on probabilistic snap-stabilization
DESCRIPTION
On Probabilistic Snap-Stabilization. Karine Altisen Stéphane Devismes University of Grenoble. Self-Stabilization [Dijkstra,74]. Self-Stabilization [Dijkstra,74]. T ransient faults: Location : node or link Duration : finite Frequency : low - PowerPoint PPT PresentationTRANSCRIPT
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On Probabilistic Snap-Stabilization
Karine AltisenStéphane Devismes
University of Grenoble
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Self-Stabilization [Dijkstra,74]
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Self-Stabilization [Dijkstra,74]
Transient faults:• Location: node or link• Duration: finite• Frequency: lowe.g., memory corruptions, message losses, message corruptions
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Self-Stabilization [Dijkstra,74]
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Self-Stabilization [Dijkstra,74]
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Self-Stabilization [Dijkstra,74]
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Self-Stabilization [Dijkstra,74]
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Self-Stabilization [Dijkstra,74]
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Self-Stabilization [Dijkstra,74]
Recover after any number of
transient faults
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Advantages
• Tolerate any finite number of transient faults
• Lightweight– Low overhead
• No initialization– Large-scale network
– Self-organization in wireless sensor network
• Tolerate (detectable) topological changes
• Self-stabilizing algorithms can be easily composed04/06/2014
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Drawbacks of Self-Stabilization
• Temporary Loss of Safety• No local detection of stabilization
– Permanent local checks– Endlessly repeat computations
• Impossibility Results
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Drawbacks of Self-Stabilization
• Temporary Loss of Safety• No local detection of stabilization
– Permanent local checks– Endlessly repeat computations
• Impossibility Results
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Temporary Loss of Safety
Goal: Minimize the stabilization time
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Temporary Loss of Safety
Stabilization time usually in Ω(D) rounds
[Tixeuil & Genolini, 2002]
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Self-stabilization: endless repetitions of finite task executions
Transient faults
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Self-stabilization: endless repetitions of finite task executions
Finite (but usually unbounded) number of times
Transient faults
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(Deterministic) Snap-Stabilization[Bui et al, 1999]
• Resume a correct behavior since the first started task after the end of faults
Transient faults
First start
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(Deterministic) Snap-Stabilization[Bui et al, 1999]
• Strengthened form of self-stabilization– Snap-Stabilization Self-Stabilization⇒
• Lot of solutions are available, but only in– Identified, or– Rooted networks
• What about anonymous networks ?
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(Deterministic) Snap-Stabilization[Bui et al, 1999]
• Most of classical problems even have no deterministic self-stabilizing solutions, e.g.,– Token passing– Leader Election
• Several weakened forms of self-stabilization have been introduced to circumvent these impossibility results, e.g.,– Weak-stabilization [Gouda, 2001]– K-stabilization [Beauquier et al, 1998]– Probabilistic self-stabilization [Herman, 1990]
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(Deterministic) Snap-Stabilization[Bui et al, 1999]
• Most of classical problems even have no deterministic self-stabilizing solutions, e.g.,– Token passing– Leader Election
• Several weakened forms of self-stabilization have been introduced to circumvent these impossibility results, e.g.,– Weak-stabilization [Gouda, 2001]– K-stabilization [Beauquier et al, 1998]– Probabilistic self-stabilization [Herman, 1990]
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Deterministic vs. Probabilistic Self-Stabilization
• Deterministic Self-stabilization– Deterministic convergence:
• Starting from any configuration, the system converges to a legitimate configuration within finite time
• Probabilistic Self-stabilization– Probabilistic convergence:
• Starting from any configuration, the system converges to a legitimate configuration within almost surely finite time (Las Vegas Approach)
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Contribution (1/2)
• Probabilistic Snap-stabilization– Weakened form of snap-stabilization– Not comparable to self-stabilization
• Ideas– We relax the definition of snap-stabilization
without altering its strong safety guarantees – to address anonymous networks
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Definition• For every task started after the faults
(i.e., starting from an arbitrary configuration)– The safety part of the specification is satisfied– However, the liveness part of the specification is
only almost surely ensured (Las Vegas approach)
Transient faults
The task is executed safely, but it terminates in almost surely finite time
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Contribution (2/2)
2 probabilistic snap-stabilizing protocols for • the guaranteed service leader election in anonymous networks using the locally shared memory model
– The first one assumes a synchronous scheduler– The second one assumes an asynchronous scheduler
– This problem has no deterministic self- or snap- stabilizing solution04/06/2014
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Definition of the problem
time
proc
esse
s
P1
P2
P3
P4
P5
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Definition of the problem
time
proc
esse
s
P1
P2
P3
P4
P5?
?
?
?
?
Upon a request A process initiates the question
“Am I the leader of the network ?”04/06/2014
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yes
Definition of the problem
time
proc
esse
s
P1
P2
P3
P4
P5
The task consists in computing the answer (yes/no)
?
?
?
?
?
no
no
no
no
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yes
Definition of the problem
time
proc
esse
s
P1
P2
P3
P4
P5
Each process always receives the same answer to each of its request
?
?
?
?
?
no
no
no
no
yes ? yes ?
? no
? no
? no
? no ? no
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yes
Definition of the problem
time
proc
esse
s
P1
P2
P3
P4
P5
Exactly one process always receives yes
?
?
?
?
?
no
no
no
no
yes ? yes ?
? no
? no
? no
? no ? no
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Overview of the synchronous solution
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Roadmap
Non-stabilizing probabilistic solution
Probabilistic self-stabilizing solution
Probabilistic snap-stabilizing solution
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Required Knowledge
• If processes has no global information about the network (e.g., its size), the problem is impossible to solve
• Sketch: we can reduce the problem to the Ring-Size Counting problem, which is known to be impossible to solve in anonymous networks
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Required Knowledge
• We assume that each process knows a value B s.t.:
B < n ≤ 2B, where n is the number of processes
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Solution in a fault-free synchronous system
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Cycles
• Each process executes infinitely many cycles– The inputs of a cycle are a Boolean variable LE at each
process– Initially, the value of LE is randomly chosen – A cycle consists in computing a variable UNIQ at each
process which states if there is a unique process satisfying LE = true
• If yes, LE remains unchanged for each process• Otherwise, each LE variable is randomly reset
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Request
• Upon a request, a process waits the end of the cycle– If UNIQ = true, then the value of LE is the answer– Otherwise, the answer is delayed until (at least) the end
of the next cycle
• Aim: ensure that within almost surely finite time there is a unique process satisfying LE = true
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How to compute a cycle?
• Initially– The value of LE is randomly chosen by each process– UNIQ is set to false
• Each cycle is made of 3 phases• Each phase lasts 2B steps (2B > Diameter)• Each process has a local clock which takes value
in [0..6B-1] to know in which phase it is
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How to compute a cycle?
Phase 1 Phase 2 Phase 3
0 2B 4B 6B-1
One cycle
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How to compute a cycle?
• First Phase: compute a spanning forest s.t. – Each tree is rooted at a process such that LE = true– If no such process: no tree at the end of the phase
T
T
F
FFF
F
F F04/06/2014
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How to compute a cycle?
• First Phase: compute a spanning forest s.t. – Each tree is rooted at a process such that LE = true– If no such process: no tree at the end of the phase
T
T
F
FFF
F
F F04/06/2014
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How to compute a cycle?
• Second Phase: each root (if any) computes the number of nodes in its tree
ICDCN'2014, Coimbatore
T
T
F
FFF
F
F F
1
11
1
12
3
3 6
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How to compute a cycle?
• Second Phase: Each root (if any) computes the number of node in its tree
ICDCN'2014, Coimbatore
T
T
F
FFF
F
F F
1
11
1
12
3
3 6
At the end of the phase• If a root has more that B processes in its tree:
LE ← true; UNIQ ← true• In either cases, processes execute: LE ← false;
UNIQ ← false(Here, we choose B = 5)
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How to compute a cycle?
• Second Phase: Each root (if any) computes the number of node in its tree
ICDCN'2014, Coimbatore
T
F
F
FFF
F
F F
F,1
F,1 F,1
F,1
F,1F,2
F,3
F,3 T,6
At the end of the phase• If one root has more that B processes in its
tree: LE ← true; UNIQ ← true• In either cases, processes execute: LE ← false;
UNIQ ← false(Here, we choose B = 5)
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How to compute a cycle?
• Second Phase: Each root (if any) computes the number of node in its tree
ICDCN'2014, Coimbatore
T
F
F
FFF
F
F F
F,1
F,1 F,1
F,1
F,1F,2
F,3
F,3 T,6
Remark: at most one process can satisfy the first case because B ≥ n/2
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How to compute a cycle?
• Third Phase: broadcast of the result– Each process computes the disjunction of all the
UNIQ variables
ICDCN'2014, CoimbatoreICDCN'2014, Coimbatore
T
F
F
FFF
F
F F
F,1
F,1 F,1
F,1
F,1F,2
F,3
F,3 T,6
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How to compute a cycle?
• Third Phase: broadcast of the result– Each process computes the disjunction of all the
UNIQ variables
ICDCN'2014, CoimbatoreICDCN'2014, Coimbatore
T
F
F
FFF
F
F F
F,1
F,1 T,1
T,1
F,1T,2
F,3
T,3 T,6
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How to compute a cycle?
• Third Phase: broadcast of the result– Each process computes the disjunction of all the
UNIQ variables
ICDCN'2014, CoimbatoreICDCN'2014, Coimbatore
T
F
F
FFF
F
F F
T,1
T,1 T,1
T,1
T,1T,2
T,3
T,3 T,6
04/06/2014
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How to compute a cycle?
• Third Phase: broadcast of the result– Each process computes the disjunction of all the
UNIQ variables
ICDCN'2014, CoimbatoreICDCN'2014, Coimbatore
T
F
F
FFF
F
F F
T,1
T,1 T,1
T,1
T,1T,2
T,3
T,3 T,6
At the end of the cycle, UNIQ = true at a process IFF there a unique process such that LE = true
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How to compute a cycle?
• Third Phase: broadcast of the result– Each process computes the disjunction of all the
UNIQ variables
ICDCN'2014, CoimbatoreICDCN'2014, Coimbatore
T
F
F
FFF
F
F F
T,1
T,1 T,1
T,1
T,1T,2
T,3
T,3 T,6
At the beginning of the next cycle:• LE is randomly reset if UNIQ = false
• W.p.p. a process will be elected in the next cycle
• Otherwise LE remains constant• UNIQ is reset to false for each process
At the end of the cycle, UNIQ = true at a process IFF there a unique process such that LE = true
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Complexity
• The complexity depends on the probability law we use each time we (re)set LE
• We compute that the best choice is to (re)set LE to true with probability p [1/2B,1/(B+1)]∈
• In this case, the expected number of cycles to “stabilize” the value of LE is e2/2 ≤ 3.70
• The expected time to give an answer to a request is then in 0(n)
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How to make this algorithm self-stabilizing?
• After faults, processes can be desynchronized
• Solution: use a phase clock algorithm [Boulinier et al,2004]
– Clocks synchronize in at most 6B steps– Then, the first cycle started at 6B steps will
correctly compute UNIQ!
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How to make this algorithm snap-stabilizing?
• The first cycle started at 6B steps will correctly compute UNIQ!
• For each request– A process first waits 6B steps (using a counter)– And only considers outputs of cycles started after these 6B steps– So, only outputs of correct cycles will be considered!– The answer LE will be output only when UNIQ = true at the end of
such a cycle
• The expected delay for each answer remains in 0(n)04/06/2014
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Overview of theasynchronous solution
• We use the self-stabilizing UNISON algorithm of [Boulinier et al, 2004] to emulate synchronous executions of cycles.– After stabilization, clocks differ from at most 1
• Using this algorithm, cycles ``synchronize’’ in 8B rounds
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Overview of theasynchronous solution
• We use a result from [Boulinier et al, 2008] to detect when cycles have stabilized:
If the clock of some process successively takes values u, u+1, … u+(2D+1), with ∀ i {1, …, 2∈ D+1}, u+i > 0, then every other process executes at least one step during that period
• Drawback: The expected delay for each answer is in 0(n2)
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Conclusion
• We introduced probabilistic snap-stabilization
• We proposed 2 probabilistic snap-stabilizing protocols for the guaranteed service leader election in anonymous networks– The first one assumes a synchronous scheduler, and its expected
time complexity is in O(n)– The second one assumes an asynchronous scheduler, and its
expected time complexity is in O(n2)
• These two expected times can be reduced to O(D) and O(Dn), respectively, if processes have the knowledge of the diameter D of the network.
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Thank you!04/06/2014