Tighter Cut-Based Bounds for k-pairs Communication Problems Nick Harvey Robert Kleinberg Overview Definitions Sparsity and Meagerness Bounds Show these bounds very loose Define Informational Meagerness Based on Informational Dominance Show that it can be slightly loose k-pairs Communication Problem S(1) M1 M2 S(2) M1⊕M2 T(2) T(1) Concurrent Rate Source i desires communication rate di. Rate r is achievable if rate vector [ rd1, rd2, …, rdk ] is achievable Rate region interval of R+ Def: “Network coding rate” (or NCR) := sup { r : r is achievable } k-pairs Communication Problem S(1) M1 M2 M1⊕M2 T(2) S(2) d1 = d2 = 1 ce = 1 eE Rate 1 achievable T(1) Upper bounds on rate [Classical]: Sparsity bound for multicommodity flows [CT91]: General bound for multi-commodity information networks [B02]: Application of CT91 to directed network coding instances; equivalent to sparsity. [KS03]: Bound for undirected networks with arbitrary two-way channels [HKL04]: Meagerness [SYC03], [HKL05]: LP bound [KS05]: Bound based on iterative d-separation Vertex-Sparsity Def: For U V, VS (U) := Capacity of edges crossing between U and U Demand of commodities separated by U VS (G) := minUV VS (U) Claim: NCR VS (G) Edge-Sparsity Def: For A E, ES (A) := Capacity of edges in A Demand of commodities separated in G\A ES (G) = minAE ES (A) Claim: Max-Flow ES (G) But: Sometimes NCR > ES (G) NCR > Edge-Sparsity S(1) S(2) e T(2) Cut {e} separates S(1) and S(2) ES ({e}) = 1/2 But rate 1 achievable! T(1) Meagerness Def: For A E and P [k], A isolates P if for all i,j P, S(i) and T(j) disconnected in G\A. M (A) := minP isolated by A M (G) := minAE Capacity of edges in A Demand of commodities in P M (A) Claim: NCR M (G) Meagerness & Vtx-Sparsity are weak S(n) fn-1 gn S(n-1) f3 gn-1 S(3) f2 g3 S(2) f1 g2 S(1) g1 Gn := T(n) hn-1 T(n-1) h3 T(3) h2 Thm: M (Gn) = VS (Gn) = (1), but NCR 1/n. T(2) h1 T(1) A Proof Tool Def: Let A,B E. B is downstream of A if B disconnected from sources in G\A. Notation: A B. Claim: If A B then H(A) H(A,B). Pf: Because S A B form Markov chain. Lemma: NCR 1/n S(n) fn-1 gn S(n-1) gn-1 f3 S(3) f2 g3 S(2) f1 g2 S(1) g1 Gn := T(n) hn-1 T(n-1) Proof: {gn} {gn,T(1),h1} h3 T(3) h2 T(2) h1 T(1) Lemma: NCR 1/n S(n) fn-1 gn S(n-1) gn-1 f3 S(3) f2 g3 S(2) f1 g2 S(1) g1 Gn := T(n) hn-1 T(n-1) h3 T(3) h2 T(2) h1 Proof: {gn} {gn,T(1),h1} {S(1),f1,g1,h1} T(1) Lemma: NCR 1/n S(n) fn-1 gn S(n-1) gn-1 f3 S(3) f2 g3 S(2) f1 g2 S(1) g1 Gn := T(n) hn-1 T(n-1) h3 T(3) h2 T(2) h1 Proof: {gn} {gn,T(1),h1} {S(1),f1,g1,h1} {S(1),f1,T(2),h2} T(1) Lemma: NCR 1/n S(n) fn-1 gn S(n-1) gn-1 f3 S(3) f2 g3 S(2) f1 g2 S(1) g1 Gn := T(n) hn-1 T(n-1) h3 T(3) h2 T(2) h1 Proof: {gn} {gn,T(1),h1} {S(1),f1,g1,h1} {S(1),f1,T(2),h2} {S(1),S(2),f2,g2,h2} T(1) Lemma: NCR 1/n S(n) fn-1 gn S(n-1) gn-1 f3 S(3) f2 g3 S(2) f1 g2 S(1) g1 Gn := T(n) hn-1 T(n-1) h3 T(3) h2 T(2) h1 Proof: {gn} {gn,T(1),h1} {S(1),f1,g1,h1} {S(1),f1,T(2),h2} {S(1),S(2),f2,g2,h2} {S(1),S(2),f2,T(3),h3} T(1) Lemma: NCR 1/n S(n) fn-1 gn S(n-1) gn-1 f3 S(3) f2 g3 S(2) f1 g2 S(1) g1 Gn := T(n) hn-1 T(n-1) h3 T(3) h2 T(2) h1 Proof: {gn} … {S(1),S(2),…,S(n)} Thus 1 H(gn) H(S(1),…,S(n)) = n∙r So 1/n r T(1) Towards a stronger bound Our focus: cut-based bounds Given A E, we want to infer that H(A) H(A,P) where P{S(1),…,S(k)} Meagerness uses Markovicity: (sources in P) A (sinks in P) Markovicity sometimes not enough… Informational Dominance Def: A dominates B if information in A determines information in B in every network coding solution. Denoted A i B. Trivially implies H(A) H(A,B) How to determine if A dominates B? [HKL05] give combinatorial characterization and efficient algorithm to test if A dominates B. Informational Meagerness Def: For A E and P {S(1),…,S(k)}, A informationally isolates P if AP i P. Capacity of edges in A iM (A) = minP Demand of commodities in P for P informationally isolated by A iM (G) = minA E iM (A) Claim: NCR iM (G). iMeagerness Example s1 s2 t1 t2 “Obviously” NCR = 1. But no two edges disconnect t1 and t2 from both sources! iMeagerness Example s1 s2 t1 Cut A t2 After removing A, still a path from s2 to t1! Informational Dominance Example s1 Cut A s2 t1 t2 Our characterization shows A i {t1,t2} H(A) H(t1,t2) and iM (G) = 1 A bad example: Hn Thm: iMeagerness gap of Hn is (log |V|) s(00) H2 s(0) q(00) r(00) t(00) t(0) s(ε) s(01) s(10) q(01) r(01) q(10) r(10) t(01) t(10) t(ε) s(1) s(11) q(11) r(11) t(1) t(11) Capacity 2-n s(00) s(0) s(ε) s(01) s(10) s(1) s(11) Tn = Binary tree of depth n Source S(i) iTn s(00) s(0) s(ε) s(01) s(10) s(1) s(11) Tn = Binary tree of depth n Source S(i) iTn Sink T(i) iTn t(00) t(0) t(01) t(10) t(ε) t(1) t(11) s(00) s(0) s(ε) s(01) s(10) s(1) s(11) Nodes q(i) and r(i) for every leaf i of Tn q(00) r(00) t(00) t(0) q(01) r(01) q(10) r(10) t(01) t(10) t(ε) q(11) r(11) t(1) t(11) s(00) s(0) q(00) r(00) s(ε) s(01) s(10) q(01) r(01) q(10) r(10) s(1) s(11) q(11) r(11) Complete bip. graph between sources and q’s t(00) t(0) t(01) t(10) t(ε) t(1) t(11) (r(a),t(b)) if b ancestor of a in Tn s(00) s(0) q(00) r(00) t(00) t(0) s(ε) s(01) s(10) q(01) r(01) q(10) r(10) t(01) t(10) t(ε) s(1) s(11) q(11) r(11) t(1) t(11) (s(a),t(b)) if a and b cousins in Tn s(00) s(0) q(00) r(00) t(00) t(0) s(ε) s(01) s(10) q(01) r(01) q(10) r(10) t(01) t(10) t(ε) s(1) s(11) q(11) r(11) t(1) t(11) All edges have capacity except (q(i),r(i)) s(00) s(0) q(00) r(00) t(00) t(0) s(ε) s(01) s(10) q(01) r(01) q(10) r(10) t(01) t(10) t(ε) s(1) s(11) q(11) r(11) t(1) t(11) Capacity 2-n Demand of source at depth i is 2-i s(00) s(0) q(00) r(00) t(00) t(0) s(ε) s(01) s(10) q(01) r(01) q(10) r(10) t(01) t(10) t(ε) s(1) s(11) q(11) r(11) t(1) t(11) Capacity 2-n Properties of Hn Lemma: iM (Hn) = (1) Lemma: NCR < 1/n Corollary: iMeagerness gap is n=(log |V|) Properties of Hn Lemma: iM (Hn) = (1) Lemma: NCR < 1/n Corollary: iMeagerness gap is n=O(log |V|) We will prove this Proof Ingredients Entropy moneybags i.e., sets of RVs Entropy investments Buying sources and edges, putting into moneybag Loans may be necessary Profit Via Downstreamness or Info. Dominance Earn new sources or edges for moneybag Corporate mergers Via Submodularity New Investment Opportunities and Debt Consolidation Debt repayment Submodularity of Entropy Claim: Let A and B be sets of RVs. Then H(A)+H(B) H(AB)+H(AB) Pf: Equivalent to I( X; Y | Z ) 0. Lemma: NCR < 1/n Proof: Two entropy moneybags: F(a) = { S(b) : b not an ancestor of a } E(a) = F(a) { (q(b),r(b)) : b is descendant of a } Entropy Investment a s(00) q(00) r(00) s(0) s(ε) s(01) s(10) q(01) r(01) q(10) r(10) Let a be a leaf of Tn Take a loan and buy E(a). s(1) s(11) q(11) r(11) Earning Profit a s(00) q(00) r(00) t(00) s(0) s(ε) s(01) s(10) q(01) r(01) q(10) r(10) s(1) s(11) q(11) r(11) Claim: E(a) T(a) Pf: Cousin-edges not from ancestors. Vertex r(00) blocked by E(a). Earning Profit a s(00) q(00) r(00) t(00) s(0) s(ε) s(01) s(10) q(01) r(01) q(10) r(10) s(1) s(11) q(11) r(11) Claim: E(a) T(a) Result: E(a) gives free upgrade to E(a){S(a)}. Profit = S(a). aL s(00) s(0) s(ε) s(01) s(10) q(01) r(01) q(10) r(10) s(1) s(11) E(aL){S(aL)} q(00) r(00) aR s(00) s(0) s(ε) s(01) s(10) q(01) r(01) q(10) r(10) q(11) r(11) s(1) s(11) E(aR){S(aR)} q(00) r(00) q(11) r(11) Applying submodularity s(00) (E(aL){S(aL)}) (E(aR){S(aR)}) s(0) q(00) r(00) s(00) (E(aL){S(aL)}) (E(aR){S(aR)}) q(00) r(00) s(0) s(ε) s(01) s(10) q(01) r(01) q(10) r(10) s(ε) s(01) s(10) q(01) r(01) q(10) r(10) s(1) s(11) q(11) r(11) s(1) s(11) q(11) r(11) New Investment a (E(aL){S(aL)}) (E(aR){S(aR)}) s(00) q(00) r(00) s(0) s(ε) s(01) s(10) q(01) r(01) q(10) r(10) s(1) s(11) q(11) r(11) Union term has more edges Can use downstreamness or informational dominance again! (E(aL){S(aL)}) (E(aR){S(aR)}) = E(a) Debt Consolidation Intersection term has only sources Cannot earn new profit. Used for later “debt repayment” (E(aL){S(aL)}) (E(aR){S(aR)}) = F(a) a s(00) (E(aL){S(aL)}) (E(aR){S(aR)}) q(00) r(00) s(0) s(ε) s(01) s(10) q(01) r(01) q(10) r(10) s(1) s(11) q(11) r(11) What have we shown? Let aL,aR be sibling leaves; a is their parent. H(E(aL)) + H(E(aR)) H(E(a)) + H(F(a)) Iterate and sum over all nodes in tree H ( E (l )) H ( E (r )) H ( F (v)) leaf l nonleaf v where r is the root. Note: E(v) = F(v) {(q(v),r(v))} when v is a leaf H ( F (l )) H (( q (l ), r (l ))) leaf l leaf l H ( E (r )) H ( F (v)) nonleaf v Debt Repayment H ( F (l )) H (( q (l ), r (l ))) leaf l leaf l H ( E (r )) H ( F (v)) nonleaf v ( F (v)) l H ( F (l )) nonleaf H Claim: leaf v Pf: Simple counting argument. H ((q(l ), r (l ))) H ( E (r )) leaf l Finishing up H ((q(l ), r (l ))) H ( E (r )) leaf l = c( q (l ),r (l )) H ( S (i)) leaf l i = = 1 2 depth ( v ) n v (where α = rate of solution) Rate < 1/n
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