chapter 5 synchronization clocks and synchronization algorithms lamport timestamps and vector clocks...
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Chapter 5 Synchronization•Clocks and Synchronization Algorithms•Lamport Timestamps and Vector Clocks•Distributed Snapshots•Termination Detection•Election Algorithms•Distributed Mutual Exclusion•Transactions – concurrency control
2
What Do We Mean By Time?
• Monotonic increasing
• Useful when everyone agrees on it
• UTC is Universal Coordinated Time.
• NIST operates on a short wave radio frequency WWV and transmits UTC from Colorado.
3
Clock Synchronization
When each machine has its own clock, an event that occurred after another event may nevertheless be assigned an earlier time.
4
Time
• Time is complicated in a distributed system.
• Physical clocks run at slightly different rates – so they can ‘drift’ apart.
• Clock makers specify a maximum drift rate (rho).
• By definition
1- <= dC/dt <= 1+ where C(t) is the clock’s time as a function of the real time.
5
Clock Synchronization
The relation between clock time and UTC when clocks tick at different rates.
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Clock Synchronization
• 1- <= dC/dt <= 1+• A perfect clock has dC/dt = 1
• Assuming 2 clocks have the same max drift rate . To keep them synchronized to within a time interval delta, , they must re-sync every /2 seconds.
7
Cristian’s Algorithm
• One of the nodes (or processors) in the distributed system is a time server TS (presumably with access to UTC). How can the other nodes be sync’ed?
• Periodically, at least every /2 seconds, each machine sends a message to the TS asking for the current time and the TS responds.
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Cristian's Algorithm
Getting the current time from a time server.
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Cristian’s Algorithm
• Should the client node simply force his clock to the value in the message??
• Potential problem: if client’s clock was fast, new time may be less than his current time, and just setting the clock to the new time might make time appear to run backwards on that node.
• TIME MUST NEVER RUN BACKWARDS. There are many applications that depend on the fact that time is always increasing. So new time must be worked in gradually.
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Cristian’s Algorithm
• Can we compensate for the delay from when TS sends the response to T1 (when it is received)?
• Add (T1 – T0)/2. If no outside info is available.• Estimate or ask server how long it takes to process
time request, say R. Then add (T1 – T0 – R)/2.• Take several measurements and taking the smallest or
an average after throwing out the large values.
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The Berkeley Algorithm
• The server actively tries to sync the clocks of a DS. This algorithm is appropriate if no one has UTC and all must agree on the time.
• Server “polls” each machine by sending his current time and asking for the difference between his and theirs. Each site responds with the difference.
• Server computes ‘average’ with some compensation for transmission time.
• Server computes how each machine would need to adjust his clock and sends each machine instructions.
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The Berkeley Algorithm
a) The time daemon asks all the other machines for their clock values
b) The machines answer
c) The time daemon tells everyone how to adjust their clock
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Analysis of Sync Algorithms
• Cristian’s algorithm: N clients send and receive a message every /2 seconds.
• Berkeley algorithm: 3N messages every /2 seconds.
• Both assume a central time server or coordinator. More distributed algorithms exist in which each processor broadcasts its time at an agreed upon time interval and processors go through an agreement protocol to average the value and agree on it.
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Analysis of Sync Algorithms
• In general, algorithms with no coordinator have greater message complexity (more messages for the same number of nodes). That’s the price you pay for equality and no-single-point-of-failure.
• With modern hardware, we can achieve “loosely synchronized” clocks. This forms the basis for many distributed algorithms in which logical clocks are used with physical clock timestamps to disambiguate when logical clocks roll over or servers crash and sequence numbers start over (which is inevitable in real implementations).
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Logical Clocks
• What do we really need in a “clock”? For many applications, it is not necessary for nodes of a DS to agree on the real time, only that they agree on some value that has the attributes of time.
• Attributes of time: X(t) has the sense or attributes of time if it is strictly increasing.
• A real or integer counter can be used. A real number would be closer to reality, however, an integer counter is easier for algorithms and programmers. Thus, for convenience, we use an integer which is incremented anytime an event of possible interest occurs.
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Logical Clocks in a DS
• What is important is usually not when things happened but in what order they happened so the integer counter works well in a centralized system.
• However, in a DS, each system has its own logical clock, and you can run into problems if one “clock” gets ahead of others. (like with physical clocks)
• We need a rule to synchronize the logical clocks.
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Lamport Clocks
Lamport defined the happens-before relation for DS.
A B means “A happens before B”.• If A and B are events in the same process and A occurs
before B then A B is true.• If A is the event of a message being sent by one
process-node and B is the event of that message being received by another process, then then A B is true. (A message must be sent before it is received).
• Happens-before is the transitive closure of 1 and 2. That is, if AB and BC, then AC.
Any other events are said to be concurrent.
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Lamport Clocks
p1q2 and q1p2 and q1q2 but p1 and q1 are incomparable. p1q3 and p1r2 Does p1 r1?
P Q R
p1
q1
p2 r1
q2
q3
p3
r2
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Lamport Clocks
• Desired properties:
• (1) anytime A B , C(A) < C(B), that is the logical clock value of the earlier event is less
• (2) the clock value C is increasing (never runs backwards)
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Lamport Clocks Rules
• An event is an internal event or a message send or receive.
• The local clock is increased by one for each message sent and the message carries that timestamp with it.
• The local clock is increased for an internal event.• When a message is received, the current local clock
value, C, is compared to the message timestamp, T. If the message timestamp, T = C, then set the local clock value to C+1. If T > C, set the clock to T+1. If T<C, set the clock to C+1.
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Lamport Clocks
Anytime A B , C(A) < C(B) However, C(E) < C(F) doesn’t mean E F
(ex: event 6 on P may not proceed event 7 on Q)
P Q R
52
646
7
7
8
3
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Lamport Timestamps
• If you need a total ordering, (distinguish between event 6 on P and event 6 on Q) use Lamport timestamps.
• Lamport timestamp of event A at node i is (C(A), i) • For any 2 timestamps T1=(C(A),I) and T2=(C(B),J)
– If C(A) > C(B) then T1 > T2.
– If C(A) < C(B) then T1 < T2.
– If C(A) = C(B) then consider node numbers. If I>J then T1 > T2. If I<J then T1 < T2. If I=J then the two events occurred at the same node, so since their clock C is the same, they must be the same event.
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Lamport Timestamps
(6,1) (6,2) and (4,3) (6,2)
P1 P2 P3
(5,1)(2,2)
(6,1)(4,3)(6,2)
(7,2)
(7,1)(8,3)
(3,3)
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Lamport Timestamps
a) Three processes, each with its own clock. The clocks run at different rates.
b) Lamport's algorithm corrects the clocks.
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Exercise: Lamport Clocks and Timestamps
Assuming the only events are message send and receive, what are the clocks at 1-7
A
B
C
1 2 3
4 5
6 7
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Why Vector Timestamps
• Lamport timestamps gives us the property if A B then C(A) < C(B). But it doesn’t give us the property if C(A) < C(B) then AB. (if C(A) < C(B), A and B may be concurrent or incomparable, but never BA).
A1
B2
C3
1,1 2,1 1,2 2,2
1,3 2,3
Lamport timestamp of 1,1 < 2,2 but the events are unrelated
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Why Vector Timestamps
Also, Lamport timestamps do not detect causality violations. Causality violations are caused by long communications delays in one channel that are not present in other channels or a non-FIFO channel.
A
B
C
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Causality Violation• Causality violation example: A gets a message
from B that was broadcast to all nodes. A responds by broadcasting an answer to all nodes. C gets A’s answer to B before it receives B’s original message.
• How can B tell that this message is out of order?
A
B
C
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Causality: Solution
• The solution is vector timestamps: Each node maintains an array of counters.
• If there are N nodes, the array has N integers V(N). V(I) = C, the local clock, if I is the designation of the local node.
• In general, V(X) is the latest info the node has on what X’s local clock is.
• Gives us the property e f iff ts(e) < ts(f)
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Vector Timestamps
Each site has a local clock incremented at each event (not according to Lamport clocks) The vector clock timestamp is piggybacked on each message sent. RULES:
• Local clock is incremented for a local event and for a send event. The message carries the vector time stamp.
• When a message is received, the local clock is incremented by one. Each other component of the vector is increased to the received vector timestamp component if the current value is less. That is, the maximum of the two vector components is the new value.
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Vector Timestamps and Causal Violations
• C receives message (2,1,0) then (0,1,0)• The later message causally precedes the first
message if we define how to compare timestamps right
A
B
C
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Vector Clock Comparison
• VC1 > VC2 if for each component j, VC1[j] >= VC2[j], and for some component k, VC1[k] > VC2[k]
• VC1 = VC2 if for each j, VC1[j] = VC2[j]• Otherwise, VC1 and VC2 are incomparable
and the events they represent are concurrent
A
B
C
1
2
3 4
Clock at point1= (2,1,0)2= (2,2,0)3= (2,1,1)4= (2,1,2)
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Vector Clock Exercise
Assuming the only events are send and receive:
What is the vector clock at events 1-6?
Which events are concurrent?
A
B
C
1
2 5
3 4
6
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Matrix Timestamps
Matrix timestamps can be used to give each node more information about the state of the other nodes.
Each site keeps a 2 dimensional time table
If Ti[j,k] = v then site i knows that site j is aware of all events at site k up to v
Row x is the view of the vector clock at site x A’s TT A B CA 3 2 3B 1 2 0C 2 2 3
A
B
C
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Global State
• Matrix timestamps is one way of getting information about the distributed system. Another way is to sample the global state.
• The Global state is the combination of the states of all the processors and channels at some time which could have occurred. – Because there is no way of recording states at the
exact same time at every node, we will have to be careful how we define this.
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Global State
• There are many reasons for wanting to sample the global state “take a snapshot”.– deadlock detection – finding lost token – termination of a distributed computation – garbage collection
• We must define what is meant by the state of a node or a channel.
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Defining Global State
• There are N processes P1…Pn. The state of the process Pi is defined by the system and application being used.
• Between each pair of processors, Pi and Pj, there is a one-way communications channel Ci,j. Channels are reliable and FIFO, ie, the messages arrive in the order sent. The contents of Ci,j is an ordered list of messages Li,j = (m1, m2, m3…). The state of the channel is the messages in the channel and their order.
• Li,j = (m1, m2, …) is the channel from Pi to Pj and m1 (head or front) is the next message to be delivered.
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Defining Global State
It is not necessary for all processors to be interconnected, but each processor must have at least one incoming channel and one outgoing channel and it must be possible to reach each processor from any other processor (graph is strongly connected).
1
2
3
4
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Defining Global State
• The Global state is the combination of the states of all the processors and channels.
• The state of all the channels, L, is the set of messages sent but not yet received.
• Defining the state was easy, getting the state is more difficult.
• Intuitively, we say that a consistent global state is a “snapshot” of the DS that looks to the processes as if it were taken at the same instant everywhere.
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Defining Global State
• For a global state to be meaningful, it must be one that could have occurred.
• Suppose we observe processor Pi (getting state Si) and it has just received a message m from processor Pk. When we observe processor Pk to get Sk, it should have sent m to Pi in order for us to have a consistent global state. In other words, if we get Pk’s state before it sent message m and then get Pi’s state after it received m, we have an inconsistent global state.Pi
Pk
Pi
Pk
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Consistent Cut
• So we say that the global state must represent a consistent cut.
• One way of defining a consistent cut is that the observations resulting in the states Si should all occur concurrently (as defined using vector clocks).
• Also, a consistent cut is one where all the events before the cut happen-before the ones after the cut or are unrelated (uses “happens-before” relation).
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Global State (1)
a) A consistent cutb) An inconsistent cut
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Algorithm for Distributed Snapshot
• Well known algorithm by Chandy and Lamport• When instructed, each processor will stop other
processing and record its state Pi, send out marker messages and record the sequence of messages arriving on each incoming channel until a marker comes in (this will enable us to get the channel state Ci,j).
• At end of algorithm, initiator or other coordinator collects local states and compiles global state.
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Chandy Lamport Snapshot
a) Organization of a process and channels for a distributed snapshot
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Chandy Lamport Snapshot
• One processor starts the snapshot by recording his own local state and immediately sends a marker message M on each of its outgoing channels. (This indicates the causal boundary between before the local state was recorded and after). It begins to record all the messages arriving on all incoming channels. When it has received markers from all incoming channels, it is done.
• When a processor who was not the initiator receives the marker for the first time, it immediately records its local state, sends out markers on all outgoing channels. It begins recording the received message sequence on all incoming channels other than the one it just received the marker on. When a marker has been received on each incoming channel, the processor is done with its part of the snapshot.
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Chandy Lamport Snapshot
b) Process Q receives a marker for the first time and records its local state
c) Q records all incoming messaged) Q receives a marker for its incoming channel and finishes recording
the state of the incoming channel
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Snapshot
Node 2 initiates snapshot
1
2
3
4
a
bc
Recorded:
2 State S2
M
M
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Snapshot
Node 2 initiates snapshot
1
2
3
4b
c
Recorded:
2 State S2M
M
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Snapshot
Node 2 initiates snapshot
1
2
3
4b
Recorded:
2 State S2M
MM d
14
State S1
State S44
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Snapshot
1
2
3
4
Recorded:
2 State S2M
M
M
d1
4
State S1
State S4
L3,2 = b
4
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Snapshot
1
2
3
4
Recorded:
2 State S2
M
d1
4
State S1
State S4
L3,2 = bL1,2 = emptyL4,2 = empty
4
52
Snapshot
1
2
3
4
Recorded:
2 State S2
14
State S1
State S4
L3,2 = bL1,2 = emptyL4,2 = empty
3
State S3
M
L3,1 = d
M
4
3
53
Snapshot
1
2
3
4
Recorded:
2 State S2
14
State S1
State S4
L3,2 = bL1,2 = emptyL4,2 = empty
3
State S3
M
L3,1 = d
M 4
3
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Snapshot
1
2
3
4
Recorded:
2 State S2
14
State S1
State S4
L3,2 = bL1,2 = emptyL4,2 = empty
3
State S3
L3,1 = d
4
3
1
2
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Chandy Lamport Snapshot
Uses O(|E|) messages where E is the number of edges. Time bound is dependent on the topology of the graph.
1
2
3
4
2
14
3
4
3
1
2
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Next: Termination detection