利用者:Shn:下書き:Paxos
あきらめ気味
Plaxoアルゴリズムは、信頼できないプロセッサの間で合意を形成するためのアルゴリズムである。 合意とは、参加者の間で1つの結果に同意する事である。 これは、参加者や参加者間の通信に障害があるとき問題になる。[1]
Paxos is a family of protocols for solving consensus in a network of unreliable processors. Consensus is the process of agreeing on one result among a group of participants. This problem becomes difficult when the participants or their communication medium may experience failures.[1]
合意プロトコルは分散コンピューティングのための状態機械複製？(state machine approach)の基礎である。
Consensus protocols are the basis for the state machine approach to distributed computing, as suggested by Leslie Lamport[2] and surveyed by Fred Schneider[1].
The state machine approach is a technique for converting an algorithm into a fault-tolerant, distributed implementation. Ad-hoc techniques may leave important cases of failures unresolved. The principled approach proposed by Lamport et. al. ensures all cases are handled safely.
The Paxos family of protocols includes a spectrum of tradeoffs between the number of processors, number of message delays before learning the agreed value, the activity level of individual participants, number of messages sent, and types of failures. The convergent property of the Paxos family is their safety from inconsistency. [3][4][5][6][7]
Safety properties
[編集]In order to guarantee safety, Paxos defines three safety properties and ensures they are always held, regardless of the pattern of failures:
Nontriviality
[編集]- Only proposed values can be learned. [5]
Consistency
[編集]Liveness(C;L)
[編集]- If value C has been proposed, then eventually learner L will learn some value (if sufficient processors remain non-faulty). [6]
前段階
[編集]In order to simplify the presentation of Paxos, the following assumptions and definitions are made explicit. Techniques to broaden the applicability are known in the literature, and are not covered in this article; please see references for further reading.
プロセッサ
[編集]- プロセッサの処理速度はまちまちである。
- プロセッサには障害が起きることがある。
- Processors with stable storage may re-join the protocol after failures.
- プロセッサは談合したり、嘘をついたりなど、プロトコルを破壊しようとは試みない。 (See Byzantine Paxos for a solution which tolerates arbitrary failures)
ネットワーク
[編集]- プロセッサは他のプロセッサに自由にメッセージを送り会える。
- メッセージは非同期に送れ、また、配信に時間がかかることがある。
- メッセージは消失したり、順番が狂ったり、複製されたりすることもある。
- メッセージは改変されることはない。(See Byzantine Paxos for a solution which tolerates arbitrary failures)
プロセッサの数
[編集]- 一般的に、2F+1個のプロセッサでの合意アルゴリズムは、F個のプロセッサで同時に障害が起こるまで動くことができる。[8]. However, using reconfiguration, a protocol may be employed which survives more total failures if they do not occur too rapidly:
- "For example, it takes seven servers to tolerate three [ed: simultaneous] failures. In many systems, the best way to achieve the desired degree of fault tolerance is to reconfigure the system to replace failed servers by spares. With reconfiguration, a system that uses three active servers and two spares can tolerate a total of three failures, if a failed server can be replaced by a spare before another failure occurs. Reconfiguration therefore allows fewer processors to tolerate the same total number of failures, though not the same number of simultaneous failures. (In most systems, simultaneous failures are much less likely than successive ones.)" [4]
Roles
[編集]Paxos describes the actions of the processes by their roles in the protocol; Client, Acceptor, Proposer, Learner, and Leader. In typical implementations, a single processor may play one or more roles at the same time. This does not affect the correctness of the protocol – it is usual to coalesce roles to improve the latency and/or number of messages in the protocol.
Client
[編集]- The Client issues a request to the distributed system, and waits for a response. For instance a "write" request on a file in a distributed file server.
受諾者(Acceptor)
[編集]- The Acceptors act as the fault-tolerant "memory" of the protocol. Acceptors are collected into groups called Quorums. Any message sent to an Acceptor must be sent to a Quorum of Acceptors, any message received from an Acceptor is ignored unless a copy is received from each Acceptor in a Quorum.
提案者(Proposer)
[編集]- A Proposer advocates a client request, attempting to convince the Acceptors to agree on it, and acting as a coordinator to move the protocol forward when conflicts occur.
学習者(Learner)
[編集]- Learners act as the replication factor for the protocol. Once a Client request has been agreed on by the Acceptors, the Learner may take action (ie: execute the request and send a response to the client). To improve availability of processing, additional Learners can be added.
Leader
[編集]- Paxos requires a distinguished Proposer (called the leader) to make progress. Many processes may believe they are leaders, but the protocol only guarantees progress if one of them is eventually chosen. If two processes believe they are leaders, it is possible to stall the protocol by continuously proposing conflicting updates. The safety properties are preserved regardless.
充足数?(Quorums)
[編集]- Quorums express the safety properties of Paxos by ensuring at least some surviving processor retains knowledge of the results.
- Typically, a Quorum is any majority of participating Acceptors. ie: given the set of Acceptors {A,B,C,D}, a majority Quorum would be any three Acceptors: {A,B,C}, {A,C,D}, {A,B,D}, {B,C,D}.
Choice
[編集]- In Paxos, the leader sometimes has to choose among a set of conflicting values. If a set of values is in conflict, the leader must choose one of the values from the most recent round. The protocol does not specify which value must be chosen, and correctness is guaranteed regardless of the choice. However, it is possible for the choice to impede progress.
- A typical Choice function is to select the majority value from the highest round.
Typical deployment
[編集]一般的に用いられているPaxosアルゴリズムにおいて、それぞれの参加者は3つの役割をこなす; 提案者、受諾者、学習者[9]. This reduces the message complexity significantly, without sacrificing correctness:
- "In Paxos, clients send commands to a leader. During normal operation, the leader receives a client's command, assigns it a new command number i, and then begins the ith instance of the consensus algorithm by sending messages to a set of acceptor processes." [6]
By merging roles the protocol "collapses" into an efficient client-master-replica style deployment typical of the database community. The benefit of the Paxos family (including implementations with merged roles) is the guarantee of its Safety Properties.
A typical implementation's message flow is covered in Typical Multi-Paxos Deployment.
Paxosアルゴリズムの基本
[編集]このプロトコルはPaxosアルゴリズムファミリのもっとも基礎である; これは一般的に用いられている実装のプロトコルではない (see Multi-Paxos).
Each instance of the Basic Paxos protocol decides on a single output value. The protocol proceeds over several rounds, a successful round has two phases:
Phase 1a: Prepare
[編集]- A Proposer (the leader) selects a proposal number N and sends a Prepare message to a Quorum of Acceptors.
Phase 1b: Promise
[編集]- If the proposal number N is larger than any previous proposal, then each Acceptor promises not to accept proposals less than N, and sends the value it last accepted for this instance to the Proposer (the leader).
- Otherwise a denial is sent (Nak).
Phase 2a: Accept!
[編集]- If the Proposer receives responses from a Quorum of Acceptors, it may now Choose a value to be agreed upon. If any of the Acceptors have already accepted a value, the leader must Choose a value from this set. Otherwise, the Proposer is free to choose any value.
- The Proposer sends an Accept! message to a Quorum of Acceptors with the Chosen value.
Phase 2b: Accepted
[編集]- If the Acceptor receives an Accept! message for a proposal it has promised, then it Accepts the value.
- Each Acceptor sends an Accepted message to the Proposer and every Learner.
Rounds fail when multiple Proposers send conflicting Prepare messages, or when the Proposer does not receive a Quorum of responses (Promise or Accepted). In these cases, another round must be started with a higher proposal number.
Here is a graphic representation of the Basic Paxos protocol. Note that the values returned in the Promise message (Va, Vb, Vc) are typically null for the first round of each instance, they are shown below for completeness.
Message flow: Basic Paxos
[編集](one instance, one successful round)
Client Proposer Acceptor Learner
| | | | | | |
X-------->| | | | | | Request
| X--------->|->|->| | | Prepare(N)
| |<---------X--X--X | | Promise(N,{Va,Vb,Vc})
| X--------->|->|->| | | Accept!(N,Vn)
| |<---------X--X--X------>|->| Accepted(N,Vn)
|<---------------------------------X--X Response
| | | | | | |
Error cases in basic Paxos
[編集]The simplest error cases are the failure of a redundant Learner, or failure of an Acceptor when a Quorum of Acceptors remains live. In these cases, the protocol requires no recovery. No additional rounds or messages are required, as shown below:
Message flow: Basic Paxos, failure of Acceptor
[編集](Quorum size = 2 Acceptors)
Client Proposer Acceptor Learner
| | | | | | |
X-------->| | | | | | Request
| X--------->|->|->| | | Prepare(N)
| | | | ! | | !! FAIL !!
| |<---------X--X | | Promise(N,{Va,Vb,Vc})
| X--------->|->| | | Accept!(N,Vn)
| |<---------X--X--------->|->| Accepted(N,Vn)
|<---------------------------------X--X Response
| | | | | |
Message flow: Basic Paxos, failure of redundant Learner
[編集] Client Proposer Acceptor Learner
| | | | | | |
X-------->| | | | | | Request
| X--------->|->|->| | | Prepare(N)
| |<---------X--X--X | | Promise(N,{Va,Vb,Vc})
| X--------->|->|->| | | Accept!(N,Vn)
| |<---------X--X--X------>|->| Accepted(N,Vn)
| | | | | | ! !! FAIL !!
|<---------------------------------X Response
| | | | | |
The next failure case is when a Proposer fails after proposing a value, but before agreement is reached. Ignoring Leader election, an example message flow is as follows:
Message flow: Basic Paxos, failure of Proposer
[編集](re-election not shown, one instance, two rounds)
Client Leader Acceptor Learner
| | | | | | |
X----->| | | | | | Request
| X------------>|->|->| | | Prepare(N)
| |<------------X--X--X | | Promise(N,{Va,Vb,Vc})
| | | | | | |
| | | | | | | !! Leader fails during broadcast !!
| X------------>| | | | | Accept!(N,Vn)
| ! | | | | |
| | | | | | | !! NEW LEADER !!
| X--------->|->|->| | | Prepare(N+1)
| |<---------X--X--X | | Promise(N+1,{Vn})
| X--------->|->|->| | | Accept!(N+1,Vn)
| |<---------X--X--X------>|->| Accepted(N+1,Vn)
|<---------------------------------X--X Response
| | | | | | |
The most complex case is when multiple Proposers believe themselves to be Leaders. For instance the current leader may fail and later recover, but the other Proposers have already re-elected a new leader. The recovered leader has not learned this yet and attempts to begin a round in conflict with the current leader.
Message flow: Basic Paxos, dueling Proposers
[編集](one instance, four unsuccessful rounds)
Client Proposer Acceptor Learner
| | | | | | |
X----->| | | | | | Request
| X------------>|->|->| | | Prepare(N)
| |<------------X--X--X | | Promise(N,{Va,Vb,Vc})
| ! | | | | | !! LEADER FAILS
| | | | | | | !! NEW LEADER (knows N)
| X--------->|->|->| | | Prepare(N+1)
| |<---------X--X--X | | Promise(N+1,{Va,Vb,Vc})
| | | | | | | | !! OLD LEADER recovers
| | | | | | | | !! OLD LEADER tries N+1, denied
| X------------>|->|->| | | Prepare(N+1)
| |<------------X--X--X | | Nak(N+1)
| | | | | | | | !! OLD LEADER tries N+2
| X------------>|->|->| | | Prepare(N+2)
| |<------------X--X--X | | Promise(N+2,{Va,Vb,Vc})
| | | | | | | | !! NEW LEADER proposes, denied
| | X--------->|->|->| | | Accept!(N+1,Vn)
| | |<---------X--X--X | | Nak(N+2)
| | | | | | | | !! NEW LEADER tries N+3
| | X--------->|->|->| | | Prepare(N+3)
| | |<---------X--X--X | | Promise(N+3,{Va,Vb,Vc})
| | | | | | | | !! OLD LEADER proposes, denied
| X------------>|->|->| | | Accept!(N+2,Vn)
| |<------------X--X--X | | Nak(N+3)
| | | | | | | | ... and so on ...
Multi-Paxos
[編集]A typical deployment of Paxos requires a continuous stream of agreed values acting as commands to a distributed state machine. If each command is the result of a single instance of the Basic Paxos protocol, a significant amount of overhead would result.
If the leader is relatively stable, phase 1 becomes unnecessary. Thus, it is possible to skip phase 1 for future instances of the protocol with the same leader.
To achieve this, the instance number is included along with each value. Multi-Paxos reduces the failure-free message delay (proposal to learning) from 4 delays to 2 delays.
Message flow: Multi-Paxos, start
[編集]( first instance with new leader)
Client Proposer Acceptor Learner
| | | | | | | --- First Request ---
X-------->| | | | | | Request
| X--------->|->|->| | | Prepare(N)
| |<---------X--X--X | | Promise(N,I,{Va,Vb,Vc})
| X--------->|->|->| | | Accept!(N,I,Vn)
| |<---------X--X--X------>|->| Accepted(N,I,Vn)
|<---------------------------------X--X Response
| | | | | | |
Message flow: Multi-Paxos, steady-state
[編集](subsequent instances with same leader)
Client Proposer Acceptor Learner | | | | | | | --- Following Requests --- X-------->| | | | | | Request | X--------->|->|->| | | Accept!(N,I+1,W) | |<---------X--X--X------>|->| Accepted(N,I+1,W) |<---------------------------------X--X Response | | | | | | |
Typical Multi-Paxos deployment
[編集]The most common deployment of the Paxos family is Multi-Paxos [9], specialized for participating processors to each be Proposers, Acceptors and Learners. The message flow may be optimized as depicted here:
Message flow: Collapsed Multi-Paxos, start
[編集](first instance with new leader)
Client Servers
| | | | --- First Request ---
X-------->| | | Request
| X->|->| Prepare(N)
| |<-X--X Promise(N,I,{Va,Vb,Vc})
| X->|->| Accept!(N,I,Vn)
| |<-X--X Accepted(N,I)
|<--------X | | Response
| | | |
Message flow: Collapsed Multi-Paxos, steady state
[編集](subsequent instances with same leader)
Client Servers X-------->| | | Request | X->|->| Accept!(N,I+1,W) | |<-X--X Accepted(N) |<--------X | | Response | | | |
Optimizations
[編集]A number of optimizations reduce message complexity and size. These optimizations are summarized below:
- "We can save messages at the cost of an extra message delay by having a single distinguished learner that informs the other learners when it finds out that a value has been chosen. Acceptors then send Accepted messages only to the distinguished learner. In most applications, the roles of leader and distinguished learner are performed by the same processor.
- "A leader can send its Prepare and Accept! messages just to a quorum of acceptors. As long as all acceptors in that quorum are working and can communicate with the leader and the learners, there is no need for acceptors not in the quorum to do anything.
- "Acceptors do not care what value is chosen. They simply respond to Prepare and Accept! messages to ensure that, despite failures, only a single value can be chosen. However, if an acceptor does learn what value has been chosen, it can store the value in stable storage and erase any other information it has saved there. If the acceptor later receives a Prepare or Accept! message, instead of performing its Phase1b or Phase2b action, it can simply inform the leader of the chosen value.
- "Instead of sending the value v, the leader can send a hash of v to some acceptors in its Accept! messages. A learner will learn that v is chosen if it receives Accepted messages for either v or its hash from a quorum of acceptors, and at least one of those messages contains v rather than its hash. However, a leader could receive Promise messages that tell it the hash of a value v that it must use in its Phase2a action without telling it the actual value of v. If that happens, the leader cannot execute its Phase2a action until it communicates with some process that knows v." [4]
- "A proposer can send its proposal only to the leader rather than to all coordinators. However, this requires that the result of the leader-selection algorithm be broadcast to the proposers, which might be expensive. So, it might be better to let the proposer send its proposal to all coordinators. (In that case, only the coordinators themselves need to know who the leader is.)
- "Instead of each acceptor sending Accepted messages to each learner, acceptors can send their Accepted messages to the leader and the leader can inform the learners when a value has been chosen. However, this adds an extra message delay.
- "Finally, observe that phase 1 is unnecessary for round 1 .. The leader of round 1 can begin the round by sending an Accept! message with any proposed value." [5]
Cheap Paxos
[編集]Cheap Paxos extends Basic Paxos to tolerate F failures with F+1 main processors and F auxiliary processors by dynamically reconfiguring after each failure.
This reduction in processor requirements comes at the expense of liveness; if too many main processors fail in a short time, the system must halt until the auxiliary processors can reconfigure the system. During stable periods, the auxiliary processors take no part in the protocol.
- "With only two processors p and q, one processor cannot distinguish failure of the other processor from failure of the communication medium. A third processor is needed. However, that third processor does not have to participate in choosing the sequence of commands. It must take action only in case p or q fails, after which it does nothing while either p or q continues to operate the system by itself. The third processor can therefore be a small/slow/cheap one, or a processor primarily devoted to other tasks." [4]
Message flow: Cheap Multi-Paxos
[編集]3 main Acceptors, 1 Auxiliary Acceptor, Quorum size = 3, showing failure of one main processor and subsequent reconfiguration
{ Acceptors }
Proposer Main Aux Learner
| | | | | | -- Phase 2 --
X----------->|->|->| | | Accept!(N,I,V)
| | | ! | | --- FAIL! ---
|<-----------X--X--------------->| Accepted(N,I,V)
| | | | | -- Failure detected (only 2 accepted) --
X----------->|->|------->| | Accept!(N,I,V) (re-transmit, include Aux)
|<-----------X--X--------X------>| Accepted(N,I,V)
| | | | | -- Reconfigure : Quorum = 2 --
X----------->|->| | | Accept!(N,I+1,W) (Aux not participating)
|<-----------X--X--------------->| Accepted(N,I+1,W)
| | | | |
Fast Paxos
[編集]Fast Paxos generalizes Basic Paxos to reduce end-to-end message delays. In Basic Paxos, the message delay from client request to learning is 3 message delays. Fast Paxos allows 2 message delays, but requires the Client to send its request to multiple destinations.
Intuitively, if the leader has no value to propose, then a client could send an Accept! message to the Acceptors directly. The Acceptors would respond as in Basic Paxos, sending Accepted messages to the leader and every Learner achieving two message delays from Client to Learner.
If the leader detects a collision, it resolves the collision by sending Accept! messages for a new round which are Accepted as usual. This coordinated recovery technique requires four message delays from Client to Learner.
The final optimization occurs when the leader specifies a recovery technique in advance, allowing the Acceptors to perform the collision recovery themselves. Thus, uncoordinated collision recovery can occur in three message delays (and only two message delays if all Learners are also Acceptors).
Message flow: Fast Paxos, non-conflicting
[編集]Client Leader Acceptor Learner | | | | | | | | | X--------->|->|->|->| | | Any(N,I,Recovery) | | | | | | | | X------------------->|->|->|->| | | Accept!(N,I,W) | |<---------X--X--X--X------>|->| Accepted(N,I,W) |<------------------------------------X--X Response(W) | | | | | | | |
Message flow: Fast Paxos, conflicting proposals
[編集]Conflicting proposals with uncoordinated recovery. Note: the protocol does not specify how to handle the dropped client request.
Client Leader Acceptor Learner | | | | | | | | | | | X------->|->|->|->| | | Any(N,I,Recovery) | | | | | | | | | | | | | | | | | | !! Concurrent conflicting proposals | | | | | | | | | !! received in different order | | | | | | | | | !! by the Acceptors | X--------------?|-?|-?|-?| | | Accept!(N,I,V) X-----------------?|-?|-?|-?| | | Accept!(N,I,W) | | | | | | | | | | | | | | | | | | !! Acceptors disagree on value | | |<-------X--X->|->|----->|->| Accepted(N,I,V) | | |<-------|<-|<-X--X----->|->| Accepted(N,I,W) | | | | | | | | | | | | | | | | | | !! Detect collision & recover | | |<-------X--X--X--X----->|->| Accepted(N+1,I,W) |<---------------------------------X--X Response(W) | | | | | | | | |
Message flow: Fast Paxos, collapsed roles
[編集](merged Acceptor/Learner roles)
Client Servers | | | | | | | | X->|->|->| Any(N,I,Recovery) | | | | | | | | | | | | !! Concurrent conflicting proposals | | | | | | !! received in different order | | | | | | !! by the Servers | X--------?|-?|-?|-?| Accept!(N,I,V) X-----------?|-?|-?|-?| Accept!(N,I,W) | | | | | | | | | | | | !! Servers disagree on value | | X--X->|->| Accepted(N,I,V) | | |<-|<-X--X Accepted(N,I,W) | | | | | | | | | | | | !! Detect collision & recover |<-----------X--X--X--X Response(W) | | | | | |
Generalized Paxos
[編集]Generalized consensus explores the relationship between the operations of a distributed state machine and the consensus protocol used to maintain consistency of that state machine. The main discovery involves optimizations of the consensus protocol when conflicting proposals could be applied to the state machine in any order. ie: The operations proposed by the conflicting proposals are commutative operations of the state machine.
In such cases, the conflicting operations can both be accepted, avoiding the delays required for resolving conflicts and re-proposing the rejected operation.
This concept is further generalized into ever-growing sets of commutative operations, some of which are known to be stable (and thus may be executed). The protocol tracks these sets of operations, ensuring that all proposed commutative operations of one set are stabilized before allowing any non-commuting operation to become stable.
Example
[編集]- In order to illustrate Generalized Paxos, this example shows a message flow between two concurrently executing clients and a distributed state machine performing the operations of a read/write register with 2 independent register addresses (A and B).
- Commutativity Table; marked cells denote interference:
Read(A) Write(A) Read(B) Write(B) Read(A) | | X | | | Write(A)| X | X | | | Read(B) | | | | X | Write(B)| | | X | X |
- Proposed Series of operations (global order):
1:Read(A) 2:Read(B) 3:Write(B) 4:Read(B) 5:Read(A) 6:Write(A) 7:Read(A)
- One possible permutation allowed by commutes:
{ 1:Read(A), 2:Read(B), 5:Read(A) }
{ 3:Write(B), 6:Write(A) }
{ 4:Read(B), 7:Read(A) }
- Observations:
5:Read(A)may commute in front of3:Write(B)/4:Read(B)pair.4:Read(B)may commute behind the3:Write(B)/6:Write(A)pair.- In practice, a commute occurs only when operations are proposed concurrently.
Message flow: Generalized Paxos (example)
[編集]Responses not shown. Note: message abbreviations differ from previous message flows due to specifics of the protocol, see [6] for a full discussion.
{ Acceptors }
Client Leader Acceptor Learner
| | | | | | | | !! New Leader Begins Round
| | X----->|->|->| | | Prepare(N)
| | |<-----X--X--X | | Promise(N,null)
| | X----->|->|->| | | Phase2Start(N,null)
| | | | | | | |
| | | | | | | | !! Concurrent commuting proposals
| X--------?|-----?|-?|-?| | | Propose(ReadA)
X-----------?|-----?|-?|-?| | | Propose(ReadB)
| | X------X-------------->|->| Accepted(N,<ReadA,ReadB>)
| | |<--------X--X-------->|->| Accepted(N,<ReadB,ReadA>)
| | | | | | | |
| | | | | | | | !! No Conflict, both accepted
| | | | | | | | Stable = <ReadA, ReadB>
| | | | | | | |
| | | | | | | | !! Concurrent conflicting proposals
X-----------?|-----?|-?|-?| | | Propose(<WriteB,ReadA>)
| X--------?|-----?|-?|-?| | | Propose(ReadB)
| | | | | | | |
| | X------X-------------->|->| Accepted(N,<WriteB,ReadA> . <ReadB>)
| | |<--------X--X-------->|->| Accepted(N,<ReadB> . <WriteB,ReadA>)
| | | | | | | |
| | | | | | | | !! Conflict detected, leader chooses
| | | | | | | | commutative order:
| | | | | | | | V = <ReadA, WriteB, ReadB>
| | | | | | | |
| | X----->|->|->| | | Phase2Start(N+1,V)
| | |<-----X--X--X-------->|->| Accepted(N+1,V)
| | | | | | | | Stable = <ReadA, ReadB> .
| | | | | | | | <ReadA, WriteB, ReadB>
| | | | | | | |
| | | | | | | | !! More conflicting proposals
X-----------?|-----?|-?|-?| | | Propose(WriteA)
| X--------?|-----?|-?|-?| | | Propose(ReadA)
| | | | | | | |
| | X------X-------------->|->| Accepted(N+2,<WriteA> . <ReadA>)
| | |<--------X--X-------->|->| Accepted(N+2,<ReadA> . <WriteA>)
| | | | | | | |
| | | | | | | | !! Leader chooses order W
| | X----->|->|->| | | Phase2Start(N+2,W)
| | |<-----X--X--X-------->|->| Accepted(N+2,W)
| | | | | | | | Stable = <ReadA, ReadB> .
| | | | | | | | <ReadA, WriteB, ReadB> .
| | | | | | | | <WriteA, ReadA>
| | | | | | | |
Generalized Paxos vs. Fast Multi-Paxos
[編集]- The message flow above shows Generalized Paxos performing agreement on seven values in (nominally) 10 message delays. Fast Multi-Paxos would require 15-17 delays for the same sequence (3 delays for each of the three concurrent proposals with uncoordinated recovery, plus at least 2 delays for the eventual re-submission of the three rejected proposals, concurrent re-proposals may add two additional delays).
Byzantine Paxos
[編集]Paxos may also be extended to support arbitrary failures of the participants, including lying, fabrication of messages, collusion with other participants, selective non-participation, etc. These types of failures are called Byzantine Failures, after the solution popularized by Lamport. [10]
Byzantine Paxos [7][5] adds an extra message (Verify) which acts to distribute knowledge and verify the actions of the other processors:
Message flow: Byzantine Multi-Paxos, steady state
[編集]Client Proposer Acceptor Learner | | | | | | | X-------->| | | | | | Request | X--------->|->|->| | | Accept!(N,I,V) | | X<>X<>X | | Verify(N,I,V) - BROADCAST | |<---------X--X--X------>|->| Accepted(N,V) |<---------------------------------X--X Response(V) | | | | | | |
Fast Byzantine Paxos removes this extra delay, since the client sends commands directly to the Acceptors [5].
Note the Accepted message in Fast Byzantine Paxos is sent to all Acceptors and all Learners, while Fast Paxos sends Accepted messages only to Learners):
Message flow: Fast Byzantine Multi-Paxos, steady state
[編集]Client Acceptor Learner | | | | | | X----->|->|->| | | Accept!(N,I,V) | X<>X<>X------>|->| Accepted(N,I,V) - BROADCAST |<-------------------X--X Response(V) | | | | | |
The failure scenario is the same for both protocols; Each Learner waits to receive F+1 identical messages from different Acceptors. If this does not occur, the Acceptors themselves will also be aware of it (since they exchanged each other's messages in the broadcast round), and correct Acceptors will re-broadcast the agreed value:
Message flow: Fast Byzantine Multi-Paxos, failure
[編集]Client Acceptor Learner
| | | ! | | !! One Acceptor is faulty
X----->|->|->! | | Accept!(N,I,V)
| X<>X<>X------>|->| Accepted(N,I,{V,W}) - BROADCAST
| | | ! | | !! Learners receive 2 different commands
| | | ! | | !! Correct Acceptors notice error and choose
| X<>X<>X------>|->| Accepted(N,I,V) - BROADCAST
|<-------------------X--X Response(V)
| | | ! | |
Production use of Paxos
[編集]- Google uses the Paxos algorithm in their Chubby distributed lock service in order to keep replicas consistent in case of failure. Chubby is used by Bigtable which is now in production in Google Analytics and other products.
- IBM uses the Paxos algorithm in their IBM SAN Volume Controller product to implement a general purpose fault-tolerant virtual machine used to run the configuration and control components of the storage virtualization services offered by the cluster. This implementation features: dynamic quorum (which considers power domains and extends the PAXOS protocol to an optional quorum disk to maintain fault-tolerance down to clusters as small as two nodes); concurrent ballots of batched requests broadcast and collated using an overlay binary tree network for efficiency; automatic reintegration of restarted nodes without stalling the cluster (by state delta transfer using an overlay hypercube network followed by catch-up of ballots committed during the state transfer) and an underlying view management algorithm used to select a leader and gracefully handle asymmetric network partitions.
- Microsoft uses Paxos in the Autopilot cluster management service from Live Search
References
[編集]- ^ a b c Pease, Marshall; Robert Shostak, Leslie Lamport (April 1980). “Reaching Agreement in the Presence of Faults”. Journal of the Association for Computing Machinery 27 (2) 2007年2月2日閲覧。. 引用エラー: 無効な
<ref>タグ; name "agree"が異なる内容で複数回定義されています - ^ Lamport, Leslie (July 1978). “Time, Clocks and the Ordering of Events in a Distributed System”. Communications of the ACM 21 (7): 558–565 2007年2月2日閲覧。.
- ^ Lamport, Leslie (May 1998). “The Part-Time Parliament”. ACM Transactions on Computer Systems 16 (2): 133–169 2007年2月2日閲覧。.
- ^ a b c d Lamport, Leslie; Mike Massa (2004). “Cheap Paxos”. Proceedings of the International Conference on Dependable Systems and Networks (DSN 2004).
- ^ a b c d e f Lamport, Leslie (2005年). “Fast Paxos”. Template:Cite webの呼び出しエラー：引数 accessdate は必須です。
- ^ a b c d e Lamport, Leslie (2005). Generalized Consensus and Paxos.
- ^ a b Castro, Miguel (2001年). “Practical Byzantine Fault Tolerance”. Template:Cite webの呼び出しエラー：引数 accessdate は必須です。
- ^ Lamport, Leslie (2004年). “Lower Bounds for Asynchronous Consensus”. Template:Cite webの呼び出しエラー：引数 accessdate は必須です。
- ^ a b Chandra, Tushar; Robert Griesemer, Joshua Redstone (2007). “Paxos Made Live – An Engineering Perspective”. PODC '07: 26th ACM Symposium on Principles of Distributed Computing.
- ^ Lamport, Leslie; Robert Shostak, Marshall Pease (July 1982). “The Byzantine Generals Problem”. ACM Transactions on Programming Languages and Systems 4 (3): 382–401 2007年2月2日閲覧。.
See also
[編集]External links
[編集]- Leslie Lamport's home page
- Paxos Made Simple
- Revisiting the Paxos Algorithm
- Paxos Commit
- Yale University's Wiki article
- Leslie Lamport's history of the paper
- Google Whitepaper: Chubby Distributed Lock Service
- Google Whitepaper: Bigtable A Distributed Storage System for Structured Data
- Survey of Paxos Algorithms (2007)