p, r’, t), then (I, r, t) |= Cφ iff (I, r’, t) |= Cφ Sorry, no proof today!
Common knowledge is not attainable in a system in which communication is not guaranteed Take runs r and r- in R, with the same initial configuration, s.t. no messages are received in r- up till time t. Then (I,r,t) |= Cφ iff (I,r-,t) |= Cφ. Proof (by induction on d(r)*): •  Base case: d(r)=0. h(p1,r,t) = h(p1,r-,t). By Lemma 1, (I,r,t) |= Cφ iff (I,r-,t) |= Cφ. * d(r) is the number of messages received in run r.
Common knowledge is not attainable in a system in which communication is not guaranteed Inductive case: d(r) = k+1. Let: •  t’ < t -- the latest time a message is received in r before t. •  pj -- a processor that received a message at t’ •  pi –a processor (!= pj) By NG2, there is a run r’ extending (r,t’) s.t. h(pi,r,t’’)=h(pi,r’,t’’) for all t’’ <= t, and all processors (besides pi) receive no messages in the interval (t’, t). By construction, d(r’) <= k, so by the IH (I,r’,t) |= Cφ iff (I,r-,t) |= Cφ. But since h(pi,r,t) = h(pi,r’,t), by Lemma 1 (I,r’,t) |= Cφ iff (I,r,t) |= Cφ. So (I,r,t) |= Cφ iff (I,r-,t) |= Cφ. QED
Common knowledge is not attainable in a system in which communication is not guaranteed Review: we showed that common knowledge cannot be gained (or lost) by exchanging messages. Corollary: the 2 generals will never attack. But we still need to prove one more lemma: Any correct protocol for coordinated attack has the property that whenever the generals attack, it is common knowledge that they are attacking.
Lemma 2: coordinated attack requires common knowledge Let ψ = the generals are attacking Assume the generals (A and B) attack at (r*, t*) – we show that (I,r*,t*) |= Cψ. Pick an arbitrary point (r,t). We show ψ ⇒ Eψ is valid in R. •  If (I,r,t) |= ψ, then the generals attack at (r,t). Consider (r’,t’), in which A has the same history at (r,t). Since the protocol is deterministic (assumption), A must also attack in (r’,t’); since the protocol is correct, B does also, and so (I,r’,t’) |= ψ. It follows that (I,r,t) |= Eψ, so ψ ⇒ Eψ is valid in R. •  If (I,r,t) |= ¬ψ, then trivially ψ ⇒ Eψ is valid in R. By the induction rule, ψ ⇒ Cψ is valid in R
Coup de grace ψ = the generals are attacking 1.  By assumption, Cψ does not hold if no messages are exchanged. 2.  By theorem 1, Cψ will never hold. 3.  By lemma 2, the generals cannot attack unless Cψ.
Phew. but…? Common knowledge is a prerequisite for agreement. Common knowledge is not attainable via protocol.
Halpern: These results may seem paradoxical.
Reality check Fragile assumptions on which the proofs rest: •  Deterministic protocol •  Simultaneous agreement is necessary •  “Communication not guaranteed” •  Lack of useful a priori common knowledge
Bootstrapping common knowledge •  The ``weakest failure detector’’ •  Spanner’s global clock •  Sequence wraparound
lower bounds for protocols [Hadzilacos, PODS’87]: A knowledge-theoretic analysis of atomic commitment protocols 1.  All of the variants of 2pc ((de-)centralized, linear/nested, etc) are identical from a knowledge perspective 2.  All 2PC variants attain the minimum level of knowledge needed to commit 3.  3PC attains the minimum needed to commit without blocking 4.  Lower bound for messages: nested 2PC.
A good paper about automatically choosing cheap coordination mechanisms
protocol implementation / synthesis •  Halpern and Fagin: knowledge-based programming [PODC’95] case of K(Msg) and (KE(AckedMsg)) do deliver(Msg) K(Msg) and !KE(AckedMsg) do relay(Msg) end •  Matteo interlandi [Datalog2.0’11]: Knowlog: knowledge-enriched Dedalus log(Tx_id,"abort")@next :-‐ Dvote(Vote,Tx_id),Vote=="no", par8cipants(X),transac8on(Tx_id,State),State=="vote-‐req".
A good paper about Dedalus
Monotonicity and knowledge Monotonic: the more you know, the more you know. Cϕ […] E3ϕ E2ϕ Eϕ Sϕ Dϕ ϕ
A good paper about monotonicity and distributed consistency
Remember •  Knowledge is the dual of possibility •  Local knowledge dictates protocol behavior •  The purpose of protocols is obtaining a particular level of distributed knowledge •  Deep connections between semantic structures and system behavior •  Common knowledge is unattainable via protocol (but there is still hope)
Protocols climb the hierarchy Cϕ […] E3ϕ E2ϕ Eϕ Sϕ Dϕ ϕ Knowledge Highway E10ϕ 10 E100ϕ 100 Cϕ ∞

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