order optimal information spreading using algebraic gossipdhay/ind2011/16-18/avin.pdforder optimal...
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Order Optimal Information SpreadingUsing Algebraic Gossip
Chen Avin, Michael Borokhovich, Keren Censor-Hillel, Zvi Lotker
Department of Communication Systems Engineering, Ben-Gurion University of the Negev, Israel
Computer Science and Artificial Intelligence Laboratory, Massachusetts Institute of Technology, USA
Israeli Networking Day 2011
(To be presented in PODC11)
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Motivation
Wireless (sensor) networks and peer-to-peer networksneed efficient algorithms for information dissemination.In such networks, there is no central management entity,thus local, distributed algorithms are needed.Network Coding with gossip algorithms (a.k.a. AlgebraicGossip) will help us to achieve faster informationdissemination.We look at: k nodes want to disseminate their value to allother nodes in the network.
2/20
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Information Spreading - The k -Dissemination Problem
3/20
v1 v2
v3 v4
v5
v6
v7
v8
x1 = 5 x2 = 15
x3 = 10 x4 = 12
A network represented by a graph G(V ,E). V = v1, v2, . . . , vn
k ≤ n values x1, x2, . . . , xk need to be distributed to all nodes
A node knows only its neighbors
Limited messages size
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Gossip Algorithm – The Way Information is Spread
Gossip Algorithm:
1 Determines a communication partner(randomly) among neighbors.
Uniform gossip.Non uniform gossip.
2 Determines how the message is sent.
PUSH – a message is sent to the partner.PULL – a message is sent from the partner.EXCHANGE - PUSH and PULL.
4/20
In each round every node takes a gossip action
v1 v2
v3 v4
v5
v6
v7
v8
v1 v2
v3 v4
v5
v6
v7
v8v1 v2
v3 v4
v5
v6
v7
v8
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Gossip Algorithm – The Way Information is Spread
Gossip Algorithm:
1 Determines a communication partner(randomly) among neighbors.
Uniform gossip.Non uniform gossip.
2 Determines how the message is sent.
PUSH – a message is sent to the partner.PULL – a message is sent from the partner.EXCHANGE - PUSH and PULL.
4/20
In each round every node takes a gossip action
v1 v2
v3 v4
v5
v6
v7
v8
v1 v2
v3 v4
v5
v6
v7
v8
v1 v2
v3 v4
v5
v6
v7
v8
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Gossip Algorithm – The Way Information is Spread
Gossip Algorithm:
1 Determines a communication partner(randomly) among neighbors.
Uniform gossip.Non uniform gossip.
2 Determines how the message is sent.PUSH – a message is sent to the partner.PULL – a message is sent from the partner.EXCHANGE - PUSH and PULL.
4/20
In each round every node takes a gossip action
v1 v2
v3 v4
v5
v6
v7
v8v1 v2
v3 v4
v5
v6
v7
v8
v1 v2
v3 v4
v5
v6
v7
v8
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Algebraic Gossip is Based on Random Linear Network Coding
Nodes (routers) can manipulate packets.All operations are in a field F so messages size is (almost)the same in both cases.
5/20
instead of sending randomly chosen values...
every message – a single value: msg = xi
v1 v2
v3 v4
v5
v6
v7
v8
x5
x4
x3
nodes send random linear combinations
every message – linear equation: msg =∑
ai xi
v1 v2
v3 v4
v5
v6
v7
v8
5x5+ 2x3
+ 7x1
3x4 + 4x1
6x3+ x4
+ 8x2
nodes send random linear combinations
every message – linear equation
v1 v2
v3 v4
v5
v6
v7
v8
5x5+ 2x3
+ 7x1
3x4 + 4x1
6x3+ x4
+ 8x2
linear equations are stored in a matrix form:
4 3 7 62 0 0 71 1 0 00 2 1 5
·
x1x2x3x4
=
22457830
once a node has rank k – it finishes
only helpful messages are stored
messages that increase the rank of the matrix
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Algebraic Gossip is Based on Random Linear Network Coding
Nodes (routers) can manipulate packets.All operations are in a field F so messages size is (almost)the same in both cases.
5/20
instead of sending randomly chosen values...
every message – a single value: msg = xi
v1 v2
v3 v4
v5
v6
v7
v8
x5
x4
x3
nodes send random linear combinations
every message – linear equation: msg =∑
ai xi
v1 v2
v3 v4
v5
v6
v7
v8
5x5+ 2x3
+ 7x1
3x4 + 4x1
6x3+ x4
+ 8x2
nodes send random linear combinations
every message – linear equation
v1 v2
v3 v4
v5
v6
v7
v8
5x5+ 2x3
+ 7x1
3x4 + 4x1
6x3+ x4
+ 8x2
linear equations are stored in a matrix form:
4 3 7 62 0 0 71 1 0 00 2 1 5
·
x1x2x3x4
=
22457830
once a node has rank k – it finishes
only helpful messages are stored
messages that increase the rank of the matrix
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Algebraic Gossip is Based on Random Linear Network Coding
Nodes (routers) can manipulate packets.All operations are in a field F so messages size is (almost)the same in both cases.
5/20
instead of sending randomly chosen values...
every message – a single value: msg = xi
v1 v2
v3 v4
v5
v6
v7
v8
x5
x4
x3
nodes send random linear combinations
every message – linear equation: msg =∑
ai xi
v1 v2
v3 v4
v5
v6
v7
v8
5x5+ 2x3
+ 7x1
3x4 + 4x1
6x3+ x4
+ 8x2
nodes send random linear combinations
every message – linear equation
v1 v2
v3 v4
v5
v6
v7
v8
5x5+ 2x3
+ 7x1
3x4 + 4x1
6x3+ x4
+ 8x2
linear equations are stored in a matrix form:
4 3 7 62 0 0 71 1 0 00 2 1 5
·
x1x2x3x4
=
22457830
once a node has rank k – it finishes
only helpful messages are stored
messages that increase the rank of the matrix
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Algebraic Gossip is Based on Random Linear Network Coding
Nodes (routers) can manipulate packets.All operations are in a field F so messages size is (almost)the same in both cases.
5/20
instead of sending randomly chosen values...
every message – a single value: msg = xi
v1 v2
v3 v4
v5
v6
v7
v8
x5
x4
x3
nodes send random linear combinations
every message – linear equation: msg =∑
ai xi
v1 v2
v3 v4
v5
v6
v7
v8
5x5+ 2x3
+ 7x1
3x4 + 4x1
6x3+ x4
+ 8x2
nodes send random linear combinations
every message – linear equation
v1 v2
v3 v4
v5
v6
v7
v8
5x5+ 2x3
+ 7x1
3x4 + 4x1
6x3+ x4
+ 8x2
linear equations are stored in a matrix form:
4 3 7 62 0 0 71 1 0 00 2 1 5
·
x1x2x3x4
=
22457830
once a node has rank k – it finishes
only helpful messages are stored
messages that increase the rank of the matrix
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Algebraic Gossip is Based on Random Linear Network Coding
Nodes (routers) can manipulate packets.All operations are in a field F so messages size is (almost)the same in both cases.
5/20
instead of sending randomly chosen values...
every message – a single value: msg = xi
v1 v2
v3 v4
v5
v6
v7
v8
x5
x4
x3
nodes send random linear combinations
every message – linear equation: msg =∑
ai xi
v1 v2
v3 v4
v5
v6
v7
v8
5x5+ 2x3
+ 7x1
3x4 + 4x1
6x3+ x4
+ 8x2
nodes send random linear combinations
every message – linear equation
v1 v2
v3 v4
v5
v6
v7
v8
5x5+ 2x3
+ 7x1
3x4 + 4x1
6x3+ x4
+ 8x2
linear equations are stored in a matrix form:
4 3 7 62 0 0 71 1 0 00 2 1 5
·
x1x2x3x4
=
22457830
once a node has rank k – it finishes
only helpful messages are stored
messages that increase the rank of the matrix
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
So, Why Algebraic Gossip is Faster?
6/20
A B[x1, x2, x3, . . . xk ] [x1, x2=?, x3, . . . xk ]
Without Algebraic Gossip (Random Message Selection)
A has all values B is missing one value
A is sending a randomly chosen value
msg = [xi ]
A B
Pr (helpful) = 1k
[x1, x2, x3, . . . xk ] [x1, x2=?, x3, . . . xk ]
Without Algebraic Gossip (Random Message Selection)
A has all values B is missing one value
A is sending a randomly chosen value
msg = [xi ]
A B
Pr (helpful) = 1k
[x1, x2, x3, . . . xk ] [x1, x2=?, x3, . . . xk ]
Without Algebraic Gossip (Random Message Selection)
A has all values B is missing one value
A is sending a randomly chosen value
msg = [xi ]
A B
rank k
rank k − 1
With Algebraic Gossip (Random Linear Equations)
A has k independent equations B has k − 1 independent equations
A is sending a random linear equation
msg =[∑
ai xi
], ai ∈ Fq
A B
Pr (helpful) = 1− 1q
rank k
rank k − 1
With Algebraic Gossip (Random Linear Equations)
A has k independent equations B has k − 1 independent equations
A is sending a random linear equation
msg =[∑
ai xi
], ai ∈ Fq
Pr (helpful) = qk−qk−1
qk = 1− 1q
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
So, Why Algebraic Gossip is Faster?
6/20
A B[x1, x2, x3, . . . xk ] [x1, x2=?, x3, . . . xk ]
Without Algebraic Gossip (Random Message Selection)
A has all values B is missing one value
A is sending a randomly chosen value
msg = [xi ]
A B
Pr (helpful) = 1k
[x1, x2, x3, . . . xk ] [x1, x2=?, x3, . . . xk ]
Without Algebraic Gossip (Random Message Selection)
A has all values B is missing one value
A is sending a randomly chosen value
msg = [xi ]
A B
Pr (helpful) = 1k
[x1, x2, x3, . . . xk ] [x1, x2=?, x3, . . . xk ]
Without Algebraic Gossip (Random Message Selection)
A has all values B is missing one value
A is sending a randomly chosen value
msg = [xi ]
A B
rank k
rank k − 1
With Algebraic Gossip (Random Linear Equations)
A has k independent equations B has k − 1 independent equations
A is sending a random linear equation
msg =[∑
ai xi
], ai ∈ Fq
A B
Pr (helpful) = 1− 1q
rank k
rank k − 1
With Algebraic Gossip (Random Linear Equations)
A has k independent equations B has k − 1 independent equations
A is sending a random linear equation
msg =[∑
ai xi
], ai ∈ Fq
Pr (helpful) = qk−qk−1
qk = 1− 1q
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
So, Why Algebraic Gossip is Faster?
6/20
A B[x1, x2, x3, . . . xk ] [x1, x2=?, x3, . . . xk ]
Without Algebraic Gossip (Random Message Selection)
A has all values B is missing one value
A is sending a randomly chosen value
msg = [xi ]
A B
Pr (helpful) = 1k
[x1, x2, x3, . . . xk ] [x1, x2=?, x3, . . . xk ]
Without Algebraic Gossip (Random Message Selection)
A has all values B is missing one value
A is sending a randomly chosen value
msg = [xi ]
A B
Pr (helpful) = 1k
[x1, x2, x3, . . . xk ] [x1, x2=?, x3, . . . xk ]
Without Algebraic Gossip (Random Message Selection)
A has all values B is missing one value
A is sending a randomly chosen value
msg = [xi ]
A B
rank k
rank k − 1
With Algebraic Gossip (Random Linear Equations)
A has k independent equations B has k − 1 independent equations
A is sending a random linear equation
msg =[∑
ai xi
], ai ∈ Fq
A B
Pr (helpful) = 1− 1q
rank k
rank k − 1
With Algebraic Gossip (Random Linear Equations)
A has k independent equations B has k − 1 independent equations
A is sending a random linear equation
msg =[∑
ai xi
], ai ∈ Fq
Pr (helpful) = qk−qk−1
qk = 1− 1q
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
So, Why Algebraic Gossip is Faster?
6/20
A B[x1, x2, x3, . . . xk ] [x1, x2=?, x3, . . . xk ]
Without Algebraic Gossip (Random Message Selection)
A has all values B is missing one value
A is sending a randomly chosen value
msg = [xi ]
A B
Pr (helpful) = 1k
[x1, x2, x3, . . . xk ] [x1, x2=?, x3, . . . xk ]
Without Algebraic Gossip (Random Message Selection)
A has all values B is missing one value
A is sending a randomly chosen value
msg = [xi ]
A B
Pr (helpful) = 1k
[x1, x2, x3, . . . xk ] [x1, x2=?, x3, . . . xk ]
Without Algebraic Gossip (Random Message Selection)
A has all values B is missing one value
A is sending a randomly chosen value
msg = [xi ]
A B
rank k
rank k − 1
With Algebraic Gossip (Random Linear Equations)
A has k independent equations B has k − 1 independent equations
A is sending a random linear equation
msg =[∑
ai xi
], ai ∈ Fq
A B
Pr (helpful) = 1− 1q
rank k
rank k − 1
With Algebraic Gossip (Random Linear Equations)
A has k independent equations B has k − 1 independent equations
A is sending a random linear equation
msg =[∑
ai xi
], ai ∈ Fq
Pr (helpful) = qk−qk−1
qk = 1− 1q
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
So, Why Algebraic Gossip is Faster?
6/20
A B[x1, x2, x3, . . . xk ] [x1, x2=?, x3, . . . xk ]
Without Algebraic Gossip (Random Message Selection)
A has all values B is missing one value
A is sending a randomly chosen value
msg = [xi ]
A B
Pr (helpful) = 1k
[x1, x2, x3, . . . xk ] [x1, x2=?, x3, . . . xk ]
Without Algebraic Gossip (Random Message Selection)
A has all values B is missing one value
A is sending a randomly chosen value
msg = [xi ]
A B
Pr (helpful) = 1k
[x1, x2, x3, . . . xk ] [x1, x2=?, x3, . . . xk ]
Without Algebraic Gossip (Random Message Selection)
A has all values B is missing one value
A is sending a randomly chosen value
msg = [xi ]
A B
rank k
rank k − 1
With Algebraic Gossip (Random Linear Equations)
A has k independent equations B has k − 1 independent equations
A is sending a random linear equation
msg =[∑
ai xi
], ai ∈ Fq
A B
Pr (helpful) = 1− 1q
rank k
rank k − 1
With Algebraic Gossip (Random Linear Equations)
A has k independent equations B has k − 1 independent equations
A is sending a random linear equation
msg =[∑
ai xi
], ai ∈ Fq
Pr (helpful) = qk−qk−1
qk = 1− 1q
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Research Goal – Optimal Protocol for k -Dissemination Problem
1. Analyze uniform algebraic gossip for k -disseminationIs it optimal?For which graphs?
2. Study non-uniform gossip to achieve optimalk -dissemination
7/20
v1 v2
v3 v4
v5
v6
v7
v8
x1 = 5 x2 = 15
x3 = 10 x4 = 12
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Related Work on Algebraic Gossip
Trivial lower bound – Ω(k), kn messages needed to be deliveredso k rounds.
[Deb et al., 2006] – (almost) Tight bound for the complete graph.Θ(k), for k ln3 n. (push/pull)
[Mosk-Aoyama and Shah, 2006] – n-dissemination. Upperbound for arbitrary graphs, based on conductance measure.The bound is not tight. For complete graph: O(n log n), for Ring:O(n2).
[BAL. ISIT10] – n-dissemination. Upper bound for any graph:O(∆n). Tight bound of Θ(n) for constant degree graphs. Worstcase graph for algebraic gossip (barbell): Ω(n2).
Open question: What graph property capture the stopping time?
8/20
v uv uw
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Related Work on Algebraic Gossip
Trivial lower bound – Ω(k), kn messages needed to be deliveredso k rounds.
[Deb et al., 2006] – (almost) Tight bound for the complete graph.Θ(k), for k ln3 n. (push/pull)
[Mosk-Aoyama and Shah, 2006] – n-dissemination. Upperbound for arbitrary graphs, based on conductance measure.The bound is not tight. For complete graph: O(n log n), for Ring:O(n2).
[BAL. ISIT10] – n-dissemination. Upper bound for any graph:O(∆n). Tight bound of Θ(n) for constant degree graphs. Worstcase graph for algebraic gossip (barbell): Ω(n2).
Open question: What graph property capture the stopping time?
8/20
v uv uw
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Related Work on Algebraic Gossip
Trivial lower bound – Ω(k), kn messages needed to be deliveredso k rounds.
[Deb et al., 2006] – (almost) Tight bound for the complete graph.Θ(k), for k ln3 n. (push/pull)
[Mosk-Aoyama and Shah, 2006] – n-dissemination. Upperbound for arbitrary graphs, based on conductance measure.The bound is not tight. For complete graph: O(n log n), for Ring:O(n2).
[BAL. ISIT10] – n-dissemination. Upper bound for any graph:O(∆n). Tight bound of Θ(n) for constant degree graphs. Worstcase graph for algebraic gossip (barbell): Ω(n2).
Open question: What graph property capture the stopping time?
8/20
v uv uw
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Related Work on Algebraic Gossip
Trivial lower bound – Ω(k), kn messages needed to be deliveredso k rounds.
[Deb et al., 2006] – (almost) Tight bound for the complete graph.Θ(k), for k ln3 n. (push/pull)
[Mosk-Aoyama and Shah, 2006] – n-dissemination. Upperbound for arbitrary graphs, based on conductance measure.The bound is not tight. For complete graph: O(n log n), for Ring:O(n2).
[BAL. ISIT10] – n-dissemination. Upper bound for any graph:O(∆n). Tight bound of Θ(n) for constant degree graphs. Worstcase graph for algebraic gossip (barbell): Ω(n2).
Open question: What graph property capture the stopping time?
8/20
v u
v uw
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Related Work on Algebraic Gossip
Trivial lower bound – Ω(k), kn messages needed to be deliveredso k rounds.
[Deb et al., 2006] – (almost) Tight bound for the complete graph.Θ(k), for k ln3 n. (push/pull)
[Mosk-Aoyama and Shah, 2006] – n-dissemination. Upperbound for arbitrary graphs, based on conductance measure.The bound is not tight. For complete graph: O(n log n), for Ring:O(n2).
[BAL. ISIT10] – n-dissemination. Upper bound for any graph:O(∆n). Tight bound of Θ(n) for constant degree graphs. Worstcase graph for algebraic gossip (barbell): Ω(n2).
Open question: What graph property capture the stopping time?
8/20
v uv uw
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Related Work on Algebraic Gossip
[Haeupler. STOC11] – k -dissemination. Conductance andexpansion based arguments. Two parameters: γ and λ.
Tight bound for the case k = Ω(n): Θ(n/γ)
For k < o(n): O(k/γ + log2 n/λ). The bound is not tight fore.g., line: O(k + n log2 n), grid: O(k +
√n log2 n), binary
tree: O(k + n log2 n)Gave also results for dynamic networks
9/20
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
1st Result: k -Dissemination With Uniform Algebraic Gossip
Theorem 1For any graph with n nodes, diameter D, and maximumdegree ∆, stopping time of uniform algebraic gossip isO(∆(k + log n + D)) with high probability.
Corollary 1For any graph with n nodes and with constant maximumdegree, stopping time of uniform algebraic gossip is Θ(k + D)in the synchronous time model.
Tight for e.g., Line, Cycle, Grids, Binary Trees, etc.
The result holds for any gossip variation: Push, Pull, Exchange.
When does the uniform algebraic gossip perform bad? e.g.,Ω(kn) for a barbell graph.
10/20
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
1st Result: k -Dissemination With Uniform Algebraic Gossip
Theorem 1For any graph with n nodes, diameter D, and maximumdegree ∆, stopping time of uniform algebraic gossip isO(∆(k + log n + D)) with high probability.
Corollary 1For any graph with n nodes and with constant maximumdegree, stopping time of uniform algebraic gossip is Θ(k + D)in the synchronous time model.
Tight for e.g., Line, Cycle, Grids, Binary Trees, etc.
The result holds for any gossip variation: Push, Pull, Exchange.
When does the uniform algebraic gossip perform bad? e.g.,Ω(kn) for a barbell graph.
10/20
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
1st Result: k -Dissemination With Uniform Algebraic Gossip
Theorem 1For any graph with n nodes, diameter D, and maximumdegree ∆, stopping time of uniform algebraic gossip isO(∆(k + log n + D)) with high probability.
Corollary 1For any graph with n nodes and with constant maximumdegree, stopping time of uniform algebraic gossip is Θ(k + D)in the synchronous time model.
Tight for e.g., Line, Cycle, Grids, Binary Trees, etc.
The result holds for any gossip variation: Push, Pull, Exchange.
When does the uniform algebraic gossip perform bad? e.g.,Ω(kn) for a barbell graph.
10/20
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
1st Result: k -Dissemination With Uniform Algebraic Gossip
Theorem 1For any graph with n nodes, diameter D, and maximumdegree ∆, stopping time of uniform algebraic gossip isO(∆(k + log n + D)) with high probability.
Corollary 1For any graph with n nodes and with constant maximumdegree, stopping time of uniform algebraic gossip is Θ(k + D)in the synchronous time model.
Tight for e.g., Line, Cycle, Grids, Binary Trees, etc.
The result holds for any gossip variation: Push, Pull, Exchange.
When does the uniform algebraic gossip perform bad? e.g.,Ω(kn) for a barbell graph.
10/20
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
1st Result: k -Dissemination With Uniform Algebraic Gossip
Theorem 1For any graph with n nodes, diameter D, and maximumdegree ∆, stopping time of uniform algebraic gossip isO(∆(k + log n + D)) with high probability.
Corollary 1For any graph with n nodes and with constant maximumdegree, stopping time of uniform algebraic gossip is Θ(k + D)in the synchronous time model.
Tight for e.g., Line, Cycle, Grids, Binary Trees, etc.
The result holds for any gossip variation: Push, Pull, Exchange.
When does the uniform algebraic gossip perform bad? e.g.,Ω(kn) for a barbell graph.
10/20
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
2nd Result: k -Dissemination With TAG
Construct a spanning tree of thegraph using some gossip spanningtree protocol S.
The stopping time of S is t(S),and the diameter of the spanningtree is d(S).Spanning tree can be constructed e.g., by a randomizebroadcast protocol, or more sophisticated method.
Once the tree is constructed, every node knows its parent.
Perform algebraic gossip, where every node uses a singlecommunication partner – its parent.Notice, we have here non-uniform algebraic gossip.
11/20
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
2nd Result: k -Dissemination With TAG
Construct a spanning tree of thegraph using some gossip spanningtree protocol S.
The stopping time of S is t(S),and the diameter of the spanningtree is d(S).
Spanning tree can be constructed e.g., by a randomizebroadcast protocol, or more sophisticated method.
Once the tree is constructed, every node knows its parent.
Perform algebraic gossip, where every node uses a singlecommunication partner – its parent.Notice, we have here non-uniform algebraic gossip.
11/20
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
2nd Result: k -Dissemination With TAG
Construct a spanning tree of thegraph using some gossip spanningtree protocol S.
The stopping time of S is t(S),and the diameter of the spanningtree is d(S).Spanning tree can be constructed e.g., by a randomizebroadcast protocol, or more sophisticated method.
Once the tree is constructed, every node knows its parent.
Perform algebraic gossip, where every node uses a singlecommunication partner – its parent.Notice, we have here non-uniform algebraic gossip.
11/20
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
2nd Result: k -Dissemination With TAG
Construct a spanning tree of thegraph using some gossip spanningtree protocol S.
The stopping time of S is t(S),and the diameter of the spanningtree is d(S).Spanning tree can be constructed e.g., by a randomizebroadcast protocol, or more sophisticated method.
Once the tree is constructed, every node knows its parent.
Perform algebraic gossip, where every node uses a singlecommunication partner – its parent.Notice, we have here non-uniform algebraic gossip.
11/20
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
2nd Result: k -Dissemination With TAG
Construct a spanning tree of thegraph using some gossip spanningtree protocol S.
The stopping time of S is t(S),and the diameter of the spanningtree is d(S).Spanning tree can be constructed e.g., by a randomizebroadcast protocol, or more sophisticated method.
Once the tree is constructed, every node knows its parent.
Perform algebraic gossip, where every node uses a singlecommunication partner – its parent.Notice, we have here non-uniform algebraic gossip.
11/20
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
2nd Result: k -Dissemination With TAG
Theorem 2For any graph with n nodes,stopping time of TAG protocol is O(k + log n + d(S) + t(S))with high probability, where:t(S) – stopping time of the gossip spanning tree protocol S.d(S) – diameter of the spanning tree created by S.
Corollary 2
For any graph with n nodes, and for k = Ω(k),TAG protocol is order optimal for k -dissemination task, i.e.,the stopping time is Θ(n) with high probability.
12/20
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
2nd Result: k -Dissemination With TAG
Theorem 2For any graph with n nodes,stopping time of TAG protocol is O(k + log n + d(S) + t(S))with high probability, where:t(S) – stopping time of the gossip spanning tree protocol S.d(S) – diameter of the spanning tree created by S.
Corollary 2
For any graph with n nodes, and for k = Ω(k),TAG protocol is order optimal for k -dissemination task, i.e.,the stopping time is Θ(n) with high probability.
12/20
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Proof Overview
13/20
k -dissemination with uniform algebraic gossip
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Proof Overview – Converting a Graph to a System of Queues
14/20
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆ (1− 1
q )
x1 x2
x3 x4
x5
x6
initial graph with an arbitrary node v4
when v4 will finish the protocol?
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
BFS spanning tree rooted at v4
we ignore the messages coming from other edges
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
customers are helpful messages
initially, some nodes have helpful messages
customer arriving at some node, increases its rank by 1
once v4 receives k helpful messages it finishes
in a given round, v5 wakes up exactly once
v5 chooses v6 as a partner w.p. ≥ 1∆
the message will be helpful w.p. ≥ (1− 1q )
service time is geometrically distributed with p
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Proof Overview – Converting a Graph to a System of Queues
14/20
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆ (1− 1
q )
x1 x2
x3 x4
x5
x6
initial graph with an arbitrary node v4
when v4 will finish the protocol?
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
BFS spanning tree rooted at v4
we ignore the messages coming from other edges
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
customers are helpful messages
initially, some nodes have helpful messages
customer arriving at some node, increases its rank by 1
once v4 receives k helpful messages it finishes
in a given round, v5 wakes up exactly once
v5 chooses v6 as a partner w.p. ≥ 1∆
the message will be helpful w.p. ≥ (1− 1q )
service time is geometrically distributed with p
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Proof Overview – Converting a Graph to a System of Queues
14/20
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆ (1− 1
q )
x1 x2
x3 x4
x5
x6
initial graph with an arbitrary node v4
when v4 will finish the protocol?
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
BFS spanning tree rooted at v4
we ignore the messages coming from other edges
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
customers are helpful messages
initially, some nodes have helpful messages
customer arriving at some node, increases its rank by 1
once v4 receives k helpful messages it finishes
in a given round, v5 wakes up exactly once
v5 chooses v6 as a partner w.p. ≥ 1∆
the message will be helpful w.p. ≥ (1− 1q )
service time is geometrically distributed with p
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Proof Overview – Converting a Graph to a System of Queues
14/20
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆ (1− 1
q )
x1 x2
x3 x4
x5
x6
initial graph with an arbitrary node v4
when v4 will finish the protocol?
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
BFS spanning tree rooted at v4
we ignore the messages coming from other edges
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
customers are helpful messages
initially, some nodes have helpful messages
customer arriving at some node, increases its rank by 1
once v4 receives k helpful messages it finishes
in a given round, v5 wakes up exactly once
v5 chooses v6 as a partner w.p. ≥ 1∆
the message will be helpful w.p. ≥ (1− 1q )
service time is geometrically distributed with p
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Proof Overview – Converting a Graph to a System of Queues
14/20
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆ (1− 1
q )
x1 x2
x3 x4
x5
x6
initial graph with an arbitrary node v4
when v4 will finish the protocol?
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
BFS spanning tree rooted at v4
we ignore the messages coming from other edges
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
customers are helpful messages
initially, some nodes have helpful messages
customer arriving at some node, increases its rank by 1
once v4 receives k helpful messages it finishes
in a given round, v5 wakes up exactly once
v5 chooses v6 as a partner w.p. ≥ 1∆
the message will be helpful w.p. ≥ (1− 1q )
service time is geometrically distributed with p
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Proof Overview – Converting a Graph to a System of Queues
14/20
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆ (1− 1
q )
x1 x2
x3 x4
x5
x6
initial graph with an arbitrary node v4
when v4 will finish the protocol?
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
BFS spanning tree rooted at v4
we ignore the messages coming from other edges
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
customers are helpful messages
initially, some nodes have helpful messages
customer arriving at some node, increases its rank by 1
once v4 receives k helpful messages it finishes
in a given round, v5 wakes up exactly once
v5 chooses v6 as a partner w.p. ≥ 1∆
the message will be helpful w.p. ≥ (1− 1q )
service time is geometrically distributed with p
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Proof Overview – Converting a Graph to a System of Queues
14/20
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆ (1− 1
q )
x1 x2
x3 x4
x5
x6
initial graph with an arbitrary node v4
when v4 will finish the protocol?
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
BFS spanning tree rooted at v4
we ignore the messages coming from other edges
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
customers are helpful messages
initially, some nodes have helpful messages
customer arriving at some node, increases its rank by 1
once v4 receives k helpful messages it finishes
in a given round, v5 wakes up exactly once
v5 chooses v6 as a partner w.p. ≥ 1∆
the message will be helpful w.p. ≥ (1− 1q )
service time is geometrically distributed with p
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Proof Overview – Converting a Graph to a System of Queues
14/20
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆ (1− 1
q )
x1 x2
x3 x4
x5
x6
initial graph with an arbitrary node v4
when v4 will finish the protocol?
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
BFS spanning tree rooted at v4
we ignore the messages coming from other edges
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
customers are helpful messages
initially, some nodes have helpful messages
customer arriving at some node, increases its rank by 1
once v4 receives k helpful messages it finishes
in a given round, v5 wakes up exactly once
v5 chooses v6 as a partner w.p. ≥ 1∆
the message will be helpful w.p. ≥ (1− 1q )
service time is geometrically distributed with p
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Proof Overview – Converting a Graph to a System of Queues
14/20
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆ (1− 1
q )
x1 x2
x3 x4
x5
x6
initial graph with an arbitrary node v4
when v4 will finish the protocol?
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
BFS spanning tree rooted at v4
we ignore the messages coming from other edges
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
customers are helpful messages
initially, some nodes have helpful messages
customer arriving at some node, increases its rank by 1
once v4 receives k helpful messages it finishes
in a given round, v5 wakes up exactly once
v5 chooses v6 as a partner w.p. ≥ 1∆
the message will be helpful w.p. ≥ (1− 1q )
service time is geometrically distributed with p
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Proof Overview – Converting a Graph to a System of Queues
14/20
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆ (1− 1
q )
x1 x2
x3 x4
x5
x6
initial graph with an arbitrary node v4
when v4 will finish the protocol?
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
BFS spanning tree rooted at v4
we ignore the messages coming from other edges
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
customers are helpful messages
initially, some nodes have helpful messages
customer arriving at some node, increases its rank by 1
once v4 receives k helpful messages it finishes
in a given round, v5 wakes up exactly once
v5 chooses v6 as a partner w.p. ≥ 1∆
the message will be helpful w.p. ≥ (1− 1q )
service time is geometrically distributed with p
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Proof Overview – Converting a Graph to a System of Queues
14/20
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥?
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆
x1 x2
x3 x4
x5
x6
v1 v2
v3 v4
v5
v6
v7
v8
p ≥ 1∆ (1− 1
q )
x1 x2
x3 x4
x5
x6
initial graph with an arbitrary node v4
when v4 will finish the protocol?
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
BFS spanning tree rooted at v4
we ignore the messages coming from other edges
v1 v2
v3 v4
v5
v6
v7
v8
x1 x2
x3
x4
x5
x6
customers are helpful messages
initially, some nodes have helpful messages
customer arriving at some node, increases its rank by 1
once v4 receives k helpful messages it finishes
in a given round, v5 wakes up exactly once
v5 chooses v6 as a partner w.p. ≥ 1∆
the message will be helpful w.p. ≥ (1− 1q )
service time is geometrically distributed with p
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Proof Overview – Exponential Servers Instead of Geometric
15/20
v1 v2
v3 v4
v5
v6
v7
v8
p
p
p
p
p
p
p
v1 v2
v3 v4
v5
v6
v7
v8
µ
µ
µ
µ
µ
µ
µ
µ = p
If X ∼ Geom(p), and Y ∼ Exp(p), then: Pr(Y > t) ≥ Pr(X > t)
so, exponential server is slower than geometric
we replace servers, thus increasing the stopping time
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Proof Overview – Exponential Servers Instead of Geometric
15/20
v1 v2
v3 v4
v5
v6
v7
v8
p
p
p
p
p
p
p
v1 v2
v3 v4
v5
v6
v7
v8
µ
µ
µ
µ
µ
µ
µ
µ = p
If X ∼ Geom(p), and Y ∼ Exp(p), then: Pr(Y > t) ≥ Pr(X > t)
so, exponential server is slower than geometric
we replace servers, thus increasing the stopping time
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Proof Overview – Exponential Servers Instead of Geometric
15/20
v1 v2
v3 v4
v5
v6
v7
v8
p
p
p
p
p
p
p
v1 v2
v3 v4
v5
v6
v7
v8
µ
µ
µ
µ
µ
µ
µ
µ = p
If X ∼ Geom(p), and Y ∼ Exp(p), then: Pr(Y > t) ≥ Pr(X > t)
so, exponential server is slower than geometric
we replace servers, thus increasing the stopping time
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Proof Overview – Exponential Servers Instead of Geometric
15/20
v1 v2
v3 v4
v5
v6
v7
v8
p
p
p
p
p
p
p
v1 v2
v3 v4
v5
v6
v7
v8
µ
µ
µ
µ
µ
µ
µ
µ = p
If X ∼ Geom(p), and Y ∼ Exp(p), then: Pr(Y > t) ≥ Pr(X > t)
so, exponential server is slower than geometric
we replace servers, thus increasing the stopping time
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Line is Slower Than Tree
16/20
v1 v2
v3 v4
v5
v6
v7
v8
µ
µ
µ
µ
µ
µ
µ
µ = p
v1 v2
v3 v4
v5
v6
v7
v8
µ
µ
µ
µ
µ
µ
µ
µ = p
v4µ µ µ
v4µ µ µλ
When does the
last customer
leave the system?
Reduce tree to line
Take all customers
out and use
Jackson theorem
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Line is Slower Than Tree
16/20
v1 v2
v3 v4
v5
v6
v7
v8
µ
µ
µ
µ
µ
µ
µ
µ = p
v1 v2
v3 v4
v5
v6
v7
v8
µ
µ
µ
µ
µ
µ
µ
µ = p
v4µ µ µ
v4µ µ µλ
When does the
last customer
leave the system?
Reduce tree to line
Take all customers
out and use
Jackson theorem
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Line is Slower Than Tree
16/20
v1 v2
v3 v4
v5
v6
v7
v8
µ
µ
µ
µ
µ
µ
µ
µ = p
v1 v2
v3 v4
v5
v6
v7
v8
µ
µ
µ
µ
µ
µ
µ
µ = p
v4µ µ µ
v4µ µ µλ
When does the
last customer
leave the system?
Reduce tree to line
Take all customers
out and use
Jackson theorem
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Line of D Queues
Jackson’s Theorem: If utilization at every queue is less than 1, the equilibrium state distribution of numberof customers in each queue exists and it is given by:
For state (k1, k2, . . . , kn), and utilization ρi =λiµi
: π(k1, k2, . . . , kn) =n∏
i=1
ρkii (1− ρi ).
By setting λ = µ/2, we obtain: ρ < 1.
We add dummy customers according to stationary distribution. So, the real customers see stationarydistribution.
Time by which all the customers enter the system is O((k + log n)/µ), since λ = µ/2, and log n is neededfor high probability.
Time to cross one MM1 queue in the stationary state is exponentially distributed with µ− λ = µ/2.
So, the time needed to cross D MM1 queues is O((d + log n)/µ), where log n is needed for high probability.
17/20
v4µ µ µλ = µ
2
v4µ µ µλ = µ
2
Last customer leaves after: O((k + log n + D)/µ) = O(∆(k + log n + D)) rounds
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Line of D Queues
Jackson’s Theorem: If utilization at every queue is less than 1, the equilibrium state distribution of numberof customers in each queue exists and it is given by:
For state (k1, k2, . . . , kn), and utilization ρi =λiµi
: π(k1, k2, . . . , kn) =n∏
i=1
ρkii (1− ρi ).
By setting λ = µ/2, we obtain: ρ < 1.
We add dummy customers according to stationary distribution. So, the real customers see stationarydistribution.
Time by which all the customers enter the system is O((k + log n)/µ), since λ = µ/2, and log n is neededfor high probability.
Time to cross one MM1 queue in the stationary state is exponentially distributed with µ− λ = µ/2.
So, the time needed to cross D MM1 queues is O((d + log n)/µ), where log n is needed for high probability.
17/20
v4µ µ µλ = µ
2
v4µ µ µλ = µ
2
Last customer leaves after: O((k + log n + D)/µ) = O(∆(k + log n + D)) rounds
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Line of D Queues
Jackson’s Theorem: If utilization at every queue is less than 1, the equilibrium state distribution of numberof customers in each queue exists and it is given by:
For state (k1, k2, . . . , kn), and utilization ρi =λiµi
: π(k1, k2, . . . , kn) =n∏
i=1
ρkii (1− ρi ).
By setting λ = µ/2, we obtain: ρ < 1.
We add dummy customers according to stationary distribution. So, the real customers see stationarydistribution.
Time by which all the customers enter the system is O((k + log n)/µ), since λ = µ/2, and log n is neededfor high probability.
Time to cross one MM1 queue in the stationary state is exponentially distributed with µ− λ = µ/2.
So, the time needed to cross D MM1 queues is O((d + log n)/µ), where log n is needed for high probability.
17/20
v4µ µ µλ = µ
2
v4µ µ µλ = µ
2
Last customer leaves after: O((k + log n + D)/µ) = O(∆(k + log n + D)) rounds
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Line of D Queues
Jackson’s Theorem: If utilization at every queue is less than 1, the equilibrium state distribution of numberof customers in each queue exists and it is given by:
For state (k1, k2, . . . , kn), and utilization ρi =λiµi
: π(k1, k2, . . . , kn) =n∏
i=1
ρkii (1− ρi ).
By setting λ = µ/2, we obtain: ρ < 1.
We add dummy customers according to stationary distribution. So, the real customers see stationarydistribution.
Time by which all the customers enter the system is O((k + log n)/µ), since λ = µ/2, and log n is neededfor high probability.
Time to cross one MM1 queue in the stationary state is exponentially distributed with µ− λ = µ/2.
So, the time needed to cross D MM1 queues is O((d + log n)/µ), where log n is needed for high probability.
17/20
v4µ µ µλ = µ
2
v4µ µ µλ = µ
2
Last customer leaves after: O((k + log n + D)/µ) = O(∆(k + log n + D)) rounds
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Line of D Queues
Jackson’s Theorem: If utilization at every queue is less than 1, the equilibrium state distribution of numberof customers in each queue exists and it is given by:
For state (k1, k2, . . . , kn), and utilization ρi =λiµi
: π(k1, k2, . . . , kn) =n∏
i=1
ρkii (1− ρi ).
By setting λ = µ/2, we obtain: ρ < 1.
We add dummy customers according to stationary distribution. So, the real customers see stationarydistribution.
Time by which all the customers enter the system is O((k + log n)/µ), since λ = µ/2, and log n is neededfor high probability.
Time to cross one MM1 queue in the stationary state is exponentially distributed with µ− λ = µ/2.
So, the time needed to cross D MM1 queues is O((d + log n)/µ), where log n is needed for high probability.
17/20
v4µ µ µλ = µ
2
v4µ µ µλ = µ
2
Last customer leaves after: O((k + log n + D)/µ) = O(∆(k + log n + D)) rounds
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Line of D Queues
Jackson’s Theorem: If utilization at every queue is less than 1, the equilibrium state distribution of numberof customers in each queue exists and it is given by:
For state (k1, k2, . . . , kn), and utilization ρi =λiµi
: π(k1, k2, . . . , kn) =n∏
i=1
ρkii (1− ρi ).
By setting λ = µ/2, we obtain: ρ < 1.
We add dummy customers according to stationary distribution. So, the real customers see stationarydistribution.
Time by which all the customers enter the system is O((k + log n)/µ), since λ = µ/2, and log n is neededfor high probability.
Time to cross one MM1 queue in the stationary state is exponentially distributed with µ− λ = µ/2.
So, the time needed to cross D MM1 queues is O((d + log n)/µ), where log n is needed for high probability.
17/20
v4µ µ µλ = µ
2
v4µ µ µλ = µ
2
Last customer leaves after: O((k + log n + D)/µ) = O(∆(k + log n + D)) rounds
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Proof Overview
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k -dissemination with TAGTree-Based Algebraic Gossip
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
TAG – Tree Based Algebraic Gossip Protocol
The proof is also based on analyzing a tree network of queues
The uniform gossip bound is
O(∆(k + log n + D))
The TAG based bound is:
O(t(S) + k + log n + d(S))
In the synchronous time model t(B) ≥ d(B). (B is a broadcastthat builds a tree)
For Round Robin Broadcast, t(BRR) = O(n) so for k = Ω(n) thestopping time of TAG is Θ(n)
19/20
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Summary
When does uniform algebraic gossip is order optimal?
In graphs with constant maximum degreeBut not only, e.g., complete graph. so when exactly?
When does TAG is order optimal?
When k = Ω(n)In graphs with large weak conductance (see paper)When else? What spanning algorithm to use?
Thank you!
20/20
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Summary
When does uniform algebraic gossip is order optimal?
In graphs with constant maximum degreeBut not only, e.g., complete graph. so when exactly?
When does TAG is order optimal?
When k = Ω(n)In graphs with large weak conductance (see paper)When else? What spanning algorithm to use?
Thank you!
20/20
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Summary
When does uniform algebraic gossip is order optimal?
In graphs with constant maximum degreeBut not only, e.g., complete graph. so when exactly?
When does TAG is order optimal?
When k = Ω(n)In graphs with large weak conductance (see paper)When else? What spanning algorithm to use?
Thank you!
20/20
Introduction Algebraic Gossip Research Goal Related Work Our Results Summary
Deb, S., Médard, M., and Choute, C. (2006).Algebraic gossip: a network coding approach to optimalmultiple rumor mongering.IEEE Transactions on Information Theory,52(6):2486–2507.
Mosk-Aoyama, D. and Shah, D. (2006).Information dissemination via network coding.In ISIT, pages 1748–1752.
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