Distributed MST for Constant Diameter Graphs Zvi Lotker & Boaz Patt-Shamir & David Peleg.

Distributed MST for Constant Diameter Graphs

Zvi Lotker & Boaz Patt-Shamir & David Peleg

Model and Notation G(V,E) is the network Each vertex has a unique name Each edge has a weight Vertices communicate only by edges The communication is synchronous Exactly B bits are sent at each time

step D is the diameter of the graph

Related work If B= then O(D) [N. Linial 92] If B=O(log(n)) communication optimal

required O(n•log(n)) and O(n) time [GHS83] and [A87] respectively

O(D+n0.613 • log*(n)), O(D+n0.5 • log*(n)) [GKP98], [KP98] respectively

(n0.5/(B•log(n))) [PR00]

Our results lower bound There exists a family of graphs

with diameter 4 s.t ((n1/3)/B) There exists a family of graphs

with diameter 3 s.t ((n1/4)/(B0.5)) The lower bound holds for

randomized algorithms

Our results graph with diameter 2

O(log n) time units suffice to compute an MST for graphs with diameter 2

The mailing problem [PR00] mail(G,s,r,b)

G(V,E) s,rV We wish to send x1, x2,… xb bits

from s to r We denote the worst-case time

complexity of algorithm A by TA(G,s,r,b)

The mailing problem Exmpal mail(Pn,s,r,b)

TA(Pn,s,r,b)>b

s r

t=1


TA(Pn,s,r,b)>b

s r

t=2


TA(Pn,s,r,b)>b

s r

t=3


TA(Pn,s,r,b)>b

s r

t=4


TA(Pn,s,r,b)>b

s r

t=5


TA(Pn,s,r,b)>b

s r

t=6


TA(Pn,s,r,b)>b

s r

t=7


TA(Pn,s,r,b)>b

s r

t=8

TA(Pn,s,r,b)=n+b

Diameter 4 graphs

c

v2,m2+1 v3,m2+1

s=v1,m2+1 r=vm,m2+1

v1,1 v2,1 v3,1 vm,1

v1,2 v2,2 v3,2 vm,2

v2,m2 v3,m2 vm,m2

Diameter 4 graphs For all m> 2, the number of nodes is

m^3+m+1 and the diameter is 4c

v2,m2+1 v3,m2+1

s=v1,m2+1 r=vm,m2+1

v1,1 v2,1 v3,1 vm,1

v1,2 v2,2 v3,2 vm,2

v2,m2 v3,m2 vm,m2

Diameter 4 graphs

v1,1 v2,1 v3,1 vm,1

v1,2 v2,2 v3,2 vm,2

v2,m2 v3,m2 vm,m2

s=v1,m2+1

v2,m2+1 v3,m2+1

r=vm,m2+1

c

268

m+2

Diameter 4 graphs For any time t<m the number of

bits delivered at r by time t is at most t•m•B

v1,1 v2,1 v3,1 vm,1

v1,2 v2,2 v3,2 vm,2

v2,m2 v3,m2 vm,m2

s=v1,m2+1

v2,m2+1 v3,m2+1

r=vm,m2+1

c

Diameter 4 graphs For any time t<m the number of

bits delivered at r by time t is at most t•m•B

For any correct mailing algorithm A, any m> 2 and any m^2 bit input string X, we have TA(hm,s,r,X)> m/B. t•m•B>m^2t>m/b

Diameter 4 graphsFrom mailing to MST

0

1,3

2

z1

z2z3

r=zm

km

Diameter 3 graphs For all m> 2, the number of nodes

is m^4+m+1 and the diameter is 3

v1,1 v2,1 v3,1 vm,1

v1,2 v2,2 v3,2 vm,2

v2,m3

v1,m3

v3,m3

vm,m3

s

Diameter 3 graphs

v1,1 v2,1 v3,1 vm,1

v1,2 v2,2 v3,2 vm,2

v2,m3

v1,m3

v3,m3

vm,m3

z1

z2z3

r=zms

km

24

m+2

Diameter 3 graphs

v1,1 v2,1 v3,1 vm,1

v1,2 v2,2 v3,2 vm,2

v2,m3

v1,m3

v3,m3

vm,m3

z1

z2z3

r=zms

kmM4

Diameter 3 graphs

v1,1 v2,1 v3,1 vm,1

v1,2 v2,2 v3,2 vm,2

v2,m3

v1,m3

v3,m3

vm,m3

z1

z2z3

r=zms

km

Diameter 3 graphs

v1,1 v2,1 v3,1 vm,1

v1,2 v2,2 v3,2 vm,2

v2,m3

v1,m3

v3,m3

vm,m3

z1

z2z3

r=zms

km

For any t<m, new bits that arrive at C enter only at nodes zi with 1 i t.

Diameter 3 graphs For t< m, the number of bits arriving at

r by time t is less than t^2mB/2.

v1,1 v2,1 v3,1 vm,1

v1,2 v2,2 v3,2 vm,2

v2,m3

v1,m3

v3,m3

vm,m3

z1

z2z3

r=zms

km

If for some probability distribution over the inputs the expected cost for all deterministic algorithms is at least C,

then for any randomized algorithm there exists an input with expected complexity at least C.

The minimax principle [Yao 77]

Segmented minima D=2 For each vV we have segment

number f(v) and value a(v) The task of segmented minima is

to compute b(v)= min{ a(v):f(v)=f(u)}

Solving Segmented minima Lemma: Segmented minima can be

computed in 2 steps in the B model,1. Send (f(v),a(v)) to all neighbors2. Send to each neighbor u the minimal

value received from u 's segment3. Set b(v) to be the minimum of all

values received in the second step

Solving Segmented minima

4

3

5

62

1

7

8


1,2,3,4,73,5,6,7,8

3,4,6,8

2,4,5,7

1,4,6

2,4,7,8

1,3,6,8

2,5,8

4

3

2

1 5

6

7

8

1. Send (f(v),a(v)) to all neighbors


2. Send to each neighbor u the minimal value received from u 's segment

1,2,3,4,7

3,4,6,8

2,4,5,7

1,4,6

3,5 4

3

2

1 5

6

7

8 1,7

2,7

1,6

2,5

3,6

2,5

1,6

3,5,6,7,8

2,4,7,8

1,3,6,8

2,5,8


3. Set b(v) to be the minimum of all values received in the second step

1,2,3,4,7

3,4,6,8

2,4,5,7

1,4,6

4

3

2

1 5

6

7

83,5,6,7,8

,2,4,7,8

1,3,6,8

2,5,8

1,3,2,1,2

1,3,3,1

1,2,2,2

1,1,1

5,7,6,5,6

5,7,7,5

5,6,6,6

5,5,5

definition A fragment is a collection of nodes

connected by edges already added to the MST.

The leader of a fragment is the node whose ID is minimal in the fragment.

At any given time step, we use f(v) to denote the leader of the fragment that contains a node v

Phase k

1. Each fragment adds one edge to the MST (using the leader). By doing this a new structure of fragments is created

2. Each new fragment chooses a new leader.

A simple O(log^2 n) time algorithm derived from

Boruvka's

All nodes in a fragment know the ID of their leader at the beginning of every Phase

Initially, each node forms a singleton fragment with itself being the leader

Phase k

1. Each node v sends the ID of its current leader f(v) to all its neighbors

2. The nodes execute segmented minima, with the values being the weight of their lightest incident edge outgoing to another fragment

3. Find the leader of the fragment using pointer jumping.

Example

1 21 2 3 4 5 6 73 4 5 6

71010 10 10 10 10

8

Phase 1The problem is to select a leader

1 21 2 3 4 5 6 73 4 5 6

71010 10 10 10 10

8

1 2 3 4 5 6 7 8

0 1 1 2 3 4 5 6 7

1 1 1 1 2 3 4 5 6

2 1 1 1 1 1 2 3 4

3 1 1 1 1 1 1 1 1

O(Log(log(n))) in KnElan Pavlov The idea is the increase the

communication bandwidth the fragment

The alg work in phases each take O(1) For every fragment F, the spanning

subtree T(F) is know to all the node in the graph at the end of the time the fragmen is created.

Example

Phase k

1. For every other fragmen F' do:2. Compute the minimum-weight edge e(v,F') that

connects v to (any node of) F'.3. Send e(v,F') to every node in the fragmen F'.4. For every other fragmen F', inspect e(w,F) for

every wF‘ and compute the fragmen edge between F' and F, denoted e(F,F')

5. selects a set A(F) containing the N cheapest edges that go out of F to N distinct fragmen end for each edge e appointed as guardian.

6. computes the new fragmen and spanning subtree of phase k.

computes the new fragmen

Done in two stages1. creating a logical graph G.2. partitions this logical graph G into

superclusters and constructs a spanning subtree.


partitions this logical graph into superclusters and constructs a spanning subtree.

1. Inspects the edges that where selected sequentially in increasing order of weight.

2. Edge e is added to G if it does not close a cycle with edges already in G.

3. Whenever an edge e=(F1,F2) is added to G the superclusters F1 and F2 are merged into one supercluster


newly constructed super- fragmen F is declared finished if

1. e is the heaviest edge in A(F1) or in A(F2),

2. Either F1 or F2 is finished.

3. The super-cluster F is declared finished if e is the heaviest edge.

Example

10 10 10

10

1 21 2 3 4 5 6 73 4 5 6

71010 10 10

8

7

1 2 3 4 5 6 7 8

0 1 1 2 3 4 5 6 7

1 1 1 1 2 3 4 4 4

2 1 1 1 1 1 2

3

Example

10 10 10

10

1 21 2 3 4 5 6 73 4 5 6

71010 10 10

8

7

1 2 3 4 5 6 7 8

0 1 1 2 3 4 5 6 7

a 1 1 1 2 3 4 4 4

1 1 1 1 1 1 2 2 2

a

At the end

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3

5

62

1

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8

Phase 2

4

3

5

62

1

7

8

4

3

Distributed MST for Constant Diameter Graphs Zvi Lotker & Boaz Patt-Shamir & David Peleg.

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