Dariusz Kowalski University of Connecticut & Warsaw University Andrzej Pelc
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Transcript of Dariusz Kowalski University of Connecticut & Warsaw University Andrzej Pelc
Dariusz Kowalski
University of Connecticut & Warsaw University
Andrzej PelcUniversity of Quebec en Outaouais
Broadcasting in Undirected
Ad hoc
Radio Networks
Broadcasting in undirected ad hoc radio networks 2
Structure of the presentation Preliminaries
– Model of ad-hoc radio network
– Broadcasting problem - definition and prior work
– Goals and results
Efficient randomized algorithm matching lower bound for randomized algorithms
Complete-layered networks Lower bound for deterministic algorithms Efficient deterministic algorithm based on technique of
solving collision Conclusions
Broadcasting in undirected ad hoc radio networks 3
Radio network n nodes with different labels 1,…,N (N=(n))
communicate via radio network modeled by symmetric graph G
node v knows only it own label and parameter N communication is in synchronous steps in every step, node v is either
– transmitting, or– receiving
Broadcasting in undirected ad hoc radio networks 4
Message delivery Node v receives a message from node w in step i if
– node v : • is receiving in step i
– node w : • is a neighbor of node v in network G, and
• is transmitting in step i
– node z w :• if z is a neighbor of node v in network G then z is receiving
in step i
Otherwise node v receives nothing
Broadcasting in undirected ad hoc radio networks 5
Broadcasting problem
Broadcasting problem: some node, called source, has the message, called
the source message, and transmits it in step 0 every node different than source is receiving until
it receives the source message (no-spontaneous)Goal: all nodes must know the source message
Measure of performance: time by the first step when all nodes have the source message
Broadcasting in undirected ad hoc radio networks 6
Bibliography[ABLP] N. Alon, A. Bar-Noy, N. Linial, D. Peleg: A lower bound for
radio broadcast. J. of Computer and System Sciences, 1991.
[BGI] R. Bar-Yehuda, O. Goldreich, A. Itai: On the time complexity of broadcast in radio networks: an exponential gap between determinism and randomization. JCSS, 1992.
[CMS] A. Clementi, A. Monti, R. Silvestri: Selective families, superimposed codes, and broadcasting on unknown radio networks. SODA, 2001.
[CGR] M. Chrobak, L. Gasieniec, W. Rytter: Fast broadcasting and gossiping in radio networks. FOCS, 2000.
[KP] D. Kowalski, A. Pelc: Deterministic broadcasting time in radio networks of unknown topology, FOCS, 2002.
[KM] E. Kushilevitz, Y. Mansour: An (Dlog(n/D)) lower bound for broadcast in radio networks. SIAM J. Comp. 1998.
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Goals and results
Randomized Deterministic
O(Dlog(n/D)+log2 n) this paper
(Dlog(n/D)+log2 n) [ABLP,KM]
O(nlog n) this paper
(nlog n/log(n/D)) this paper
GOAL: understand better what are the properties of graphs on which deterministic/randomized broadcasting is time-consuming
RESULT: more advanced property of graphs, which are hard to broadcast by deterministic algorithms, yields
randomization is better
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Randomized algorithms - lower bounds Lower bound (Dlog(n/D)) for expected broadcasting
time for n-node networks (complete-layered) with diameter D - proved by Kushilevitz and Mansour [KM]
Lower bound (log2 n) for broadcasting time for n-node networks with constant diameter
proved by Alon et al. [ABLP] even for known network and deterministic algorithms
0
L1
Lj {1,…, n}L2 LD-1 LD
Complete--layerednetwork
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Randomized algorithms Randomized algorithm with O(Dlog n + log2 n) expected
broadcasting time introduced by Bar-Yehuda, Goldreich, Itai [BGI]
Our result: algorithm broadcasting in expected time
O(Dlog(n/D) + log2 n)
matching lower bound.
Presentation:– Combinatorial tools : universal sequence
– Idea of construction
– Algorithm and remarks
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Universal sequenceRemind: N,D are fixed.
Definition: An infinite sequence (pi)i=1,…, of reals from the interval [0,1] is called universal sequence if the following conditions hold:
for every j = log(N/D)+1, … , log(N/(4 log N)) , the sequence pi+1, pi+2, … , pi+3Dx/N contains at least one value 1/x, where x=2j ;
for every j = log(N/(4 log N))+1, … , log N , the sequence pi+1, pi+2,…, pi+3Dx/(Nlog N) contains at least one value 1/x, where x=2j.
Lemma: There exists universal sequence.
Proof: Idea of construction of universal sequence: – put values 2-j to nodes of the complete binary tree of N leaves according to
some rule
– traverse this tree, writing values of visiting nodes
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Idea of algorithmIdea of algorithm (assuming known D): partition into stages, each taking log(N/D) + 2 steps in steps j of stage, for j = 0,1,…,log(N/D) , we want to
assure fast transmission to the node having informed neighbor and of degree close to 2j -
- hence we transmit with probability 2-j
in step j = log(N/D) + 1 of stage i we want to assure fast transmission to the node having informed neighbor and of degree greater than N/D -
- hence we transmit with probability pi according to the universal sequence
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Algorithmsource transmits
for D:=1 to log N do
for i:=1 to aD do -- executing stage(D,i)
if node v received the source message before stage(D,i) then
for k=0 to log(N/D) do transmit with probability 2-k transmit with probability pi
Expected broadcasting time: O(Dlog(n/D) + log2 n)
Remark: Complete-layered graphs are among most difficult to
broadcast by randomized algorithms.
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Complete-layered networksQUESTION: are complete-layered networks among most
difficult graphs to broadcast by deterministic algorithms?
Clementi, Monti, Silvestri in [CMS] claimed that
every deterministic algorithm needs time (nlog D) to broadcast on some complete-layered graph of n nodes
and diameter D
Claim is wrong, and answer for the QUESTION is NOT (unlike for randomized algorithms)
We showed [KP-STACS’03] deterministic algorithm broadcasting on complete-layered networks in time
O(Dlog(n/D) + log2 n)
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Deterministic lower bound For D n1/2 : lower bound (n) claimed in [BGI] and
proved by us is [KP-SIROCCO’03]
In this case Dlog(n/D) + log2 n = o(n) For D > n1/2 we prove lower bound (nlog n / log(n/D))
on star-layered graphs
0
L*1 L*
j Lj {D/2+1,…, n}
L*3
L*D-3
LD-2
1 2 D/2-1 D/2
L1 L2 L3 L4 LDLD-1LD-3
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Idea of selecting worst-case networkWhy are complete-layered networks bad? Fast broadcasting using selective-family (see also [CMS]) Fast broadcasting using leader election in every front layer
To construct layer L2j-1 we need in the same time:
Keep size |L2j-1| = O(n/D)
Select set L*2j-1 to assure that node 2j will not receive a
message from set L*2j-1 during (n/D)log D steps after
activation of nodes in L*2j-1
Not allow nodes in layer L2j-1 to receive a message from node 2(j-1) during (n/D)log D steps after activation of nodes in L2j-1
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Deterministic algorithm Best known deterministic algorithm broadcasts in time
O(nlog nlog D) [CGR,KP-SIROCCO’03] (it works also for directed networks)
Our result: broadcasting time O(nlog n)
Procedure SELECT(p,o,s) [KP] Using node p and procedure ECHO, node o “asks” if
there exists unvisited neighbor in range {1,…,N/2} O(1) If YES then node o recursively restricts the range of
SELECT from {1,…,N} to {1,…,N/2} If NO then node o recursively restricts the range of
SELECT from {1,…,N} to {N/2+1,…,N}
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Description of algorithmAlgorithm
Traverse a DFS tree on network G by a token (source starts): owner of a token transmits O(1) owner selects a successor using SELECT O(log
n) owner sends a token to successor O(1)
Until token in source and no successor selected in SELECT
Length of a DFS-traverse: O(n)
Broadcasting time: O(nlog n)
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ConclusionsWe considered problem of broadcasting on radio networks: Randomization is better than determinism Complete-layered networks are among most hard
networks to broadcast by randomized algorithms, but not by deterministic algorithms
Remaining open problem Closing gap between lower and upper bounds on
broadcasting time for deterministic algorithms