- 734 Views
- Uploaded on

Download Presentation
## PowerPoint Slideshow about 'Introduction to PCP' - ostinmannual

**An Image/Link below is provided (as is) to download presentation**

Download Policy: Content on the Website is provided to you AS IS for your information and personal use and may not be sold / licensed / shared on other websites without getting consent from its author.While downloading, if for some reason you are not able to download a presentation, the publisher may have deleted the file from their server.

- - - - - - - - - - - - - - - - - - - - - - - - - - E N D - - - - - - - - - - - - - - - - - - - - - - - - - -

Presentation Transcript

Introduction

In this lecture we’ll cover:

- Definition of PCP
- Prove some classical hardness of approximation results
- Review some recent ones

Review: Decision, Optimization Problems

- A decision problem is

a Boolean function ƒ(X), or alternatively

a languageL {0, 1}* comprising all strings for which ƒ is TRUE: L = { X {0, 1}* | ƒ(X) }

- An optimization problem is

a function ƒ(X, Y) which, given X, is to be maximized (or minimized) over all possible Y’s: maxy[ ƒ(X, Y) ]

- A threshold version of max-ƒ(X, Y) is

the languageLt of all strings X for which there exists Y such that ƒ(X, Y) t

[transforming an optimization problem into decision]

Review: The Class NP

The classical definition of the class NP is:

A language L {0, 1}* belongs to the classNP, if there exists a Turing machine VL[referred to as a verifier] such that

X L there exists a witnessY such thatVL(X, Y)accepts, in time |X|O(1)

That is, VL can verify a membership-proof of X in L in time polynomial in the length of X

Review: NP-Hardness

- A language L is said to be NP-hard if an efficient (polynomial-time) procedure for L can be utilized to obtain an efficient procedure for any NP-language
- This definition allows efficient reduction that use the more general, Cook reduction. An efficient algorithm, translating any NP problem to a single instance of L - thereby showing that LNP-hard - is referred to as Karp reduction

Review: Characterizing NP

Thm[Cook,Levin]:For L NP there’s an algorithm that, on input X, constructs, in time |X|O(1), a set of local-constraints (Boolean functions)L,X = { j1, ..., jl }over variables y1,...,ym s.t.:

- each of j1, ..., jl depends on o(1) variables
- X L there exists an assignment A: { y1, ..., ym } a { 0, 1 }satisfying all L,X

[ note that m and l must be at most polynomial in |X| ]

Approximation - Some Definitions

Def: g-approximation

A g-approximationof a maximization (similar for minimization) function f, is an algorithm that on input X, outputs f’(X) such that:

f’(X) f(X)/g(|X|).

Def: PTAS (poly-time approximation scheme)

We say that a maximization function f, has a PTAS, if for every g, there is a polynomial pg and a g-approximationfor f, whose running time is pg(|X|)

Approximation - NP-hard?

- We know that by using Cook/Karp reductions, we can show many decision problems to be NP-hard.
- Can an approximation problem be NP-Hard?
- One can easily show, that if there is g,for which there is a g-approximating for TSP, P=NP.

AS,ALMSS

X L assignment A: { y1, ..., ym } { 0, 1 }satisfies < ½ fraction of L,X

Characterization of NPThm[Cook,Levin]:For L NP there’s an algorithm that, on input X, constructs, in time |X|O(1), a set of local-constraints (Boolean functions)L,X = { j1, ..., jl }over variables y1,...,ym s.t.:

- each of j1, ..., jl depends on o(1) variables
- X L there exists an assignment A: { y1, ..., ym } a { 0, 1 }satisfying all L,X

T

F

F

T

T

PCP NP characterization1

y1

IfX L,at least

half of the

local tests aren’t

satisfied !

y2

j

yi

ym-1

ym

l

Probabilistically Checkable Proofs

- Hence, Cook-Levin theorem states that a verifier can efficiently verify membership-proofs for any NP language
- PCP characterization of NP, in contrast, states that a membership-proof can be verified probabilistically
- by choosing randomly one local-constraint,
- accessing the small set of variables it depends on,
- accept or reject accordingly
- erroneously accepting a non-member only with small probability

Gap Problems

- A gap-problem is a maximization (or minimization) problem ƒ(X, Y), and two thresholds t1 > t2

X must be accepted if maxY[ ƒ(X, Y) ] t1

X must be rejected if maxY[ ƒ(X, Y) ] t2

other X’s may be accepted or rejected (don’t care)

(almost a decision problem, relates to approximation)

Reducing gap-Problems to Approximation Problems

- Using an efficient approximation algorithm for ƒ(X, Y) to within a factor g,one can efficiently solve the corresponding gap problem gap-ƒ(X, Y), as long as t1 /t2 > g2
- Simply run the approximation algorithm.The outcome clearly determines which side of the gap the given input falls in.(Hence, proving a gap problem NP-hard translates to its approximation version, for appropriate factors )

gap-SAT

- Def: gap-SAT[D, v, ] is as follows:
- Instance: a set = { j1, ..., jl }of Boolean-functions (local-constraints)over variables y1,...,ym of range 2V
- Locality: each of j1, ..., jl depends on at mostD variables
- Maximum-Satisfied-Fraction is the fraction of satisfied by an assignment A: { y1, ..., ym } a 2vif this fraction
- = 1 accept
- < reject
- D, v and may be a function of l

The PCP Hierarchy

Def:L PCP[ D, V, ]if L is efficiently reducible to gap-SAT[ D, V, ]

- Thm[AS,ALMSS] NP PCP[ O(1), 1, ½] [ The PCP characterization theorem above ]
- Thm[ RaSa ] NP PCP[ O(1), m, 2-m ] for m logc n for some c > 0
- Thm[ DFKRS ]NP PCP[ O(1), m, 2-m ] for m logc n for any c < 1
- Conjecture[BGLR]NP PCP[ O(1), m, 2-m ] for m log n

Optimal Characterization

- One cannot expect the error-probability to be less than exponentially small in the number of bits each local-test looks at
- since a random assignment would make such a fraction of the local-tests satisfied
- One cannot hope for smaller than polynomially small error-probability
- since it would imply less than one local-test satisfied, hence each local-test, being rather easy to compute, determines completely the outcome

[ the BGLR conjecture is hence optimal in that respect]

Approximating MAX-IS is NP-hard

We will reduce gap-SAT to gap –Independent-Set.

Given an expression = { j1, ..., jl }of Boolean-functions over variables y1,...,ym of range 2V, Each of j1, ..., jl depends on at mostD variables, we must determine whether all the functions can be satisfied or only a fraction less than .

We will construct a graph, G , that has an independent set of size r there exists an assignment, satisfying r of the local-constraints y1,...,ym.

(q,r)-co-partite Graph G=(QR, E)

- Comprise q=|Q| cliques of size r=|R|:E {(<i,j1>, <i,j2>) | iQ, j1,j2 R}

Thm:IS( r, ) is NP-hard as long as r ( 1 / )cfor some constant c

Gap Independent-SetInstance: an (q,r)-co-partite graph G=(qR, E)

Problem: distinguish between

- Good: IS(G) = q
- Bad: every set I V s.t. |I|> q contains an edge

T

T

l

F

T

T

T

F

T

gap-SAT gap-ISConstruct a graphG that has 1 clique i ,

in which 1 vertex satisfying assignment for i

1

y1

y2

j

yi

ym-1

ym

l

T

T

l

F

T

T

T

F

T

gap-SAT gap-ISTwo vertices are connected if the assignments they represent are inconsistent

1

y1

y2

j

yi

ym-1

ym

l

gap-SAT gap-IS

Lemma:a(G) = k (independent set of size k) X L (There is an assignment that satisfies k clauses)

- Consider an assignment A satisfying k clauses. For each clause i consider A's restriction to ji‘s variables The corresponding k vertexes form an independent set in G
- Any independent set of size k in G implies an assignment satisfying k of j1, ..., jl

Hence: Gap-IS is NP hard, and IS is NP-hard to approximate!

Hardness of approximation of Max-IS

Each of the following theorems gives a hardness of approximation result of Max-IS:

- Thm[AS,ALMSS] NP PCP[ O(1), 1, ½]
- Thm[ RaSa ] NP PCP[ O(1), m, 2-m ] for m logc n for some c > 0
- Thm[ DFKRS ]NP PCP[ O(1), m, 2-m ] for m logc n for any c > 0
- Conjecture[BGLR]NP PCP[ O(1), m, 2-m ] for m log n

Hardness of approximation forMax-3SAT

Assuming the PCP theorem, we will show that if PNP,Max-3Sat does not have a PTAS:

Theorem: There is a constant C>0 so that computing (1+c) approximations to Max-3Sat is NP-hard

C1

C3

C2

Ck

1

y1

y2

j

C1

C3

C2

Ck

j

yi

ym-1

l

ym

C1

C3

C2

Ck

l

Hardness of approximation forMax-3SATSAT formula

Equivalent 3SAT formula

variables

Given an instance of gap-SAT, = { j1, ..., jl }, we will

transform each of the ji‘s into a 3-SAT expression i.

C1

C3

C2

Ck

1

y1

y2

j

C1

C3

C2

Ck

j

yi

ym-1

l

ym

C1

C3

C2

Ck

l

Hardness of approximation forMax-3SAT- Hence each function can be represented as a CNF formula i:

Given an instance of gap-SAT, = { j1, ..., jl }, there are O(n) functions ji . Each of the ji‘s depends on up to D=O(1) variables.

(a conjunction of 2^D clauses, each of size at most D)

Note that the number of clauses is still constant.

Overall, we build a CNF formula: a conjunction of i (one for or each local test).

C1

C3

C2

Ck

1

y1

y2

j

C1

C3

C2

Ck

j

yi

ym-1

l

ym

C1

C3

C2

Ck

l

Hardness of approximation forMax-3SATNow rewrite every D-clause as a group of 3-clauses to obtain a 3-CNF:

Note that this is still a constant blow up in the number of clauses.

C1

C3

C2

Ck

1

y1

y2

j

C1

C3

C2

Ck

j

yi

ym-1

l

ym

C1

C3

C2

Ck

l

Hardness of approximation forMax-3SATIn case is NOT satisfyable, some constant fraction of the j1 are not satisfied, and for each, at least one clause in i isn’t satisfied.

Hardness of approximation forMax-3SAT

Conclusion:

In case the original SAT formula isn’t satisfied, a constant number of 3SAT formula i are not satisfied, and for each at least one clause isn’t satisfied.

Because each i contains a constant number of clauses, altogether a constant number of clauses in the resulting 3SAT aren’t satisfied.

This provides a gap, and hence 3SAT cannot be approximated to within some constant unless P=NP!

More Results Related to PCP

The PCP theorem has ushered in a new era of hardness of approximation results. Here we list a few:

- We showed that Max-Clique ( and equivalently Max-Independent-Set ) do not has a PTAS. It is known in addition, that to approximate it with a factor of n1- is hard unless co-RP = NP.
- Chromatic Number - It is NP-Hard to approximate it within a factor of n1- unless co-RP = NP. There is a simple reduction from Max-Clique which shows that it is NP-Hard to approximate with factor n.
- Chromatic Number for 3-colorable graph - NP-Hard to approximate with factor 5/3-(i.e. to differentiate between 4 and 3). Can be approximated within O(nlogO(1) n).

More Results Related to PCP

- Vertex Cover – Very easy to approximate within a factor of 2. NP-Hard to approximate it within a factor of 4/3.
- Max-3-Sat – Known to be approximable within a factor of 8/7. NP-Hard to approximate within a factor of 8/7- for every >0
- Set Cover - NP-Hard to approximate it within a factor of ln n. Cannot be approximated within factor (1-)ln n unless NP Dtime(nloglogn).

More Results Related to PCP

- Maximum Satisfying Linear Sub-System - The problem: Given a linear system Ax=b (A is n x m matrix ) in field F, find the largest number of equations that can be satisfied by some x.
- If all equations can be satisfied the problem is in P.
- If F=Q NP-Hard to approximate by factor m. Can be approximated in O(m/logm).
- If F=GF(q) can be approximated by factor q (even a random assignment gives such a factor). NP-Hard to approximate within q-. Also NP-Hard for equations with only 3 variables.
- For equations with only 2 variables. NP-Hard to approximated within 1.0909 but can be approximated within 1.383

Download Presentation

Connecting to Server..