alternating quantifiers
DESCRIPTION
Alternating Quantifiers. Probabilistic TMs. q 8. Random Divide. Amplification. BPP in PH. Yes-instance. {0, 1} m. No-instance. {0, 1} m. Proof. Probability Random s i ’s is Bad. For x L. Q.E.D!. WWindex. - PowerPoint PPT PresentationTRANSCRIPT
Polynomial-Time Hierarchy
And Random Computations
Goal:•Introduce the Polynomial-time Hierarchy (PH)•Introduce BPP•Show the relationship between the two
Plan:•PH as an extension of SAT•Define probabilistic TMs and BPP•BPP2
Alternating QuantifiersSAT: NP-Complete
x1 …xn (x1 …xn )
TQBF: PSPACE-Complete
x1x2…xn (x1 …xn )
Definition (PH):
• TQBF with first quantifier and i-1 alternation is i-complete: x1x2… xn (x1,…xn)
• close under Karp-reduction• i = co-i
• PH = i i
Type of formula complete for i?
# of alternation independent of size
Polynomial Time Hierarchy:1=NP •‘’ on all SAT variables
1=coNP •Complement of NP
Hierarchy: • ii+1 and ii+1
Limit •PHPSPACE
Collapse •NP=coNP PH=NP•By induction on i, i=NP
4
PSPACE
1=NP
1=coNP
P
Accept Prob.
• Prr[M(x,r)]
LBPP if:• probabilistic poly-time TM M,
x Prr[M(x,r) = `x L’] > 2/3
Probabilistic TM
• Special random tape
Probabilistic TMs
5
a a
b a
b -
_ _
_ _
_ -
q8
For any input x
6
Random Divide
NoteTMs that are right on most x’s (e.g for PRIMES: always say ‘NO’) are something else (average case complexity)
All random strings
Strings M errs on
Claim:
• LBPP probabilistic poly-time TM M’ and a polynomial p(n) s.t. x{0,1}n Prr{0,1}
p(n)[M’(x,r)L(x)] < 1/(3p(n))
Proof:
• M’ return the majority ofm2 independent runs of ML;m = #random bits M uses -Apply Chernoff bound 7
Amplification
A function of the number of random bitsOne can get stronger amplification – this suffices here
Maybe
• BPPNP
Theorem [Sipser,Lautemann]:
• BPP2
Proof:
• InsightLBPP poly-time probabilistic TM M, s.t. n and x{0,1}n: xLs1,…,sm{0,1}mr{0,1}m1imM(x,rsi)(where m=p(n))
8
BPP in PH
Does this suffice?
Not known!
9
Yes-instance
{0, 1}m
10
No-instance
{0, 1}m
Assume
• M uses m random bits and errs w.p. <1/3m
Utilize
• The Probabilistic Method:Pra[a has property P] > 0 a with property P
Completeness:
• Probability that s1,…,sm{0,1}m dissatisfyr{0,1}m 1imM(x,rsi) small
Soundness:
• Union Bound11
Proof
m1 m R
mm
is ,...,s {0,1}i 1
Pr r 0,1 , M x,r s 0
12
Probability Random si’s is Bad
union-bound m
1 m Rm
m
is ,...,s {0,1}i 1r {0,1}
Pr M x,r s 0
m1 m Rm
m
is ,...,s {0,1}i 1r {0,1}
Pr M(x,r s ) 0
si’s independent
mR
mm
s {0,1}i 1
2 Pr M x,s 0
r:s random rs random
mm 1
2 13m
xL
mR
m
ir {0,1}i 1
Pr M x,r s 1
13
For xL
union-bound m
m
ir {0,1}i 1
Pr M x,r s 1
1
m 13m
xL
It follows that:
• LBPP there’s a poly. prob. TM M, s.t for any x there is m=poly(|x|) s.txL s1,…,sm
r 1imM(x,rsi)=1
Hence
• L2 BPP2
14
Q.E.D!
•the polynomial-time hierarchy •Saw NP PH PSPACE•NP=coNP PH=NP (“the hierarchy collapses”)
PH
•probabilistic TMs•Defined the complexity class BPP•How to amplify randomized computations•We proved P BPP 2
BPP
15
WWindex
16
Polynomial Time Hierarchy
BPP TQBF
SAT Probablistic Turing Machine