Submodular Functions, Optimization, and Applications to Machine Learning
|
|
- Myra Joseph
- 5 years ago
- Views:
Transcription
1 Submodular Functions, Optimization, and Applications to Machine Learning Spring Quarter, Lecture 10 Prof. Je Bilmes University of Washington, Seattle Department of Electrical Engineering May 2nd, 2016 Clockwise from top left:v Lásló Lovász Jack Edmonds Satoru Fujishige George Nemhauser Laurence Wolsey András Frank Lloyd Shapley H. Narayanan Robert Bixby William Cunningham William Tutte Richard Rado Alexander Schrijver Garrett Birkhoff Hassler Whitney Richard Dedekind Prof. Je Bilmes + f (A) + f (B) f (A [ B) = f (Ar ) + 2f (C ) + f (Br ) = f (Ar ) +f (C ) + f (Br ) f (A \ B) = f (A \ B) EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F1/64 (pg.1/203)
2 Logistics Cumulative Outstanding Reading Review Read chapters 2 and 3 from Fujishige s book. Read chapter 1 from Fujishige s book. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F2/64 (pg.2/203)
3 Logistics Announcements, Assignments, and Reminders Review Homework 3, available at our assignment dropbox ( due (electronically) Monday (5/2) at 11:55pm. Homework 2, available at our assignment dropbox ( due (electronically) Monday (4/18) at 11:55pm. Homework 1, available at our assignment dropbox ( due (electronically) Friday (4/8) at 11:55pm. Weekly O ce Hours: Mondays, 3:30-4:30, or by skype or google hangout (set up meeting via our our discussion board (https: //canvas.uw.edu/courses/ /discussion_topics)). Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F3/64 (pg.3/203)
4 Logistics Class Road Map - IT-I Review L1(3/28): Motivation, Applications, & Basic Definitions L2(3/30): Machine Learning Apps (diversity, complexity, parameter, learning target, surrogate). L3(4/4): Info theory exs, more apps, definitions, graph/combinatorial examples, matrix rank example, visualization L4(4/6): Graph and Combinatorial Examples, matrix rank, Venn diagrams, examples of proofs of submodularity, some useful properties L5(4/11): Examples & Properties, Other Defs., Independence L6(4/13): Independence, Matroids, Matroid Examples, matroid rank is submodular L7(4/18): Matroid Rank, More on Partition Matroid, System of Distinct Reps, Transversals, Transversal Matroid, L8(4/20): Transversals, Matroid and representation, Dual Matroids, L9(4/25): Dual Matroids, Properties, Combinatorial Geometries, Matroid and Greedy L10(4/27): Matroid and Greedy, Polyhedra, Matroid Polytopes, Polymatroid Finals Week: June 6th-10th, L11(5/2): L12(5/4): L13(5/9): L14(5/11): L15(5/16): L16(5/18): L17(5/23): L18(5/25): L19(6/1): L20(6/6): Final Presentations maximization. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F4/64 (pg.4/203)
5 Logistics The greedy algorithm Review In combinatorial optimization, the greedy algorithm is often useful as a heuristic that can work quite well in practice. The goal is to choose a good subset of items, and the fundamental tenet of the greedy algorithm is to choose next whatever currently looks best, without the possibility of later recall or backtracking. Sometimes, this gives the optimal solution (we saw three greedy algorithms that can find the maximum weight spanning tree). Greedy is good since it can be made to run very fast O(n log n). Often, however, greedy is heuristic (it might work well in practice, but worst-case performance can be unboundedly poor). We will next see that the greedy algorithm working optimally is a defining property of a matroid, and is also a defining property of a polymatroid function. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F5/64 (pg.5/203)
6 Logistics Matroid and the greedy algorithm Review Let (E,I) be an independence system, and we are given a non-negative modular weight function w : E! R +. Algorithm 1: The Matroid Greedy Algorithm 1 Set X ;; 2 while 9v 2 E \ X s.t. X [{v} 2I do 3 v 2 argmax {w(v) :v 2 E \ X, X [{v} 2I}; 4 X X [{v} ; Same as sorting items by decreasing weight w, and then choosing items in that order that retain independence. Theorem D: Let (E,I) be an independence system. Then the pair (E,I) is a matroid if and only if for each weight function w 2R E +, Algorithm?? leads to a set I 2I of maximum weight w(i). I Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F6/64 (pg.6/203)
7 Review from Lecture 6 The next slide is from Lecture 6. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F7/64 (pg.7/203)
8 Matroids by bases In general, besides independent sets and rank functions, there are other equivalent ways to characterize matroids. Theorem (Matroid (by bases)) Let E be a set and B be a nonempty collection of subsets of E. Thenthe following are equivalent. 1 B is the collection of bases of a matroid; 2 if B,B 0 2B,andx 2 B 0 \ B, thenb 0 x + y 2Bfor some y 2 B \ B 0. 3 If B,B 0 2B,andx 2 B 0 \ B, thenb y + x 2Bfor some y 2 B \ B 0. Properties 2 and 3 are called exchange properties. Proof here is omitted but think about this for a moment in terms of linear spaces and matrices, and (alternatively) spanning trees. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F8/64 (pg.8/203)
9 Matroid and the greedy algorithm proof of Theorem Assume (E,I) is a matroid and w : E!R + is given.... Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F9/64 (pg.9/203)
10 Matroid and the greedy algorithm proof of Theorem Assume (E,I) is a matroid and w : E!R + is given. Let A =(a 1,a 2,...,a r ) be the solution returned by greedy, where r = r(m) the rank of the matroid, and we order the elements as they were chosen (so w(a 1 ) w(a 2 ) w(a r )).... Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F9/64 (pg.10/203)
11 Matroid and the greedy algorithm proof of Theorem Assume (E,I) is a matroid and w : E!R + is given. Let A =(a 1,a 2,...,a r ) be the solution returned by greedy, where r = r(m) the rank of the matroid, and we order the elements as they were chosen (so w(a 1 ) w(a 2 ) w(a r )). A is a base of M, andletb =(b 1,...,b r ) be any another base of M with elements also ordered decreasing by weight, so w(b 1 ) w(b 2 ) w(b r ).... Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F9/64 (pg.11/203)
12 Matroid and the greedy algorithm proof of Theorem Assume (E,I) is a matroid and w : E!R + is given. Let A =(a 1,a 2,...,a r ) be the solution returned by greedy, where r = r(m) the rank of the matroid, and we order the elements as they were chosen (so w(a 1 ) w(a 2 ) w(a r )). A is a base of M, andletb =(b 1,...,b r ) be any another base of M with elements also ordered decreasing by weight, so w(b 1 ) w(b 2 ) w(b r ). We next show that not only is w(a) w(b) but that w(a i ) w(b i ) for all i.... Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F9/64 (pg.12/203)
13 =.. z Matroid and Greedy Polyhedra Matroid Polytopes Polymatroid Matroid and the greedy algorithm Air proof of Theorem Assume otherwise, and let k be the first (smallest) integer such that w(a k ) <w(b k ).Hencew(a j ) w(b j ) for j<k.. a, ) zw (a) 2 w( an., ) z WC an ) z wlar. ) wihizwiidz wide win tw... >-,, z Bh... Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F9/64 (pg.13/203)
14 Matroid and the greedy algorithm proof of Theorem Assume otherwise, and let k be the first (smallest) integer such that w(a k ) <w(b k ).Hencew(a j ) w(b j ) for j<k. Define independent sets A k 1 = {a 1,...,a k 1 } and B k = {b 1,...,b k }.... Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F9/64 (pg.14/203)
15 Matroid and the greedy algorithm proof of Theorem Assume otherwise, and let k be the first (smallest) integer such that w(a k ) <w(b k ).Hencew(a j ) w(b j ) for j<k. Define independent sets A k 1 = {a 1,...,a k 1 } and B k = {b 1,...,b k }. Since A k 1 < B k,thereexistsab i 2 B k \ A k 1 where A k 1 [{b i }2I for some 1 apple i apple k.... Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F9/64 (pg.15/203)
16 Matroid and the greedy algorithm proof of Theorem Assume otherwise, and let k be the first (smallest) integer such that w(a k ) <w(b k ).Hencew(a j ) w(b j ) for j<k. Define independent sets A k 1 = {a 1,...,a k 1 } and B k = {b 1,...,b k }. Since A k 1 < B k,thereexistsab i 2 B k \ A k 1 where A k 1 [{b i }2I for some 1 apple i apple k. But w(b i ) w(b k ) >w(a k ), and so the greedy algorithm would have chosen b i rather than a k, 4contradicting what greedy does. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F9/64 (pg.16/203)
17 Matroid and the greedy algorithm converse proof of Theorem Given an independence system (E,I), suppose the greedy algorithm leads to an independent set of max weight for every non-negative weight function. We ll show (E,I) is a matroid. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F10/64 (pg.17/203)...
18 Matroid and the greedy algorithm converse proof of Theorem Given an independence system (E,I), suppose the greedy algorithm leads to an independent set of max weight for every non-negative weight function. We ll show (E,I) is a matroid. Emptyset containing and down monotonicity already holds (since we ve started with an independence system). Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F10/64 (pg.18/203)...
19 Matroid and the greedy algorithm converse proof of Theorem Given an independence system (E,I), suppose the greedy algorithm leads to an independent set of max weight for every non-negative weight function. We ll show (E,I) is a matroid. Emptyset containing and down monotonicity already holds (since we ve started with an independence system). Let I,J 2I with I < J. Suppose to the contrary, that I [{z} /2 I for all z 2 J \ I. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F10/64 (pg.19/203)...
20 Matroid and the greedy algorithm converse proof of Theorem Given an independence system (E,I), suppose the greedy algorithm leads to an independent set of max weight for every non-negative weight function. We ll show (E,I) is a matroid. Emptyset containing and down monotonicity already holds (since we ve started with an independence system). Let I,J 2I with I < J. Suppose to the contrary, that I [{z} /2 I for all z 2 J \ I. Define the following modular weight function w on E, and define k = I. 8 >< k +2 if v 2 I, w(v) = k +1 if v 2 J \ I, >: 0 if v 2 E \ (I [ J). (10.1) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F10/64 (pg.20/203)...
21 Matroid and the greedy algorithm converse proof of Theorem Now greedy will, after k iterations, recover I, but it cannot choose any element in J \ I by assumption. Thus, greedy chooses a set of weight k(k + 2). = WCI ) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F10/64 (pg.21/203)...
22 Matroid and the greedy algorithm converse proof of Theorem Now greedy will, after k iterations, recover I, but it cannot choose any element in J \ I by assumption. Thus, greedy chooses a set of weight k(k + 2). On the other hand, J has weight w(j) J (k + 1) (k + 1)(k + 1) >k(k + 2) (10.2) so J has strictly larger weight but is still independent, contradicting greedy s optimality. = wet Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F10/64 (pg.22/203)...
23 Matroid and the greedy algorithm converse proof of Theorem Now greedy will, after k iterations, recover I, but it cannot choose any element in J \ I by assumption. Thus, greedy chooses a set of weight k(k + 2). On the other hand, J has weight w(j) J (k + 1) (k + 1)(k + 1) >k(k + 2) (10.2) so J has strictly larger weight but is still independent, contradicting greedy s optimality. Therefore, there must be a z 2 J \ I such that I [{z} 2I,andsince I and J are arbitrary, (E,I) must be a matroid. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F10/64 (pg.23/203)
24 Matroid and greedy As given, the theorem asked for a modular function w 2 R E +. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F11/64 (pg.24/203)
25 Matroid and greedy As given, the theorem asked for a modular function w 2 R E +. This will not only return an independent set, but it will return a base if we keep going even if the weights are 0. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F11/64 (pg.25/203)
26 Matroid and greedy As given, the theorem asked for a modular function w 2 R E +. This will not only return an independent set, but it will return a base if we keep going even if the weights are 0. If we don t want elements with weight 0, we can stop once (and if) the weight hits zero, thus giving us a maximum weight independent set. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F11/64 (pg.26/203)
27 Matroid and greedy As given, the theorem asked for a modular function w 2 R E +. This will not only return an independent set, but it will return a base if we keep going even if the weights are 0. If we don t want elements with weight 0, we can stop once (and if) the weight hits zero, thus giving us a maximum weight independent set. We don t need non-negativity, we can use any w 2 R E and keep going until we have a base. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F11/64 (pg.27/203)
28 Matroid and greedy As given, the theorem asked for a modular function w 2 R E +. This will not only return an independent set, but it will return a base if we keep going even if the weights are 0. If we don t want elements with weight 0, we can stop once (and if) the weight hits zero, thus giving us a maximum weight independent set. We don t need non-negativity, we can use any w 2 R E and keep going until we have a base. If we stop at a negative value, we ll once again get a maximum weight independent set. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F11/64 (pg.28/203)
29 Matroid and greedy As given, the theorem asked for a modular function w 2 R E +. This will not only return an independent set, but it will return a base if we keep going even if the weights are 0. If we don t want elements with weight 0, we can stop once (and if) the weight hits zero, thus giving us a maximum weight independent set. We don t need non-negativity, we can use any w 2 R E and keep going until we have a base. If we stop at a negative value, we ll once again get a maximum weight independent set. Exercise: what if we keep going until a base even if we encounter negative values? Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F11/64 (pg.29/203)
30 Matroid and greedy As given, the theorem asked for a modular function w 2 R E +. This will not only return an independent set, but it will return a base if we keep going even if the weights are 0. If we don t want elements with weight 0, we can stop once (and if) the weight hits zero, thus giving us a maximum weight independent set. We don t need non-negativity, we can use any w 2 R E and keep going until we have a base. If we stop at a negative value, we ll once again get a maximum weight independent set. Exercise: what if we keep going until a base even if we encounter negative values? We can instead do as small as possible thus giving us a minimum weight independent set/base. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F11/64 (pg.30/203)
31 Summary of Important (for us) Matroid Definitions Given an independence system, matroids are defined equivalently by any of the following: All maximally independent sets have the same size. A monotone non-decreasing submodular integral rank function with unit increments. The greedy algorithm achieves the maximum weight independent set for all weight functions. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F12/64 (pg.31/203)
32 Convex Polyhedra Convex polyhedra a rich topic, we will only draw what we need. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F13/64 (pg.32/203)
33 Convex Polyhedra Convex polyhedra a rich topic, we will only draw what we need. Definition AsubsetP R E is a polyhedron if there exists an m n matrix A and vector b 2 R m (for some m 0) suchthat IEKM P = x 2 R E : Ax apple b (10.3) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F13/64 (pg.33/203)
34 Convex Polyhedra * Convex polyhedra a rich topic, we will only draw what we need. Definition AsubsetP R E is a polyhedron if there exists an m n matrix A and vector b 2 R m (for some m 0) suchthat P = x 2 R E : Ax apple b (10.3) Thus, P is intersection of finitely many a ne halfspaces, which are of the form a i x apple b i where a i is a row vector and b i arealscalar.. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F13/64 (pg.34/203)
35 Convex Polytope A polytope is defined as follows Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F14/64 (pg.35/203)
36 Convex Polytope A polytope is defined as follows Definition AsubsetP R E is a polytope if it is the convex hull of finitely many vectors in R E.Thatis,if9, x 1,x 2,...,x k 2R E such that for all x 2 P, there exits { i } with P i i =1and i 0 8i with x = P i ix i. ear Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F14/64 (pg.36/203)
37 Convex Polytope A polytope is defined as follows Definition AsubsetP R E is a polytope if it is the convex hull of finitely many vectors in R E.Thatis,if9, x 1,x 2,...,x k 2R E such that for all x 2 P, there exits { i } with P i i =1and i 0 8i with x = P i ix i. We define the convex hull operator as follows: ( kx conv(x 1,x 2,...,x k ) def = ix i : 8i, i 0, and X i=1 i i =1 ) (10.4) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F14/64 (pg.37/203)
38 Convex Polytope - key representation theorem A polytope can be defined in a number of ways, two of which include Theorem AsubsetP R E is a polytope iff it can be described in either of the following (equivalent) ways: P is the convex hull of a finite set of points. If it is a bounded intersection of halfspaces, that is there exits matrix A and vector b such that P = {x : Ax apple b} (10.5) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F15/64 (pg.38/203)
39 Convex Polytope - key representation theorem A polytope can be defined in a number of ways, two of which include Theorem AsubsetP R E is a polytope iff it can be described in either of the following (equivalent) ways: P is the convex hull of a finite set of points. If it is a bounded intersection of halfspaces, that is there exits matrix A and vector b such that P = {x : Ax apple b} (10.5) This result follows directly from results proven by Fourier, Motzkin, Farkas, and Carátheodory. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F15/64 (pg.39/203)
40 Linear Programming Theorem (weak duality) Let A be a matrix and b and c vectors, then max {c x Ax apple b} applemin {y b : y 0,y A = c } (10.6) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F16/64 (pg.40/203)
41 Linear Programming Theorem (weak duality) Let A be a matrix and b and c vectors, then max {c x Ax apple b} applemin {y b : y 0,y A = c } (10.6) Theorem (strong duality) Let A be a matrix and b and c vectors, then max {c x Ax apple b} =min{y b : y 0,y A = c } (10.7) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F16/64 (pg.41/203)
42 Linear Programming duality forms There are many ways to construct the dual. For example, max {c x x 0, Ax apple b} =min{y b y 0,y A c } (10.8) max {c x x 0, Ax = b} =min{y b y A c } (10.9) min {c x x 0, Ax b} = max {y b y 0,y A apple c } (10.10) min {c x Ax b} = max {y b y 0,y A = c } (10.11) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F17/64 (pg.42/203)
43 Linear Programming duality forms How to form the dual in general? We quote V. Vazirani (2001) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F18/64 (pg.43/203)
44 Linear Programming duality forms How to form the dual in general? We quote V. Vazirani (2001) Intuitively, why is [one set of equations] the dual of [another quite di erent set of equations]? In our experience, this is not the right question to be asked. As stated in Section 12.1, there is a purely mechanical procedure for obtaining the dual of a linear program. Once the dual is obtained, one can devise intuitive, and possibly physical meaningful, ways of thinking about it. Using this mechanical procedure, one can obtain the dual of a complex linear program in a fairly straightforward manner. Indeed, the LP-duality-based approach derives its wide applicability from this fact. Also see the text Convex Optimization by Boyd and Vandenberghe, chapter 5, for a great discussion on duality and easy mechanical ways to construct it. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F18/64 (pg.44/203)
45 Vector, modular, incidence Recall, any vector x 2 R E can be seen as a normalized modular function, as for any A E, wehave x(a) = X a2a x a (10.12) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F19/64 (pg.45/203)
46 Vector, modular, incidence Recall, any vector x 2 R E can be seen as a normalized modular function, as for any A E, wehave x(a) = X a2a x a (10.12) Given an A E, definethetheincidencevector1 A 2{0, 1} E on the unit hypercube as follows: n Thant eristic or o def 1 A = x 2{0, 1} E : x i =1iff i 2 A (10.13) equivalently, 1 A (j) def = ( 1 if j 2 A 0 if j/2 A (10.14) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F19/64 (pg.46/203)
47 Review from Lecture 6 The next slide is review from lecture 6. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F20/64 (pg.47/203)
48 Matroid Slight modification (non unit increment) that is equivalent. Definition (Matroid-II) Asetsystem(E,I) is a Matroid if (I1 ) ;2I (I2 ) 8I 2 I,J I ) J 2 I (down-closed or subclusive) (I3 ) 8I,J 2I,with I > J, thenthereexistsx 2 I \ J such that J [{x} 2I Note (I1)=(I1 ), (I2)=(I2 ), and we get (I3) (I3 ) using induction. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F21/64 (pg.48/203)
49 Independence Polyhedra For each I 2I of a matroid M =(E,I), wecanformtheincidence vector 1 I. #,.±± V Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F22/64 (pg.49/203)
50 Independence Polyhedra For each I 2I of a matroid M =(E,I), wecanformtheincidence vector 1 I. Taking the convex hull, we get the independent set polytope, thatis ( ) [ E P ind. set = conv {1 I } (10.15) I2I EIQD Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F22/64 (pg.50/203)
51 Independence Polyhedra For each I 2I of a matroid M =(E,I), wecanformtheincidence vector 1 I. Taking the convex hull, we get the independent set polytope, thatis ( ) [ P ind. set = conv {1 I } (10.15) I2I Since {1 I : I 2I} P ind. set,wehave max {w(i) :I 2I}applemax {w x : x 2 P ind. set }. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F22/64 (pg.51/203)
52 Independence Polyhedra For each I 2I of a matroid M =(E,I), wecanformtheincidence vector 1 I. Taking the convex hull, we get the independent set polytope, thatis ( ) [ P ind. set = conv {1 I } (10.15) I2I Since {1 I : I 2I} P ind. set,wehave max {w(i) :I 2I}applemax {w x : x 2 P ind. set }. Now take the rank function r of M, and define the following polyhedron: P + r = x 2 R E : x 0,x(A) apple r(a), 8A E (10.16) HAI = atfaxakra ) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F22/64 (pg.52/203)
53 Independence Polyhedra For each I 2I of a matroid M =(E,I), wecanformtheincidence vector 1 I. Taking the convex hull, we get the independent set polytope, thatis ( ) ice. [ P ind. set = conv {1 I } (10.15) I2I Since / c- Pt {1 I : I 2I} P ind. set,wehave max {w(i) :I 2I}applemax {w x : x 2 P ind. set }. qmaxtwtaxept } Now take the rank function r of M, and define the following polyhedron: P r + D = x 2 R E : x 0,x(A) apple r(a), 8A E (10.16) Now, take any x 2 P ind. set,thenwehavethatx2p r + P ind. set P r + ). We show this next. (or Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F22/64 (pg.53/203)
54 P ind. set P + r If x 2 P ind. set,then x = X i i1 Ii (10.17) for some appropriate vector =( 1, 2,..., n). Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F23/64 (pg.54/203)
55 P ind. set P + r If x 2 P ind. set,then x = X i i1 Ii (10.17) for some appropriate vector =( 1, 2,..., n). Clearly, for such x, x 0. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F23/64 (pg.55/203)
56 P ind. set P + r If x 2 P ind. set,then x = X i i1 Ii (10.17) for some appropriate vector =( 1, 2,..., n). Clearly, for such x, x 0. Now, for any A E, x(a) =x 1 A = X i i1 Ii 1 A (10.18) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F23/64 (pg.56/203)
57 P ind. set P + r If x 2 P ind. set,then x = X i i1 Ii (10.17) for some appropriate vector =( 1, 2,..., n). Clearly, for such x, x 0. Now, for any A E, x(a) =x 1 A = X i i1 Ii 1 A (10.18) apple X i i max j:i j A 1 I j (E) (10.19) It,.#IE 4 = II ; ) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F23/64 (pg.57/203)
58 P ind. set P + r If x 2 P ind. set,then x = X i i1 Ii (10.17) for some appropriate vector =( 1, 2,..., n). Clearly, for such x, x 0. Now, for any A E, x(a) =x 1 A = X i i1 Ii 1 A (10.18) apple X i i max j:i j A 1 I j (E) (10.19) = max 1 I j (E) = max A \ I (10.20) j:i j A I2I Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F23/64 (pg.58/203)
59 P ind. set P + r If x 2 P ind. set,then x = X i i1 Ii (10.17) for some appropriate vector =( 1, 2,..., n). Clearly, for such x, x 0. Now, for any A E, x(a) =x 1 A = X i i1 Ii 1 A (10.18) apple X i i max j:i j A 1 I j (E) (10.19) = max I j (E) = max A \ I j:i j A I2I (10.20) = r(a) (10.21) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F23/64 (pg.59/203)
60 P ind. set P + r If x 2 P ind. set,then x = X i i1 Ii (10.17) for some appropriate vector =( 1, 2,..., n). Clearly, for such x, x 0. Now, for any A E, x(a) =x 1 A = X i i1 Ii 1 A (10.18) apple X i i max j:i j A 1 I j (E) (10.19) = max I j (E) = max A \ I j:i j A I2I (10.20) = r(a) (10.21) Thus, x 2 P r + and hence P ind. set P r +. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F23/64 (pg.60/203)
61 Matroid Polyhedron in 2D P + r = x 2 R E : x 0,x(A) apple r(a), 8A E (10.22) Consider this in two dimensions. We have equations of the form: x 1 0 and x 2 0 (10.23) x 1 apple r({v 1 }) E { 0113 (10.24) the x 2 apple r({v 2 }) (10.25) x 1 + x 2 apple r({v 1,v 2 }) - E 942 } (10.26) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F24/64 (pg.61/203)
62 Matroid Polyhedron in 2D P + r = x 2 R E : x 0,x(A) apple r(a), 8A E (10.22) Consider this in two dimensions. We have equations of the form: Because r is submodular, we have x 1 0 and x 2 0 (10.23) x 1 apple r({v 1 }) (10.24) x 2 apple r({v 2 }) (10.25) x 1 + x 2 apple r({v 1,v 2 }) (10.26) r({v 1 })+r({v 2 }) r({v 1,v 2 })+r(;) (10.27) so since r({v 1,v 2 }) apple r({v 1 })+r({v 2 }), thelastinequalityiseither touching (so inactive) or active. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F24/64 (pg.62/203)
63 Matroid Polyhedron in 2D x 2 apple r({v 2 }) x1 + x 2 apple r({v 1, v 2 }) PF x 2 0 " 9 x 1 0 x 1 apple r({v 1 }) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F25/64 (pg.63/203)
64 Matroid Polyhedron in 2D x 2 r(v2)=1 x 1 + x 2 = r({v 1, v 2 }) = 1 - r(v1)=1 x 1 Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F25/64 (pg.64/203)
65 Matroid Polyhedron in 2D x 2 r({v 1, v 2 }) = 0 x 1 Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F25/64 (pg.65/203)
66 Matroid Polyhedron in 2D x 2 r(v2)=1 x 1 + x 2 a = r({v 1, v 2 }) = 2 r(v1)=1 x 1 Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F25/64 (pg.66/203)
67 Matroid Polyhedron in 2D And, if v2 is a loop... x 2 r({v 1, v 2 }) = 1 r(v2)=0 r(v1)=1 x 1 Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F25/64 (pg.67/203)
68 Matroid Polyhedron in 2D x 2 x 2 r(v2)=1 x 1 + x 2 = r({v 1, v 2}) = 1 x 2 r(v2)=1 x 1 + x 2 = r({v 1, v 2}) = 2 r({v 1, v 2}) = 0 x 1 x r(v1)=1 1 x r(v1)=1 1 And, if v2 is a loop... x 2 r({v 1, v 2}) = 1 x 2 apple r({v 2 }) x1 + x 2 apple r({v 1, v 2 }) r(v2)=0 x r(v1)=1 1 x 2 0 x 1 0 x 1 apple r({v 1 }) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F25/64 (pg.68/203)
69 Matroid Polyhedron in 2D x 2 apple r({v 2 }) x 2 0 Not Possible x 1 0 x 1 apple r({v 1 }) Possible x 1 + x 2 apple r({v 1, v 2 }) Not Possible Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F26/64 (pg.69/203)
70 Matroid Polyhedron in 3D P + r = x 2 R E : x 0,x(A) apple r(a), 8A E (10.28) Consider this in three dimensions. We have equations of the form: x 1 0 and x 2 0 and x 3 0 (10.29) x 1 apple r({v 1 }) (10.30) x 2 apple r({v 2 }) (10.31) x 3 apple r({v 3 }) (10.32) x 1 + x 2 apple r({v 1,v 2 }) (10.33) x 2 + x 3 apple r({v 2,v 3 }) (10.34) x 1 + x 3 apple r({v 1,v 3 }) (10.35) x 1 + x 2 + x 3 apple r({v 1,v 2,v 3 }) (10.36) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F27/64 (pg.70/203)
71 Matroid Polyhedron in 3D Consider the simple cycle matroid on a graph consisting of a 3-cycle, G =(V,E) with matroid M =(E,I) where I 2I is a forest. Eh Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F28/64 (pg.71/203)
72 Matroid Polyhedron in 3D Consider the simple cycle matroid on a graph consisting of a 3-cycle, G =(V,E) with matroid M =(E,I) where I 2I is a forest. So any set of either one or two edges is independent, and has rank equal to cardinality. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F28/64 (pg.72/203)
73 Matroid Polyhedron in 3D Consider the simple cycle matroid on a graph consisting of a 3-cycle, G =(V,E) with matroid M =(E,I) where I 2I is a forest. So any set of either one or two edges is independent, and has rank equal to cardinality. The set of three edges is dependent, and has rank 2. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F28/64 (pg.73/203)
74 Matroid Polyhedron in 3D Two view of P r + associated with a matroid ({e 1,e 2,e 3 }, {;, {e 1 }, {e 2 }, {e 3 }, {e 1,e 2 }, {e 1,e 3 }, {e 2,e 3 }}). Exe, x x " 1 diet x3 "#t x x1 x2 0 Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F29/64 (pg.74/203)
75 Matroid Polyhedron in 3D P + r associated with the free matroid in 3D. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F30/64 (pg.75/203)
76 Matroid Polyhedron in 3D P + r associated with the free matroid in 3D Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F30/64 (pg.76/203)
77 Another Polytope in 3D Thought question: what kind of polytope might this be? Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F31/64 (pg.77/203)
78 Another Polytope in 3D Thought question: what kind of polytope might this be? Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F31/64 (pg.78/203)
79 Matroid Independence Polyhedron So recall from a moment ago, that we have that P ind. set = conv {[ I2I {1 I }} P + r = x 2 R E : x 0,x(A) apple r(a), 8A E (10.37) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F32/64 (pg.79/203)
80 Matroid Independence Polyhedron So recall from a moment ago, that we have that P ind. set = conv {[ I2I {1 I }} P r + = x 2 R E : x 0,x(A) apple r(a), 8A E (10.37) In fact, the two polyhedra are identical (and thus both are polytopes). Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F32/64 (pg.80/203)
81 Matroid Independence Polyhedron So recall from a moment ago, that we have that P ind. set = conv {[ I2I {1 I }} P r + = x 2 R E : x 0,x(A) apple r(a), 8A E (10.37) In fact, the two polyhedra are identical (and thus both are polytopes). We ll show this in the next few theorems. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F32/64 (pg.81/203)
82 Maximum weight independent set via greedy weighted rank Theorem Let M =(V,I) be a matroid, with rank function r, then for any weight function w 2 R V +, there exists a chain of sets U 1 U 2 U n V such that where i 0 satisfy nx max {w(i) I 2I}= ir(u i ) (10.38) nx w = i=1 i=1 i1 Ui (10.39) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F33/64 (pg.82/203)
83 Maximum weight independent set via weighted rank Proof. Firstly, note that for any such w 2 R E,wehave 0 B B w 1 w 2. w n 1 C C C A = w 1 w 2 0 B B C C C A + w 2 w 3 0 B B B B C C C C C A + + w n 1 w n 0 B B B B C C C C C A + w n 0 B B B B C C C C C A (10.40)... Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F34/64 (pg.83/203) in :p
84 Maximum weight independent set via weighted rank Proof. Firstly, note that for any such w 2 R E,wehave 0 B B w 1 w 2. w n 1 C C C A = w 1 w 2 0 B B C C C A + w 2 w 3 0 B B B B C C C C C A + + w n 1 w n 0 B B B B C C C C C A + w n 0 B B B B C C C C C A (10.40) If we can take w in decreasing order (w 1 w 2 w n ), then each coe cient of the vectors is non-negative (except possibly the last one, w n ).... Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F34/64 (pg.84/203)
85 Maximum weight independent set via weighted rank Proof. Now, again assuming w 2 R E +, order the elements of V as (v 1,v 2,...,v n ) such that w(v 1 ) w(v 2 ) w(v n )... Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F34/64 (pg.85/203)
86 Maximum weight independent set via weighted rank Proof. Now, again assuming w 2 R E +, order the elements of V as (v 1,v 2,...,v n ) such that w(v 1 ) w(v 2 ) w(v n ) Define the sets U i based on this order as follows, for i =0,...,n Note that Vo U0 = C A, 1 U 1 = U i def = {v 1,v 2,...,v i } (10.41) >= 1 1 `. >; 1,...,1 C U` = 0 9, etc. A > = 0 (n `) B >; A 0 Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F34/64 (pg.86/203)
87 Maximum weight independent set via weighted rank Proof. Now, again assuming w 2 R E +, order the elements of V as (v 1,v 2,...,v n ) such that w(v 1 ) w(v 2 ) w(v n ) Define the sets U i based on this order as follows, for i =0,...,n U i def = {v 1,v 2,...,v i } (10.41) Define the set I as those elements where the rank increases, i.e.: I def = {v i r(u i ) >r(u i 1 )}. (10.42) Hence, given an i with v i /2 I, r(u i )=r(u i 1 ). rain Fetus... Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F34/64 (pg.87/203)
88 Maximum weight independent set via weighted rank Proof. Now, again assuming w 2 R E +, order the elements of V as (v 1,v 2,...,v n ) such that w(v 1 ) w(v 2 ) w(v n ) Define the sets U i based on this order as follows, for i =0,...,n U i def = {v 1,v 2,...,v i } (10.41) Define the set I as those elements where the rank increases, i.e.: I def = {v i r(u i ) >r(u i 1 )}. (10.42) Hence, given an i with v i /2 I, r(u i )=r(u i 1 ). Therefore, I is the output of the greedy algorithm for max {w(i) I 2I}. since items v i are ordered decreasing by w(v i), andweonly choose the ones that increase the rank, which means they don t violate independence. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F34/64 (pg.88/203)
89 Maximum weight independent set via weighted rank Proof. Now, again assuming w 2 R E +, order the elements of V as (v 1,v 2,...,v n ) such that w(v 1 ) w(v 2 ) w(v n ) Define the sets U i based on this order as follows, for i =0,...,n U i def = {v 1,v 2,...,v i } (10.41) Define the set I as those elements where the rank increases, i.e.: I def = {v i r(u i ) >r(u i 1 )}. (10.42) Hence, given an i with v i /2 I, r(u i )=r(u i 1 ). Therefore, I is the output of the greedy algorithm for max {w(i) I 2I}. And therefore, I is a maximum weight independent set (can even be a base, actually).... Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F34/64 (pg.89/203)
90 Maximum weight independent set via weighted rank Proof. Now, we define 0 i as follows : n def ± = w(v n ) it WEIR } i def = w(v i ) w(v i+1 ) for i =1,...,n 1 (10.43) (10.44)... Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F34/64 (pg.90/203)
91 Maximum weight independent set via weighted rank Proof. Now, we define i as follows i def = w(v i ) w(v i+1 ) for i =1,...,n 1 (10.43) n def = w(v n ) And the weight of the independent set w(i) is given by (10.44) w(i) = X v2i w(v) = (10.46)... Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F34/64 (pg.91/203)
92 Maximum weight independent set via weighted rank Proof. Now, we define i as follows i def = w(v i ) w(v i+1 ) for i =1,...,n 1 (10.43) n def = w(v n ) And the weight of the independent set w(i) is given by (10.44) w(i) = X v2i w(v) = nx w(v i ) r(u i ) r(u i 1 ) (10.45) i=1. I { 4.,t%EI} (10.46)... Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F34/64 (pg.92/203)
93 Maximum weight independent set via weighted rank Proof. Now, we define i as follows i def = w(v i ) w(v i+1 ) for i =1,...,n 1 (10.43) n def = w(v n ) And the weight of the independent set w(i) is given by w(i) = X v2i w(v) = (10.44) nx w(v i ) r(u i ) r(u i 1 ) (10.45) i=1 nx 1 = w(v n )r(u n )+ i=1 w(v i ) w(v i+1 ) r(u i ) (10.46)... Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F34/64 (pg.93/203)
94 Maximum weight independent set via weighted rank Proof. Now, we define i as follows i def = w(v i ) w(v i+1 ) for i =1,...,n 1 (10.43) n def = w(v n ) And the weight of the independent set w(i) is given by w(i) = X v2i w(v) = (10.44) nx w(v i ) r(u i ) r(u i 1 ) (10.45) i=1 nx 1 = w(v n )r(u n )+ i=1 w(v i ) w(v i+1 ) r(u i ) = nx i=1 ir(u i ) (10.46)... Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F34/64 (pg.94/203)
95 Maximum weight independent set via weighted rank Proof. Now, we define i as follows i def = w(v i ) w(v i+1 ) for i =1,...,n 1 (10.43) n def = w(v n ) And the weight of the independent set w(i) is given by w(i) = X v2i w(v) = (10.44) nx w(v i ) r(u i ) r(u i 1 ) (10.45) i=1 nx 1 = w(v n )r(u n )+ i=1 w(v i ) w(v i+1 ) r(u i ) = nx i=1 ir(u i ) (10.46) Since we took v 1,v 2,... in decreasing order, for all i, andsince w 2 R E +,wehave i 0 Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F34/64 (pg.95/203)
96 Linear Program LP Consider the linear programming primal problem maximize w x subject to x v 0 (v 2 V ) x(u) apple r(u) (8U V ) (10.47) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F35/64 (pg.96/203)
97 Linear Program LP Consider the linear programming primal problem maximize w x subject to x v 0 (v 2 V ) x(u) apple r(u) (8U V ) (10.47) And its convex dual (note y 2 R 2n +, y U is a scalar element within this exponentially big vector): P minimize U V y Ur(U), subject to y U 0 (8U V ) P U V y U1 U w (10.48) f Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F35/64 (pg.97/203)
98 Linear Program LP Consider the linear programming primal problem maximize w x subject to x v 0 (v 2 V ) x(u) apple r(u) (8U V ) (10.47) And its convex dual (note y 2 R 2n +, y U is a scalar element within this exponentially big vector): P minimize U V y Ur(U), subject to y U 0 (8U V ) P U V y U1 U w (10.48) Thanks to strong duality, the solutions to these are equal to each other. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F35/64 (pg.98/203)
99 Linear Program LP Consider the linear programming primal problem maximize w x s.t. x v 0 (v 2 V ) x(u) apple r(u) (8U V ) (10.49) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F36/64 (pg.99/203)
100 Linear Program LP Consider the linear programming primal problem maximize w x s.t. x v 0 (v 2 V ) x(u) apple r(u) (8U V ) (10.49) This is identical to the problem max w x such that x 2 P + r (10.50) where, again, P + r = x 2 R E : x 0,x(A) apple r(a), 8A E. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F36/64 (pg.100/203)
101 Linear Program LP Consider the linear programming primal problem maximize w x s.t. x v 0 (v 2 V ) x(u) apple r(u) (8U V ) (10.49) This is identical to the problem max w x such that x 2 P + r (10.50) where, again, P + r = x 2 R E : x 0,x(A) apple r(a), 8A E. Therefore, since P ind. set P + r, the above problem can only have a larger solution. I.e., max w x s.t. x 2 P ind. set apple max w x s.t. x 2 P + r. (10.51) - - Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F36/64 (pg.101/203)
102 Polytope equivalence Hence, we have the following relations: max {w(i) :I 2I}applemax {w x : x 2 P ind. set } (10.52) apple max w x : x 2 P r + (10.53) 8 9 < X def = min =min y : U r(u) :8U, y U 0; X = y U 1 U w ; U V U V (10.54) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F37/64 (pg.102/203)
103 Polytope equivalence Hence, we have the following relations: max {w(i) :I 2I}applemax {w x : x 2 P ind. set } (10.52) apple max w x : x 2 P r + (10.53) 8 9 < X def = min =min y : U r(u) :8U, y U 0; X = y U 1 U w ; U V U V Theorem states that (10.54) nx max {w(i) :I 2I}= ir(u i ) (10.55) i=1 +10 for the chain of U i s and i 0 that satisfies w = P n i=1 i1 Ui (i.e., the r.h.s. of Eq is feasible w.r.t. the dual LP). Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F37/64 (pg.103/203)
104 Polytope equivalence Hence, we have the following relations: max {w(i) :I 2I}applemax {w x : x 2 P ind. set } (10.52) apple max w x : x 2 P r + (10.53) 8 9 < X def = min =min y : U r(u) :8U, y U 0; X = y U 1 U w ; U V U V Theorem states that (10.54) nx max {w(i) :I 2I}= ir(u i ) (10.55) i=1 for the chain of U i s and i 0 that satisfies w = P n i=1 i1 Ui (i.e., the r.h.s. of Eq is feasible w.r.t. the dual LP). Therefore, we also have max {w(i) :I 2I}= i=1 Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F37/64 (pg.104/203) nx ir(u i ) min (10.56)
105 Polytope equivalence Hence, we have the following relations: max {w(i) :I 2I}applemax {w x : x 2 P ind. set } (10.52) apple max w x : x 2 P r + (10.53) 8 9 < X def = min =min y : U r(u) :8U, y U 0; X = y U 1 U w ; U V U V (10.54) Therefore, all the inequalities above are equalities. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F37/64 (pg.105/203)
106 Polytope equivalence Hence, we have the following relations: max {w(i) :I 2I}= max {w x : x 2 P ind. set } (10.52) = max w x : x 2 P r + (10.53) 8 9 < X def = min =min y : U r(u) :8U, y U 0; X = y U 1 U w ; U V U V (10.54) Therefore, all the inequalities above are equalities. : Fl And since w 2 R E + is an arbitrary direction into the positive orthant, we see that P r + = P ind. set Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F37/64 (pg.106/203)
107 Polytope equivalence Hence, we have the following relations: max {w(i) :I 2I}= max {w x : x 2 P ind. set } (10.52) = max w x : x 2 P r + (10.53) 8 9 < X def = min =min y : U r(u) :8U, y U 0; X = y U 1 U w ; U V U V (10.54) Therefore, all the inequalities above are equalities. And since w 2 R E + is an arbitrary direction into the positive orthant, we see that P r + = P ind. set That is, we have just proven: Theorem P + r = P ind. set (10.57) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F37/64 (pg.107/203)
108 Polytope Equivalence (Summarizing the above) For each I 2I of a matroid M =(E,I), wecanformtheincidence vector 1 I. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F38/64 (pg.108/203)
109 Polytope Equivalence (Summarizing the above) For each I 2I of a matroid M =(E,I), wecanformtheincidence vector 1 I. Taking the convex hull, we get the independent set polytope, that is P ind. set = conv {[ I2I {1 I }} (10.58) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F38/64 (pg.109/203)
110 Polytope Equivalence (Summarizing the above) For each I 2I of a matroid M =(E,I), wecanformtheincidence vector 1 I. Taking the convex hull, we get the independent set polytope, that is P ind. set = conv {[ I2I {1 I }} (10.58) Now take the rank function r of M, and define the following polyhedron: P + r = x 2 R E : x 0,x(A) apple r(a), 8A E (10.59) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F38/64 (pg.110/203)
111 Polytope Equivalence (Summarizing the above) For each I 2I of a matroid M =(E,I), wecanformtheincidence vector 1 I. Taking the convex hull, we get the independent set polytope, that is P ind. set = conv {[ I2I {1 I }} (10.58) Now take the rank function r of M, and define the following polyhedron: - polyto P + r = x 2 R E : x 0,x(A) apple r(a), 8A E (10.59) Theorem P + r = P ind. set (10.60) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F38/64 (pg.111/203)
112 Greedy solves a linear programming problem So we can describe the independence polytope of a matroid using the set of inequalities (an exponential number of them). Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F39/64 (pg.112/203)
113 Greedy solves a linear programming problem So we can describe the independence polytope of a matroid using the set of inequalities (an exponential number of them). In fact, considering equations starting at Eq 10.52, the LP problem with exponential number of constraints max {w x : x 2 P + r } is identical to the maximum weight independent set problem in a matroid, and since greedy solves the latter problem exactly, we have also proven: Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F39/64 (pg.113/203)
114 Greedy solves a linear programming problem So we can describe the independence polytope of a matroid using the set of inequalities (an exponential number of them). In fact, considering equations starting at Eq 10.52, the LP problem with exponential number of constraints max {w x : x 2 P + r } is identical to the maximum weight independent set problem in a matroid, and since greedy solves the latter problem exactly, we have also proven: Theorem The LP problem max {w x : x 2 P + r } can be solved exactly using the greedy algorithm. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F39/64 (pg.114/203)
115 Greedy solves a linear programming problem So we can describe the independence polytope of a matroid using the set of inequalities (an exponential number of them). In fact, considering equations starting at Eq 10.52, the LP problem with exponential number of constraints max {w x : x 2 P + r } is identical to the maximum weight independent set problem in a matroid, and since greedy solves the latter problem exactly, we have also proven: Theorem The LP problem max {w x : x 2 P + r } can be solved exactly using the greedy algorithm. Note that this LP problem has an exponential number of constraints (since P r + is described as the intersection of an exponential number of half spaces). Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F39/64 (pg.115/203)
116 Greedy solves a linear programming problem So we can describe the independence polytope of a matroid using the set of inequalities (an exponential number of them). In fact, considering equations starting at Eq 10.52, the LP problem with exponential number of constraints max {w x : x 2 P + r } is identical to the maximum weight independent set problem in a matroid, and since greedy solves the latter problem exactly, we have also proven: Theorem The LP problem max {w x : x 2 P + r } can be solved exactly using the greedy algorithm. Note that this LP problem has an exponential number of constraints (since P r + is described as the intersection of an exponential number of half spaces). This means that if LP problems have certain structure, they can be solved much easier than immediately implied by the equations. Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F39/64 (pg.116/203)
117 ... Matroid and Greedy Polyhedra Matroid Polytopes Polymatroid Base Polytope Equivalence Consider convex hull of indicator vectors just of the bases of a matroid, rather than all of the independent sets. Be opium " ( IB,, Ira,, Is,, :) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F40/64 (pg.117/203)
118 Base Polytope Equivalence Consider convex hull of indicator vectors just of the bases of a matroid, rather than all of the independent sets. Consider a polytope defined by the following constraints: x 0 (10.61) x(a) apple r(a) 8A V (10.62) x(v )=r(v ) (10.63) Prof. Je Bilmes EE596b/Spring 2016/Submodularity - Lecture 10 - May 2nd, 2016 F40/64 (pg.118/203)
Submodularity Reading Group. Matroid Polytopes, Polymatroid. M. Pawan Kumar
Submodularity Reading Group Matroid Polytopes, Polymatroid M. Pawan Kumar http://www.robots.ox.ac.uk/~oval/ Outline Linear Programming Matroid Polytopes Polymatroid Polyhedron Ax b A : m x n matrix b:
More informationInteger Programming Theory
Integer Programming Theory Laura Galli October 24, 2016 In the following we assume all functions are linear, hence we often drop the term linear. In discrete optimization, we seek to find a solution x
More informationMathematical and Algorithmic Foundations Linear Programming and Matchings
Adavnced Algorithms Lectures Mathematical and Algorithmic Foundations Linear Programming and Matchings Paul G. Spirakis Department of Computer Science University of Patras and Liverpool Paul G. Spirakis
More informationCombinatorial Optimization
Combinatorial Optimization Frank de Zeeuw EPFL 2012 Today Introduction Graph problems - What combinatorial things will we be optimizing? Algorithms - What kind of solution are we looking for? Linear Programming
More informationMA4254: Discrete Optimization. Defeng Sun. Department of Mathematics National University of Singapore Office: S Telephone:
MA4254: Discrete Optimization Defeng Sun Department of Mathematics National University of Singapore Office: S14-04-25 Telephone: 6516 3343 Aims/Objectives: Discrete optimization deals with problems of
More informationMath 5593 Linear Programming Lecture Notes
Math 5593 Linear Programming Lecture Notes Unit II: Theory & Foundations (Convex Analysis) University of Colorado Denver, Fall 2013 Topics 1 Convex Sets 1 1.1 Basic Properties (Luenberger-Ye Appendix B.1).........................
More information6. Lecture notes on matroid intersection
Massachusetts Institute of Technology 18.453: Combinatorial Optimization Michel X. Goemans May 2, 2017 6. Lecture notes on matroid intersection One nice feature about matroids is that a simple greedy algorithm
More informationmaximize c, x subject to Ax b,
Lecture 8 Linear programming is about problems of the form maximize c, x subject to Ax b, where A R m n, x R n, c R n, and b R m, and the inequality sign means inequality in each row. The feasible set
More informationCS 473: Algorithms. Ruta Mehta. Spring University of Illinois, Urbana-Champaign. Ruta (UIUC) CS473 1 Spring / 29
CS 473: Algorithms Ruta Mehta University of Illinois, Urbana-Champaign Spring 2018 Ruta (UIUC) CS473 1 Spring 2018 1 / 29 CS 473: Algorithms, Spring 2018 Simplex and LP Duality Lecture 19 March 29, 2018
More informationLinear programming and duality theory
Linear programming and duality theory Complements of Operations Research Giovanni Righini Linear Programming (LP) A linear program is defined by linear constraints, a linear objective function. Its variables
More informationAdvanced Operations Research Techniques IE316. Quiz 1 Review. Dr. Ted Ralphs
Advanced Operations Research Techniques IE316 Quiz 1 Review Dr. Ted Ralphs IE316 Quiz 1 Review 1 Reading for The Quiz Material covered in detail in lecture. 1.1, 1.4, 2.1-2.6, 3.1-3.3, 3.5 Background material
More informationLecture 2 - Introduction to Polytopes
Lecture 2 - Introduction to Polytopes Optimization and Approximation - ENS M1 Nicolas Bousquet 1 Reminder of Linear Algebra definitions Let x 1,..., x m be points in R n and λ 1,..., λ m be real numbers.
More informationCS522: Advanced Algorithms
Lecture 1 CS5: Advanced Algorithms October 4, 004 Lecturer: Kamal Jain Notes: Chris Re 1.1 Plan for the week Figure 1.1: Plan for the week The underlined tools, weak duality theorem and complimentary slackness,
More informationIn this chapter we introduce some of the basic concepts that will be useful for the study of integer programming problems.
2 Basics In this chapter we introduce some of the basic concepts that will be useful for the study of integer programming problems. 2.1 Notation Let A R m n be a matrix with row index set M = {1,...,m}
More informationCollege of Computer & Information Science Fall 2007 Northeastern University 14 September 2007
College of Computer & Information Science Fall 2007 Northeastern University 14 September 2007 CS G399: Algorithmic Power Tools I Scribe: Eric Robinson Lecture Outline: Linear Programming: Vertex Definitions
More information4 Integer Linear Programming (ILP)
TDA6/DIT37 DISCRETE OPTIMIZATION 17 PERIOD 3 WEEK III 4 Integer Linear Programg (ILP) 14 An integer linear program, ILP for short, has the same form as a linear program (LP). The only difference is that
More information1 Linear programming relaxation
Cornell University, Fall 2010 CS 6820: Algorithms Lecture notes: Primal-dual min-cost bipartite matching August 27 30 1 Linear programming relaxation Recall that in the bipartite minimum-cost perfect matching
More information8 Matroid Intersection
8 Matroid Intersection 8.1 Definition and examples 8.2 Matroid Intersection Algorithm 8.1 Definitions Given two matroids M 1 = (X, I 1 ) and M 2 = (X, I 2 ) on the same set X, their intersection is M 1
More informationLecture 5: Duality Theory
Lecture 5: Duality Theory Rajat Mittal IIT Kanpur The objective of this lecture note will be to learn duality theory of linear programming. We are planning to answer following questions. What are hyperplane
More informationSection Notes 5. Review of Linear Programming. Applied Math / Engineering Sciences 121. Week of October 15, 2017
Section Notes 5 Review of Linear Programming Applied Math / Engineering Sciences 121 Week of October 15, 2017 The following list of topics is an overview of the material that was covered in the lectures
More informationAMS : Combinatorial Optimization Homework Problems - Week V
AMS 553.766: Combinatorial Optimization Homework Problems - Week V For the following problems, A R m n will be m n matrices, and b R m. An affine subspace is the set of solutions to a a system of linear
More informationGraphs and Network Flows IE411. Lecture 21. Dr. Ted Ralphs
Graphs and Network Flows IE411 Lecture 21 Dr. Ted Ralphs IE411 Lecture 21 1 Combinatorial Optimization and Network Flows In general, most combinatorial optimization and integer programming problems are
More informationLecture 10,11: General Matching Polytope, Maximum Flow. 1 Perfect Matching and Matching Polytope on General Graphs
CMPUT 675: Topics in Algorithms and Combinatorial Optimization (Fall 2009) Lecture 10,11: General Matching Polytope, Maximum Flow Lecturer: Mohammad R Salavatipour Date: Oct 6 and 8, 2009 Scriber: Mohammad
More informationDiscrete Optimization 2010 Lecture 5 Min-Cost Flows & Total Unimodularity
Discrete Optimization 2010 Lecture 5 Min-Cost Flows & Total Unimodularity Marc Uetz University of Twente m.uetz@utwente.nl Lecture 5: sheet 1 / 26 Marc Uetz Discrete Optimization Outline 1 Min-Cost Flows
More informationCS 473: Algorithms. Ruta Mehta. Spring University of Illinois, Urbana-Champaign. Ruta (UIUC) CS473 1 Spring / 36
CS 473: Algorithms Ruta Mehta University of Illinois, Urbana-Champaign Spring 2018 Ruta (UIUC) CS473 1 Spring 2018 1 / 36 CS 473: Algorithms, Spring 2018 LP Duality Lecture 20 April 3, 2018 Some of the
More informationGreedy Algorithms and Matroids. Andreas Klappenecker
Greedy Algorithms and Matroids Andreas Klappenecker Giving Change Coin Changing Suppose we have n types of coins with values v[1] > v[2] > > v[n] > 0 Given an amount C, a positive integer, the following
More information1. Lecture notes on bipartite matching
Massachusetts Institute of Technology 18.453: Combinatorial Optimization Michel X. Goemans February 5, 2017 1. Lecture notes on bipartite matching Matching problems are among the fundamental problems in
More informationInteger Programming ISE 418. Lecture 7. Dr. Ted Ralphs
Integer Programming ISE 418 Lecture 7 Dr. Ted Ralphs ISE 418 Lecture 7 1 Reading for This Lecture Nemhauser and Wolsey Sections II.3.1, II.3.6, II.4.1, II.4.2, II.5.4 Wolsey Chapter 7 CCZ Chapter 1 Constraint
More informationCOMP331/557. Chapter 2: The Geometry of Linear Programming. (Bertsimas & Tsitsiklis, Chapter 2)
COMP331/557 Chapter 2: The Geometry of Linear Programming (Bertsimas & Tsitsiklis, Chapter 2) 49 Polyhedra and Polytopes Definition 2.1. Let A 2 R m n and b 2 R m. a set {x 2 R n A x b} is called polyhedron
More informationLecture 4: Primal Dual Matching Algorithm and Non-Bipartite Matching. 1 Primal/Dual Algorithm for weighted matchings in Bipartite Graphs
CMPUT 675: Topics in Algorithms and Combinatorial Optimization (Fall 009) Lecture 4: Primal Dual Matching Algorithm and Non-Bipartite Matching Lecturer: Mohammad R. Salavatipour Date: Sept 15 and 17, 009
More informationCS675: Convex and Combinatorial Optimization Spring 2018 Consequences of the Ellipsoid Algorithm. Instructor: Shaddin Dughmi
CS675: Convex and Combinatorial Optimization Spring 2018 Consequences of the Ellipsoid Algorithm Instructor: Shaddin Dughmi Outline 1 Recapping the Ellipsoid Method 2 Complexity of Convex Optimization
More informationLec13p1, ORF363/COS323
Lec13 Page 1 Lec13p1, ORF363/COS323 This lecture: Semidefinite programming (SDP) Definition and basic properties Review of positive semidefinite matrices SDP duality SDP relaxations for nonconvex optimization
More information5. Lecture notes on matroid intersection
Massachusetts Institute of Technology Handout 14 18.433: Combinatorial Optimization April 1st, 2009 Michel X. Goemans 5. Lecture notes on matroid intersection One nice feature about matroids is that a
More informationCS599: Convex and Combinatorial Optimization Fall 2013 Lecture 14: Combinatorial Problems as Linear Programs I. Instructor: Shaddin Dughmi
CS599: Convex and Combinatorial Optimization Fall 2013 Lecture 14: Combinatorial Problems as Linear Programs I Instructor: Shaddin Dughmi Announcements Posted solutions to HW1 Today: Combinatorial problems
More informationLP Geometry: outline. A general LP. minimize x c T x s.t. a T i. x b i, i 2 M 1 a T i x = b i, i 2 M 3 x j 0, j 2 N 1. where
LP Geometry: outline I Polyhedra I Extreme points, vertices, basic feasible solutions I Degeneracy I Existence of extreme points I Optimality of extreme points IOE 610: LP II, Fall 2013 Geometry of Linear
More informationAdvanced Operations Research Techniques IE316. Quiz 2 Review. Dr. Ted Ralphs
Advanced Operations Research Techniques IE316 Quiz 2 Review Dr. Ted Ralphs IE316 Quiz 2 Review 1 Reading for The Quiz Material covered in detail in lecture Bertsimas 4.1-4.5, 4.8, 5.1-5.5, 6.1-6.3 Material
More information1. Lecture notes on bipartite matching February 4th,
1. Lecture notes on bipartite matching February 4th, 2015 6 1.1.1 Hall s Theorem Hall s theorem gives a necessary and sufficient condition for a bipartite graph to have a matching which saturates (or matches)
More informationLecture 5: Properties of convex sets
Lecture 5: Properties of convex sets Rajat Mittal IIT Kanpur This week we will see properties of convex sets. These properties make convex sets special and are the reason why convex optimization problems
More informationLinear Programming: Introduction
CSC 373 - Algorithm Design, Analysis, and Complexity Summer 2016 Lalla Mouatadid Linear Programming: Introduction A bit of a historical background about linear programming, that I stole from Jeff Erickson
More informationPOLYHEDRAL GEOMETRY. Convex functions and sets. Mathematical Programming Niels Lauritzen Recall that a subset C R n is convex if
POLYHEDRAL GEOMETRY Mathematical Programming Niels Lauritzen 7.9.2007 Convex functions and sets Recall that a subset C R n is convex if {λx + (1 λ)y 0 λ 1} C for every x, y C and 0 λ 1. A function f :
More informationGreedy Algorithms and Matroids. Andreas Klappenecker
Greedy Algorithms and Matroids Andreas Klappenecker Greedy Algorithms A greedy algorithm solves an optimization problem by working in several phases. In each phase, a decision is made that is locally optimal
More informationMatching Algorithms. Proof. If a bipartite graph has a perfect matching, then it is easy to see that the right hand side is a necessary condition.
18.433 Combinatorial Optimization Matching Algorithms September 9,14,16 Lecturer: Santosh Vempala Given a graph G = (V, E), a matching M is a set of edges with the property that no two of the edges have
More informationApproximation Algorithms
Approximation Algorithms Prof. Tapio Elomaa tapio.elomaa@tut.fi Course Basics A 4 credit unit course Part of Theoretical Computer Science courses at the Laboratory of Mathematics There will be 4 hours
More informationDM545 Linear and Integer Programming. Lecture 2. The Simplex Method. Marco Chiarandini
DM545 Linear and Integer Programming Lecture 2 The Marco Chiarandini Department of Mathematics & Computer Science University of Southern Denmark Outline 1. 2. 3. 4. Standard Form Basic Feasible Solutions
More informationLesson 17. Geometry and Algebra of Corner Points
SA305 Linear Programming Spring 2016 Asst. Prof. Nelson Uhan 0 Warm up Lesson 17. Geometry and Algebra of Corner Points Example 1. Consider the system of equations 3 + 7x 3 = 17 + 5 = 1 2 + 11x 3 = 24
More information15-451/651: Design & Analysis of Algorithms October 11, 2018 Lecture #13: Linear Programming I last changed: October 9, 2018
15-451/651: Design & Analysis of Algorithms October 11, 2018 Lecture #13: Linear Programming I last changed: October 9, 2018 In this lecture, we describe a very general problem called linear programming
More information5.3 Cutting plane methods and Gomory fractional cuts
5.3 Cutting plane methods and Gomory fractional cuts (ILP) min c T x s.t. Ax b x 0integer feasible region X Assumption: a ij, c j and b i integer. Observation: The feasible region of an ILP can be described
More informationIn this lecture, we ll look at applications of duality to three problems:
Lecture 7 Duality Applications (Part II) In this lecture, we ll look at applications of duality to three problems: 1. Finding maximum spanning trees (MST). We know that Kruskal s algorithm finds this,
More information2. Convex sets. x 1. x 2. affine set: contains the line through any two distinct points in the set
2. Convex sets Convex Optimization Boyd & Vandenberghe affine and convex sets some important examples operations that preserve convexity generalized inequalities separating and supporting hyperplanes dual
More information6.854 Advanced Algorithms. Scribes: Jay Kumar Sundararajan. Duality
6.854 Advanced Algorithms Scribes: Jay Kumar Sundararajan Lecturer: David Karger Duality This lecture covers weak and strong duality, and also explains the rules for finding the dual of a linear program,
More informationPolytopes Course Notes
Polytopes Course Notes Carl W. Lee Department of Mathematics University of Kentucky Lexington, KY 40506 lee@ms.uky.edu Fall 2013 i Contents 1 Polytopes 1 1.1 Convex Combinations and V-Polytopes.....................
More informationMath 414 Lecture 2 Everyone have a laptop?
Math 44 Lecture 2 Everyone have a laptop? THEOREM. Let v,...,v k be k vectors in an n-dimensional space and A = [v ;...; v k ] v,..., v k independent v,..., v k span the space v,..., v k a basis v,...,
More information3 No-Wait Job Shops with Variable Processing Times
3 No-Wait Job Shops with Variable Processing Times In this chapter we assume that, on top of the classical no-wait job shop setting, we are given a set of processing times for each operation. We may select
More informationOptimality certificates for convex minimization and Helly numbers
Optimality certificates for convex minimization and Helly numbers Amitabh Basu Michele Conforti Gérard Cornuéjols Robert Weismantel Stefan Weltge May 10, 2017 Abstract We consider the problem of minimizing
More informationLecture 2 September 3
EE 381V: Large Scale Optimization Fall 2012 Lecture 2 September 3 Lecturer: Caramanis & Sanghavi Scribe: Hongbo Si, Qiaoyang Ye 2.1 Overview of the last Lecture The focus of the last lecture was to give
More informationConvex Geometry arising in Optimization
Convex Geometry arising in Optimization Jesús A. De Loera University of California, Davis Berlin Mathematical School Summer 2015 WHAT IS THIS COURSE ABOUT? Combinatorial Convexity and Optimization PLAN
More informationSome Advanced Topics in Linear Programming
Some Advanced Topics in Linear Programming Matthew J. Saltzman July 2, 995 Connections with Algebra and Geometry In this section, we will explore how some of the ideas in linear programming, duality theory,
More information11 Linear Programming
11 Linear Programming 11.1 Definition and Importance The final topic in this course is Linear Programming. We say that a problem is an instance of linear programming when it can be effectively expressed
More informationShannon Switching Game
EECS 495: Combinatorial Optimization Lecture 1 Shannon s Switching Game Shannon Switching Game In the Shannon switching game, two players, Join and Cut, alternate choosing edges on a graph G. Join s objective
More information12.1 Formulation of General Perfect Matching
CSC5160: Combinatorial Optimization and Approximation Algorithms Topic: Perfect Matching Polytope Date: 22/02/2008 Lecturer: Lap Chi Lau Scribe: Yuk Hei Chan, Ling Ding and Xiaobing Wu In this lecture,
More informationEC 521 MATHEMATICAL METHODS FOR ECONOMICS. Lecture 2: Convex Sets
EC 51 MATHEMATICAL METHODS FOR ECONOMICS Lecture : Convex Sets Murat YILMAZ Boğaziçi University In this section, we focus on convex sets, separating hyperplane theorems and Farkas Lemma. And as an application
More informationGreedy Algorithms and Matroids. Andreas Klappenecker
Greedy Algorithms and Matroids Andreas Klappenecker Greedy Algorithms A greedy algorithm solves an optimization problem by working in several phases. In each phase, a decision is made that is locally optimal
More informationOutline. CS38 Introduction to Algorithms. Linear programming 5/21/2014. Linear programming. Lecture 15 May 20, 2014
5/2/24 Outline CS38 Introduction to Algorithms Lecture 5 May 2, 24 Linear programming simplex algorithm LP duality ellipsoid algorithm * slides from Kevin Wayne May 2, 24 CS38 Lecture 5 May 2, 24 CS38
More informationCS 473: Algorithms. Ruta Mehta. Spring University of Illinois, Urbana-Champaign. Ruta (UIUC) CS473 1 Spring / 50
CS 473: Algorithms Ruta Mehta University of Illinois, Urbana-Champaign Spring 2018 Ruta (UIUC) CS473 1 Spring 2018 1 / 50 CS 473: Algorithms, Spring 2018 Introduction to Linear Programming Lecture 18 March
More informationIntroduction to Mathematical Programming IE496. Final Review. Dr. Ted Ralphs
Introduction to Mathematical Programming IE496 Final Review Dr. Ted Ralphs IE496 Final Review 1 Course Wrap-up: Chapter 2 In the introduction, we discussed the general framework of mathematical modeling
More informationOptimality certificates for convex minimization and Helly numbers
Optimality certificates for convex minimization and Helly numbers Amitabh Basu Michele Conforti Gérard Cornuéjols Robert Weismantel Stefan Weltge October 20, 2016 Abstract We consider the problem of minimizing
More informationProblem set 2. Problem 1. Problem 2. Problem 3. CS261, Winter Instructor: Ashish Goel.
CS261, Winter 2017. Instructor: Ashish Goel. Problem set 2 Electronic submission to Gradescope due 11:59pm Thursday 2/16. Form a group of 2-3 students that is, submit one homework with all of your names.
More information/633 Introduction to Algorithms Lecturer: Michael Dinitz Topic: Approximation algorithms Date: 11/27/18
601.433/633 Introduction to Algorithms Lecturer: Michael Dinitz Topic: Approximation algorithms Date: 11/27/18 22.1 Introduction We spent the last two lectures proving that for certain problems, we can
More informationSimplex Algorithm in 1 Slide
Administrivia 1 Canonical form: Simplex Algorithm in 1 Slide If we do pivot in A r,s >0, where c s
More informationTHEORY OF LINEAR AND INTEGER PROGRAMMING
THEORY OF LINEAR AND INTEGER PROGRAMMING ALEXANDER SCHRIJVER Centrum voor Wiskunde en Informatica, Amsterdam A Wiley-Inter science Publication JOHN WILEY & SONS^ Chichester New York Weinheim Brisbane Singapore
More information2. Convex sets. affine and convex sets. some important examples. operations that preserve convexity. generalized inequalities
2. Convex sets Convex Optimization Boyd & Vandenberghe affine and convex sets some important examples operations that preserve convexity generalized inequalities separating and supporting hyperplanes dual
More information3. The Simplex algorithmn The Simplex algorithmn 3.1 Forms of linear programs
11 3.1 Forms of linear programs... 12 3.2 Basic feasible solutions... 13 3.3 The geometry of linear programs... 14 3.4 Local search among basic feasible solutions... 15 3.5 Organization in tableaus...
More informationMathematical Programming and Research Methods (Part II)
Mathematical Programming and Research Methods (Part II) 4. Convexity and Optimization Massimiliano Pontil (based on previous lecture by Andreas Argyriou) 1 Today s Plan Convex sets and functions Types
More informationLecture notes on the simplex method September We will present an algorithm to solve linear programs of the form. maximize.
Cornell University, Fall 2017 CS 6820: Algorithms Lecture notes on the simplex method September 2017 1 The Simplex Method We will present an algorithm to solve linear programs of the form maximize subject
More informationLinear Programming in Small Dimensions
Linear Programming in Small Dimensions Lekcija 7 sergio.cabello@fmf.uni-lj.si FMF Univerza v Ljubljani Edited from slides by Antoine Vigneron Outline linear programming, motivation and definition one dimensional
More informationGreedy algorithms is another useful way for solving optimization problems.
Greedy Algorithms Greedy algorithms is another useful way for solving optimization problems. Optimization Problems For the given input, we are seeking solutions that must satisfy certain conditions. These
More informationC&O 355 Lecture 16. N. Harvey
C&O 355 Lecture 16 N. Harvey Topics Review of Fourier-Motzkin Elimination Linear Transformations of Polyhedra Convex Combinations Convex Hulls Polytopes & Convex Hulls Fourier-Motzkin Elimination Joseph
More informationLecture 4: Rational IPs, Polyhedron, Decomposition Theorem
IE 5: Integer Programming, Spring 29 24 Jan, 29 Lecture 4: Rational IPs, Polyhedron, Decomposition Theorem Lecturer: Karthik Chandrasekaran Scribe: Setareh Taki Disclaimer: These notes have not been subjected
More informationAMATH 383 Lecture Notes Linear Programming
AMATH 8 Lecture Notes Linear Programming Jakob Kotas (jkotas@uw.edu) University of Washington February 4, 014 Based on lecture notes for IND E 51 by Zelda Zabinsky, available from http://courses.washington.edu/inde51/notesindex.htm.
More informationB r u n o S i m e o n e. La Sapienza University, ROME, Italy
B r u n o S i m e o n e La Sapienza University, ROME, Italy Pietre Miliari 3 Ottobre 26 2 THE MAXIMUM MATCHING PROBLEM Example : Postmen hiring in the province of L Aquila Panconesi Barisciano Petreschi
More informationSubmodular Optimization
Submodular Optimization Nathaniel Grammel N. Grammel Submodular Optimization 1 / 28 Submodularity Captures the notion of Diminishing Returns Definition Suppose U is a set. A set function f :2 U! R is submodular
More informationCOMP260 Spring 2014 Notes: February 4th
COMP260 Spring 2014 Notes: February 4th Andrew Winslow In these notes, all graphs are undirected. We consider matching, covering, and packing in bipartite graphs, general graphs, and hypergraphs. We also
More information4 LINEAR PROGRAMMING (LP) E. Amaldi Fondamenti di R.O. Politecnico di Milano 1
4 LINEAR PROGRAMMING (LP) E. Amaldi Fondamenti di R.O. Politecnico di Milano 1 Mathematical programming (optimization) problem: min f (x) s.t. x X R n set of feasible solutions with linear objective function
More informationChapter 15 Introduction to Linear Programming
Chapter 15 Introduction to Linear Programming An Introduction to Optimization Spring, 2015 Wei-Ta Chu 1 Brief History of Linear Programming The goal of linear programming is to determine the values of
More informationLecture 6: Faces, Facets
IE 511: Integer Programming, Spring 2019 31 Jan, 2019 Lecturer: Karthik Chandrasekaran Lecture 6: Faces, Facets Scribe: Setareh Taki Disclaimer: These notes have not been subjected to the usual scrutiny
More information60 2 Convex sets. {x a T x b} {x ã T x b}
60 2 Convex sets Exercises Definition of convexity 21 Let C R n be a convex set, with x 1,, x k C, and let θ 1,, θ k R satisfy θ i 0, θ 1 + + θ k = 1 Show that θ 1x 1 + + θ k x k C (The definition of convexity
More informationCS 372: Computational Geometry Lecture 10 Linear Programming in Fixed Dimension
CS 372: Computational Geometry Lecture 10 Linear Programming in Fixed Dimension Antoine Vigneron King Abdullah University of Science and Technology November 7, 2012 Antoine Vigneron (KAUST) CS 372 Lecture
More informationAM 221: Advanced Optimization Spring 2016
AM 221: Advanced Optimization Spring 2016 Prof. Yaron Singer Lecture 2 Wednesday, January 27th 1 Overview In our previous lecture we discussed several applications of optimization, introduced basic terminology,
More informationApproximation Algorithms
Approximation Algorithms Group Members: 1. Geng Xue (A0095628R) 2. Cai Jingli (A0095623B) 3. Xing Zhe (A0095644W) 4. Zhu Xiaolu (A0109657W) 5. Wang Zixiao (A0095670X) 6. Jiao Qing (A0095637R) 7. Zhang
More informationLecture Notes 2: The Simplex Algorithm
Algorithmic Methods 25/10/2010 Lecture Notes 2: The Simplex Algorithm Professor: Yossi Azar Scribe:Kiril Solovey 1 Introduction In this lecture we will present the Simplex algorithm, finish some unresolved
More informationDual-fitting analysis of Greedy for Set Cover
Dual-fitting analysis of Greedy for Set Cover We showed earlier that the greedy algorithm for set cover gives a H n approximation We will show that greedy produces a solution of cost at most H n OPT LP
More informationConic Duality. yyye
Conic Linear Optimization and Appl. MS&E314 Lecture Note #02 1 Conic Duality Yinyu Ye Department of Management Science and Engineering Stanford University Stanford, CA 94305, U.S.A. http://www.stanford.edu/
More informationDM515 Spring 2011 Weekly Note 7
Institut for Matematik og Datalogi Syddansk Universitet May 18, 2011 JBJ DM515 Spring 2011 Weekly Note 7 Stuff covered in Week 20: MG sections 8.2-8,3 Overview of the course Hints for the exam Note that
More informationNATCOR Convex Optimization Linear Programming 1
NATCOR Convex Optimization Linear Programming 1 Julian Hall School of Mathematics University of Edinburgh jajhall@ed.ac.uk 5 June 2018 What is linear programming (LP)? The most important model used in
More informationLinear Matroid Intersection is in quasi-nc
Linear Matroid Intersection is in quasi-nc Rohit Gurjar 1 and Thomas Thierauf 2 1 California Institute of Technology 2 Aalen University August 20, 2018 Abstract Given two matroids on the same ground set,
More informationAdvanced Linear Programming. Organisation. Lecturers: Leen Stougie, CWI and Vrije Universiteit in Amsterdam
Advanced Linear Programming Organisation Lecturers: Leen Stougie, CWI and Vrije Universiteit in Amsterdam E-mail: stougie@cwi.nl Marjan van den Akker Universiteit Utrecht marjan@cs.uu.nl Advanced Linear
More informationLecture 9: Pipage Rounding Method
Recent Advances in Approximation Algorithms Spring 2015 Lecture 9: Pipage Rounding Method Lecturer: Shayan Oveis Gharan April 27th Disclaimer: These notes have not been subjected to the usual scrutiny
More informationInteger and Combinatorial Optimization
Integer and Combinatorial Optimization GEORGE NEMHAUSER School of Industrial and Systems Engineering Georgia Institute of Technology Atlanta, Georgia LAURENCE WOLSEY Center for Operations Research and
More informationLecture 3: Convex sets
Lecture 3: Convex sets Rajat Mittal IIT Kanpur We denote the set of real numbers as R. Most of the time we will be working with space R n and its elements will be called vectors. Remember that a subspace
More informationLP-Modelling. dr.ir. C.A.J. Hurkens Technische Universiteit Eindhoven. January 30, 2008
LP-Modelling dr.ir. C.A.J. Hurkens Technische Universiteit Eindhoven January 30, 2008 1 Linear and Integer Programming After a brief check with the backgrounds of the participants it seems that the following
More information