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Quantum Information Theory as a Proof Technique Fernando G.S.L. Brandão ETH Zürich With B. Barak (MSR), M. Christandl (ETH), A. Harrow (MIT), J. Kelner (MIT), D. Steurer (Cornell), J. Yard (Station Q), Y. Zhou (CMU) Caltech, February 2013

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Simulating quantum is hard More than 25% of DoE supercomputer power is devoted to simulating quantum physics Can we get a better handle on this simulation problem?

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Simulating quantum is hard, secrets are hard to conceal More than 25% of DoE supercomputer power is devoted to simulating quantum physics Can we get a better handle on this simulation problem? All current cryptography is based on unproven hardness assumptions Can we have better security guarantees for our secrets?

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Quantum Information Science… … gives a path for solving both problems. But it’s a long journey QIS is at the crossover of computer science, mathematics and physics Physics CS Math

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The Two Holy Grails of QIS Quantum Computation: Use of well-controlled quantum systems for performing computation Exponential speed-ups over classical computing E.g. Factoring (RSA) Simulating quantum systems Quantum Cryptography: Use of well-controlled quantum systems for secret key distribution Unconditional security based solely on the correctness of quantum mechanics

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The Two Holy Grails of QIS Quantum Computation: Use of well controlled quantum systems for performing computations. Exponential speed-ups over classical computing Quantum Cryptography: Use of well-controlled quantum systems for secret key distribution Unconditional security based solely on the correctness of quantum mechanics State-of-the-art: 5 qubits computer Can prove with high probability that 15 = 3 x 5

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The Two Holy Grails of QIS Quantum Computation: Use of well controlled quantum systems for performing computations. Exponential speed-ups over classical computing Quantum Cryptography: Use of well controlled quantum systems for secret key distribution Unconditional security based solely on the correctness of quantum mechanics State-of-the-art: 5 qubits computer Can prove with high probability that 15 = 3 x 5 State-of-the-art: 100 km Still many technological challenges

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What If… …one can never build a quantum computer? Answer 1: Then we ought to know why: new physical principle that makes quantum computers impossible? Answer 2: QIS is interesting and useful independent of building a quantum computer

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What If… …one can never build a quantum computer? Answer 1: Then we ought to know why: new physical principle that makes quantum computers impossible? Answer 2: QIS is interesting and useful independent of building a quantum computer This talk

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Outline Sum-Of-Squares Hierarchy and Entanglement Mean-Field and the Quantum PCP Conjecture Conclusions

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Outline Sum-Of-Squares Hierarchy and Entanglement Mean-Field and the Quantum PCP Conjecture Conclusions

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Problem 1: For M in H(C d ) (d x d matrix) compute Very Easy! Problem 2: For M in H(C d C l ), compute Quadratic vs Biquadratic Optimization Next: Best known algorithm (and best hardness result) using ideas from Quantum Information Theory

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Problem 1: For M in H(C d ) (d x d matrix) compute Very Easy! Problem 2: For M in H(C d C l ), compute Quadratic vs Biquadratic Optimization Next: Best known algorithm (and best hardness result) using ideas from Quantum Information Theory

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Quantum Mechanics Pure State: norm-one vector in C d : Mixed State: positive semidefinite matrix of unit trace: Quantum Measurement: To any experiment with d outcomes we associate d PSD matrices {M k } such that Σ k M k =I Born’s rule: Dirac notation reminder:

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Quantum Entanglement Pure States: If, it’s separable otherwise, it’s entangled. Mixed States: If, it’s separable otherwise, it’s entangled.

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A Physical Definition of Entanglement LOCC: Local quantum Operations and Classical Communication Separable states can be created by LOCC: Entangled states cannot be created by LOCC: non-classical correlations

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The Separability Problem Given is it entangled? (Weak Membership: W SEP (ε, ||*||)) Given ρ AB determine if it is separable, or ε-away from SEP SEP D ε

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The Separability Problem Given is it entangled? (Weak Membership: W SEP (ε, ||*||)) Given ρ AB determine if it is separable, or ε-away from SEP Dual Problem: Optimization over separable states

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The Separability Problem Given is it entangled? (Weak Membership: W SEP (ε, ||*||)) Given ρ AB determine if it is separable, or ε-away from SEP Dual Problem: Optimization over separable states Relevance: Entanglement is a resource in quantum cryptography, quantum communication, etc…

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Norms on Quantum States EDIT How to quantify the distance in Weak-Membership? 1. Euclidean Norm (Hilbert-Schmidt): ||X|| 2 = tr(X T X) 1/2 2. Trace Norm: ||X|| 1 = tr((X T X) 1/2 ) ||ρ – σ|| 1 = 2 max 0

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Norms on Quantum States EDIT How to quantify the distance in Weak-Membership? 1. Euclidean Norm (Hilbert-Schmidt): ||X|| 2 = tr(X T X) 1/2 2. Trace Norm: ||X|| 1 = tr((X T X) 1/2 ) ||ρ – σ|| 1 = 2 max 0

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Norms on Quantum States EDIT How to quantify the distance in Weak-Membership? 1. Euclidean Norm (Hilbert-Schmidt): ||X|| 2 = tr(X T X) 1/2 2. Trace Norm: ||X|| 1 = tr((X T X) 1/2 ) ||ρ – σ|| 1 = 2 max 0

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Previous Work When is ρ AB entangled? - Decide if ρ AB is separable or ε-away from separable Beautiful theory behind it (PPT, entanglement witnesses, etc) Horribly expensive algorithms State-of-the-art: 2 O(|A|log|B|) time complexity for either ||*|| 2 or ||*|| 1 Same for estimating h SEP (no better than exaustive search!)

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Hardness Results When is ρ AB entangled? - Decide if ρ AB is separable or ε-away from separable (Gurvits ’02, Gharibian ‘08) NP-hard with ε=1/poly(|A||B|) for ||*|| 1 or ||*|| 2 (Harrow, Montanaro ‘10) No exp(O(log 1-ν |A|log 1-μ |B|)) time algorithm with ε=Ω(1) and any ν+μ>0 for ||*|| 1, unless ETH fails ETH (Exponential Time Hypothesis): SAT cannot be solved in 2 o(n) time (Impagliazzo&Paruti ’99)

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Quasipolynomial-time Algorithm (B., Christandl, Yard ‘11) There is a exp(O(ε -2 log|A|log|B|)) time algorithm for W SEP (||*||, ε) (in ||*|| 2 or ||*|| 1-LOCC ) 2 norm natural from geometrical point of view 1-LOCC norm natural from operational point of view (distant lab paradigm)

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Quasipolynomial-time Algorithm (B., Christandl, Yard ‘11) There is a exp(O(ε -2 log|A|log|B|)) time algorithm for W SEP (||*||, ε) (in ||*|| 2 or ||*|| 1-LOCC ) Corollary 1: Solving W SEP (||*|| 2, ε) is not NP-hard for ε = 1/polylog(|A||B|), unless ETH fails Contrast with: (Gurvits ’02, Gharibian ‘08) Solving W SEP (||*|| 2, ε) NP-hard for ε = 1/poly(|A||B|)

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Quasipolynomial-time Algorithm (B., Christandl, Yard ‘11) There is a exp(O(ε -2 log|A|log|B|)) time algorithm for W SEP (||*||, ε) (in ||*|| 2 or ||*|| 1-LOCC ) Corollary 2: For M in 1-LOCC, can compute h SEP (M) within additive error ε in time exp(O(ε -2 log|A|log|B|)) Contrast with: (Harrow, Montanaro ’10) No exp(O(log 1-ν |A|log 1-μ |B|)) algorithm for h SEP (M) with ε=Ω(1), for separable M

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Algorithm: SoS Hierarchy Polynomial optimization over hypersphere Sum-Of-Squares (Parrilo/Lasserre) hierarchy: gives sequence of SDPs that approximate h SEP (M) - Round k takes time dim(M) O(k) -Converge to h SEP (M) when k -> ∞ SoS is the strongest SDP hierarchy known for polynomial optimization (connections with SoS proof system, real algebraic geometric, Hilbert’s 17 th problem, …) We’ll derive SoS hierarchy by a quantum argument

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Algorithm: SoS Hierarchy Polynomial optimization over hypersphere Sum-Of-Squares (Parrilo/Lasserre) hierarchy: gives sequence of SDPs that approximate h SEP (M) - Round k SDP has size dim(M) O(k) -Converge to h SEP (M) when k -> ∞

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Algorithm: SoS Hierarchy Polynomial optimization over hypersphere Sum-Of-Squares (Parrilo/Lasserre) hierarchy: gives sequence of SDPs that approximate h SEP (M) - Round k SDP has size dim(M) O(k) -Converge to h SEP (M) when k -> ∞ SoS is the strongest SDP hierarchy known for polynomial optimization (connections with SoS proof system, real algebraic geometric, Hilbert’s 17 th problem, …) We’ll derive SoS hierarchy by a quantum argument

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Classical Correlations are Shareable Given separable state Consider the symmetric extension Def. ρ AB is k-extendible if there is ρ AB1…Bk s.t for all j in [k], tr \ Bj (ρ AB1…Bk ) = ρ AB A B1B1 B2B2 B3B3 B4B4 BkBk …

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Entanglement is Monogamous (Stormer ’69, Hudson & Moody ’76, Raggio & Werner ’89) ρ AB separable iff ρ AB is k-extendible for all k

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SoS as optimization over k-extensions (Doherty, Parrilo, Spedalieri ‘01) k-level SoS SDP for h SEP (M) is equivalent to optimization over k-extendible states (plus PPT (positive partial transpose) test) : (Stormer ’69, Hudson & Moody ’76, Raggio & Werner ’89) give alternative proof that hierarchy converges (Barak, B., Harrow, Kelner, Steurer, Zhou ‘12) gives a proof of equivalence

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SoS as optimization over k-extensions (Doherty, Parrilo, Spedalieri ‘01) k-level SoS SDP for h SEP (M) is equivalent to optimization over k-extendible states (plus PPT (positive partial transpose) test) : (Stormer ’69, Hudson & Moody ’76, Raggio & Werner ’89) give alternative proof that hierarchy converges (before the hierarchy was even defined :-) (Barak, B., Harrow, Kelner, Steurer, Zhou ‘12) gives a proof of equivalence

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How close to separable are k-extendible states? (Christandl, Koenig, Mitschison, Renner ‘05) De Finetti Bound If ρ AB is k-extendible But there are k-extendible states ρ AB s.t. Improved de Finetti Bound If ρ AB is k-extendible: for 1-LOCC or 2 norm k=2ln(2)ε -2 log|A| rounds of SoS solves the problem with a SDP of size |A||B| k = exp(O(ε -2 log|A| log|B|))

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How close to separable are k-extendible states? (Christandl, Koenig, Mitschison, Renner ‘05) De Finetti Bound If ρ AB is k-extendible But there are k-extendible states ρ AB s.t. Improved de Finetti Bound (B, Christandl, Yard ‘11) If ρ AB is k-extendible: for 1-LOCC or 2 norm

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How close to separable are k-extendible states? Improved de Finetti Bound (B, Christandl, Yard ’11) If ρ AB is k-extendible: for 1-LOCC or 2 norm k=2ln(2)ε -2 log|A| rounds of SoS solves W SEP (ε) with a SDP of size |A||B| k = exp(O(ε -2 log|A| log|B|)) SEP D ε

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Proving… Improved de Finetti Bound (B, Christandl, Yard ’11) If ρ AB is k-extendible: for 1-LOCC or 2 norm Proof is information-theoretic Mutual Information: I(A:B) ρ := H(A) + H(B) – H(AB) H(A) ρ := -tr(ρ log(ρ))

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Proving… Proof is information-theoretic Mutual Information: I(A:B) ρ := H(A) + H(B) – H(AB) H(A) ρ := -tr(ρ log(ρ)) Let ρ AB1…Bk be k-extension of ρ AB 2log|A| > I(A:B 1 …B k ) = I(A:B 1 )+I(A:B 2 |B 1 )+…+I(A:B k |B 1 …B k-1 ) For some l

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Proving… Proof is information-theoretic Mutual Information: I(A:B) ρ := H(A) + H(B) – H(AB) H(A) ρ := -tr(ρ log(ρ)) Let ρ AB1…Bk be k-extension of ρ AB 2log|A| > I(A:B 1 …B k ) = I(A:B 1 )+I(A:B 2 |B 1 )+…+I(A:B k |B 1 …B k-1 ) For some l

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Quantum Information? Nature isn't classical, dammit, and if you want to make a simulation of Nature, you'd better make it quantum mechanical, and by golly it's a wonderful problem, because it doesn't look so easy.

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Quantum Information? Nature isn't classical, dammit, and if you want to make a simulation of Nature, you'd better make it quantum mechanical, and by golly it's a wonderful problem, because it doesn't look so easy. Bad news Only definition I(A:B|C)=H(AC)+H(BC)-H(ABC)-H(C) Can’t condition on quantum information. I(A:B|C) ρ ≈ 0 doesn’t imply ρ is approximately separable in 1-norm (Ibinson, Linden, Winter ’08) Good news I(A:B|C) still defined Chain rule, etc. still hold I(A:B|C) ρ =0 implies ρ is separable (Hayden, Jozsa, Petz, Winter‘03) information theory

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Chain rule: 2log|A| > I(A:B 1 …B k ) = I(A:B 1 )+I(A:B 2 |B 1 )+…+I(A:B k |B 1 …B k-1 ) Then Proving the Bound Thm (B, Christandl, Yard ‘11) For ||*|| 1-LOCC or ||*|| 2

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Conditional Mutual Information Bound Coding Theory Strong subadditivity of von Neumann entropy as state redistribution rate (Devetak, Yard ‘06) Large Deviation Theory Hypothesis testing for entanglement (B., Plenio ‘08) ( )

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h SEP equivalent to 1. Injective norm of 3-index tensors 2. Minimum output entropy quantum channel 3. Optimal acceptance probability in QMA(2) 4. 2->4 norm of projectors:

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Unique Games Conjecture (Unique Games Conjecture, Khot ‘02) For every ε>0 it’s NP-hard to tell for a system of equations x i + x j = c mod k YES) More than 1-ε fraction constraints satisfiable NO) Less than ε fraction satisfiable

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Unique Games Conjecture (Unique Games Conjecture, Khot ‘02) For every ε>0 it’s NP-hard to tell for a system of equations x i + x j = c mod k YES) More than 1-ε fraction constraints satisfiable NO) Less than ε fraction satisfiable (Raghavedra ‘08) UGC implies 2-level SoS gives the best approximation algorithm for all Constraints Satisfaction Problems (max-cut, vertex cover, …) Major barrier in current knowledge of algorithms for combinatorial problems (Arora, Barak, Steurer ‘10) exp(n O(ε) ) time algorithm for UG

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Small Set Expansion Conjecture (Small Set Expansion Conjecture, Raghavendra, Steurer ‘10) For every ε, δ>0 it’s NP-hard to tell for a graph G = (V, E) whether YES) Φ(M) < ε for a region M of size ≈ δ|V|, NO) Φ(M) > 1-ε for all regions M of size ≈ δ|V|, Expansion: M V

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Small Set Expansion Conjecture (Raghavendra, Steurer ‘10) Small Set Expansion ≈ Unique Games (Barak, B, Harrow, Kelner, Steurer, Zhou ‘12) Rough estimate 2->4 norm of projector onto top eigenspace of graphs ≈ Small Set Expansion Expansion: M V (Small Set Expansion Conjecture, Raghavendra, Steurer ‘10) For every ε, δ>0 it’s NP-hard to tell for a graph G = (V, E) whether YES) Φ(M) < ε for a region M of size ≈ δ|V|, NO) Φ(M) > 1-ε for all regions M of size ≈ δ|V|,

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Quantum Bound on SoS Implies 1. For n x n matrix A can compute with O(log(n)ε -3 ) rounds of SoS a number x s.t. 2. n O(ε) -level SoS solves Small Set Expansion Alternative algorithm to (Arora, Barak, Steurer ’10) 3. Improvement in bound (additive -> multiplicative error) would solve SSE in exp(O(log 2 (n))) time 4. Other quantum arguments show cannot compute rough approximation of ||P|| 2->4 in less than exp(O(log 2 (n))) time under ETH 5. Improvement (hardness specific P) would imply exp(O(log 2 (n))) time lower bound to Unique Games under ETH (Barak, B., Harrow, Kelner, Steurer, Zhou ‘12)

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Quantum Bound on SoS Implies 1. For n x n matrix A can compute with O(log(n)ε -3 ) rounds of SoS a number x s.t. 2. n O(ε) -level SoS solves Small Set Expansion Alternative algorithm to (Arora, Barak, Steurer ’10) 3. Improvement in bound (additive -> multiplicative error) would solve SSE in exp(O(log 2 (n))) time 4. Other quantum arguments show cannot compute rough approximation of ||P|| 2->4 in less than exp(O(log 2 (n))) time under ETH 5. Improvement (hardness specific P) would imply exp(O(log 2 (n))) time lower bound to Unique Games under ETH (Barak, B., Harrow, Kelner, Steurer, Zhou ‘12)

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Quantum Bound on SoS Implies 1. For n x n matrix A can compute with O(log(n)ε -3 ) rounds of SoS a number x s.t. 2. n O(ε) -level SoS solves Small Set Expansion Alternative algorithm to (Arora, Barak, Steurer ’10) 3. Improvement in bound (additive -> multiplicative error) would solve SSE in exp(O(log 2 (n))) time 4. Other quantum arguments show cannot compute rough approximation of ||P|| 2->4 in less than exp(O(log 2 (n))) time under ETH 5. Improvement (hardness specific P) would imply exp(O(log 2 (n))) time lower bound to Unique Games under ETH (Barak, B., Harrow, Kelner, Steurer, Zhou ‘12)

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Quantum Bound on SoS Implies 1. For n x n matrix A can compute with O(log(n)ε -3 ) rounds of SoS a number x s.t. 2. n O(ε) -level SoS solves Small Set Expansion Alternative algorithm to (Arora, Barak, Steurer ’10) 3. Improvement in bound (additive -> multiplicative error) would solve SSE in exp(O(log 2 (n))) time 4. Other quantum arguments show one cannot compute rough approximation of ||P|| 2->4 in less than exp(O(log 2 (n))) time (under ETH) 5. Improvement (hardness for P from graphs) would imply exp(O(log 2 (n))) time lower bound to Unique Games ( under ETH) (Barak, B., Harrow, Kelner, Steurer, Zhou ‘12)

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Quantum Bound on SoS Implies 1. For n x n matrix A can compute with O(log(n)ε -3 ) rounds of SoS a number x s.t. 2. n O(ε) -level SoS solves Small Set Expansion Alternative algorithm to (Arora, Barak, Steurer ’10) 3. Improvement in bound (additive -> multiplicative error) would solve SSE in exp(O(log 2 (n))) time 4. Other quantum arguments show one cannot compute rough approximation of ||P|| 2->4 in less than exp(O(log 2 (n))) time (under ETH) 5. Improvement (hardness for P from graphs) would imply exp(O(log 2 (n))) time lower bound on Unique Games ( under ETH) (Barak, B., Harrow, Kelner, Steurer, Zhou ‘12)

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Quantum Bound on SoS Implies 1. For n x n matrix A can compute with O(log(n)ε -3 ) rounds of SoS a number x s.t. 2. n O(ε) -level SoS solves Small Set Expansion Alternative algorithm to (Arora, Barak, Steurer ’10) 3. Improvement in bound (additive -> multiplicative error) would solve SSE in exp(O(log 2 (n))) time 4. Other quantum arguments show one cannot compute rough approximation of ||P|| 2->4 in less than exp(O(log 2 (n))) time (under ETH) 5. Improvement (hardness for P from graphs) would imply exp(O(log 2 (n))) time lower bound on Unique Games ( under ETH) (Barak, B., Harrow, Kelner, Steurer, Zhou ‘12) Both improvements can be casted as open problems in quantum information theory Maybe to solve UGC we should learn more about QIT?

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Outline Sum-Of-Squares Hierarchy and Entanglement Mean-Field and the Quantum PCP Conjecture Conclusions

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Quantum Mechanics, again Dynamics in quantum mechanics is given by a Hamiltonian H: Equilibrium properties are also determined by H Thermal state: Groundstate:

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Constraint Satisfaction Problems vs Local Hamiltonians k-arity CSP: Variables {x 1, …, x n }, alphabet Σ Constraints: Assignment: Unsat :=

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Constraint Satisfaction Problems vs Local Hamiltonians k-arity CSP: Variables {x 1, …, x n }, alphabet Σ Constraints: Assignment: Unsat := k-local Hamiltonian H: n qudits in Constraints: qUnsat := E 0 : min eigenvalue H1H1 qudit

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C. vs Q. Optimal Assignments Finding optimal assignment of CSPs can be hard

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C. vs Q. Optimal Assignments Finding optimal assignment of CSPs can be hard Finding optimal assignment of quantum CSPs can be even harder (BCS Hamiltonian groundstate, Laughlin states for FQHE,…) Main difference: Optimal Assignment can be a highly entangled state (unit vector in )

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Mean-Field… …consists in approximating groundstate by a product state is a CSP Successful heuristic in Quantum Chemistry Condensed matter Folklore: Mean-Field good when Many-particle interactions Low entanglement in state

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Mean-Field… …consists in approximating groundstate by a product state is a CSP Successful heuristic in Quantum Chemistry Condensed matter Folklore: Mean-Field good when Many-particle interactions Low entanglement in state Can we make folklore more rigorous? Can we put limitations on use of mean-field and related schemes?

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The Local Hamiltonian Problem and Quantum Complexity Theory Problem Given a local Hamiltonian H, decide if E 0 (H)=0 or E 0 (H)>Δ E 0 (H) : minimum eigenvalue of H

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The Local Hamiltonian Problem and Quantum Complexity Theory Problem Given a local Hamiltonian H, decide if E 0 (H)=0 or E 0 (H)>Δ E 0 (H) : minimum eigenvalue of H Thm (Kitaev ‘99) The local Hamiltonian problem is QMA- complete for Δ = 1/poly(n) (analogue Cook-Levin thm) QMA is the quantum analogue of NP, where the proof and the computation are quantum Input Witness U1U1U1U1 …. U5U5U5U5 U4U4U4U4 U3U3U3U3 U2U2U2U2

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The meaning of it It’s believed QMA ≠ NP Thus there is generally no efficient classical description of groundstates of local Hamiltonians What’s the role of the promise gap Δ on the hardness? …. But first, what happens for CSP?

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PCP Theorem PCP Theorem (Arora et al ’98, Dinur ‘07) : There is a ε > 0 s.t. it’s NP-complete to determine whether for a CSP with m constraints, Unsat = 0 or Unsat > εm -NP-hard even for Δ=Ω(m) -Equivalent to the existence of Probabilistically Checkable Proofs for NP. -Central tool in the theory of hardness of approximation (optimal threshold for 3-SAT (7/8-factor), max-clique (n 1-ε -factor)) (obs: Unique Game Conjecture is about the existence of strong form of PCP)

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PCP Theorem PCP Theorem (Arora et al ’98, Dinur ‘07) : There is a ε > 0 s.t. it’s NP-complete to determine whether for a CSP with m constraints, Unsat = 0 or Unsat > εm -NP-hard even for Δ=Ω(m) -Equivalent to the existence of Probabilistically Checkable Proofs for NP. -Central tool in the theory of hardness of approximation (optimal threshold for 3-SAT (7/8-factor), max-clique (n 1-ε -factor)) (obs: Unique Game Conjecture is about the existence of strong form of PCP)

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PCP Theorem PCP Theorem (Arora et al ’98, Dinur ‘07) : There is a ε > 0 s.t. it’s NP-complete to determine whether for a CSP with m constraints, Unsat = 0 or Unsat > εm -NP-hard even for Δ=Ω(m) -Equivalent to the existence of Probabilistically Checkable Proofs for NP. -Central tool in the theory of hardness of approximation (optimal threshold for 3-SAT (7/8-factor), max-clique (n 1-ε -factor)) (obs: Unique Game Conjecture is about the existence of strong form of PCP)

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Quantum PCP? The qPCP conjecture: There is ε > 0 s.t. the following problem is QMA-complete: Given 2-local Hamiltonian H with m local terms determine whether (i) E 0 (H)=0 or (ii) E 0 (H) > εm. -(Bravyi, DiVincenzo, Loss, Terhal ‘08) Equivalent to conjecture for O(1)-local Hamiltonians over qdits. -Equivalent to estimating mean groundenergy to constant accuracy (e o (H) := E 0 (H)/m) - And to estimate the energy at constant temperature - At least NP-hard (by PCP Thm) and in QMA

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Quantum PCP? The qPCP conjecture: There is ε > 0 s.t. the following problem is QMA-complete: Given 2-local Hamiltonian H with m local terms determine whether (i) E 0 (H)=0 or (ii) E 0 (H) > εm. -(Bravyi, DiVincenzo, Loss, Terhal ‘08) Equivalent to conjecture for O(1)-local Hamiltonians over qdits. -Equivalent to estimating mean groundenergy to constant accuracy (e o (H) := E 0 (H)/m) - And to estimate the energy at constant temperature - At least NP-hard (by PCP Thm) and in QMA

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Quantum PCP? The qPCP conjecture: There is ε > 0 s.t. the following problem is QMA-complete: Given 2-local Hamiltonian H with m local terms determine whether (i) E 0 (H)=0 or (ii) E 0 (H) > εm. -(Bravyi, DiVincenzo, Loss, Terhal ‘08) Equivalent to conjecture for O(1)-local Hamiltonians over qdits. -Equivalent to estimating mean groundenergy to constant accuracy (e o (H) := E 0 (H)/m) - And to estimate the energy at constant temperature - At least NP-hard (by PCP Thm) and in QMA

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Quantum PCP? The qPCP conjecture: There is ε > 0 s.t. the following problem is QMA-complete: Given 2-local Hamiltonian H with m local terms determine whether (i) E 0 (H)=0 or (ii) E 0 (H) > εm. -(Bravyi, DiVincenzo, Loss, Terhal ‘08) Equivalent to conjecture for O(1)-local Hamiltonians over qdits. -Equivalent to estimating mean groundenergy to constant accuracy (e o (H) := E 0 (H)/m) - And to estimate the energy at constant temperature - At least NP-hard (by PCP Thm) and in QMA

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Quantum PCP? NP QMA qPCP ? ?

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Previous Work and Obstructions (Aharonov, Arad, Landau, Vazirani ‘08) Quantum version of 1 of 3 parts of Dinur’s proof of the PCP thm (gap amplification) But: The other two parts (alphabet and degree reductions) involve massive copying of information; not clear how to do it with a highly entangled assignment

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Previous Work and Obstructions (Aharonov, Arad, Landau, Vazirani ‘08) Quantum version of 1 of 3 parts of Dinur’s proof of the PCP thm (gap amplification) But: The other two parts (alphabet and degree reductions) involve massive copying of information; not clear how to do it with a highly entangled assignment (Bravyi, Vyalyi ’03; Arad ’10; Hastings ’12; Freedman, Hastings ’13; Aharonov, Eldar ’13, …) No-go for large class of commuting Hamiltonians and almost commuting Hamiltonians But: Commuting case might always be in NP

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Approximation in NP (B., Harrow ‘12) Let H be a 2-local Hamiltonian on qudits with interaction graph G(V, E) and |E| local terms.

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Approximation in NP (B., Harrow ‘12) Let H be a 2-local Hamiltonian on qudits with interaction graph G(V, E) and |E| local terms. Let {X i } be a partition of the sites with each X i having m sites. X1X1 X3X3 X2X2 m < O(log(n))

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Approximation in NP (B., Harrow ‘12) Let H be a 2-local Hamiltonian on qudits with interaction graph G(V, E) and |E| local terms. Let {X i } be a partition of the sites with each X i having m sites. Then there are products states ψ i in X i s.t. E i : expectation over X i deg(G) : degree of G Φ(X i ) : expansion of X i S(X i ) : entropy of groundstate in X i X1X1 X3X3 X2X2 m < O(log(n))

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Approximation in NP (B., Harrow ‘12) Let H be a 2-local Hamiltonian on qudits with interaction graph G(V, E) and |E| local terms. Let {X i } be a partition of the sites with each X i having m sites. Then there are products states ψ i in X i s.t. E i : expectation over X i deg(G) : degree of G Φ(X i ) : expansion of X i S(X i ) : entropy of groundstate in X i X1X1 X3X3 X2X2 Approximation in terms of 3 parameters : 1. Average expansion 2. Degree interaction graph 3. Average entanglement groundstate

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Approximation in terms of degree No classical analogue: (PCP + parallel repetition) For all α, β, γ > 0 it’s NP-complete to determine whether a CSP C is s.t. Unsat = 0 or Unsat > α Σ β /deg(G) γ Parallel repetition: C -> C’ i. deg(G’) = deg(G) k ii. Σ’ = Σ k ii. Unsat(G’) > Unsat(G) (Raz ‘00) even showed Unsat(G’) approaches 1 exponentially fast

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Approximation in terms of degree No classical analogue: (PCP + parallel repetition) For all α, β, γ > 0 it’s NP-complete to determine whether a CSP C is s.t. Unsat = 0 or Unsat > α Σ β /deg(G) γ Contrast: It’s in NP determine whether a Hamiltonian H is s.t E 0 (H)=0 or E 0 (H) > αd 3/4 /deg(G) 1/8 Quantum generalizations of PCP and parallel repetition cannot both be true (assuming QMA not in NP)

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Approximation in terms of degree No classical analogue: (PCP + parallel repetition) For all α, β, γ > 0 it’s NP-complete to determine whether a CSP C is s.t. Unsat = 0 or Unsat > α Σ β /deg(G) γ Bound: Φ G < ½ - Ω(1/deg) implies Highly expanding graphs (Φ G -> 1/2) are not hard instances

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Approximation in terms of degree 1-D 2-D 3-D ∞-D …shows mean field becomes exact in high dim Rigorous justification to folklore in condensed matter physics

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Approximation in terms of average entanglement The problem is in NP if entanglement of groundstate satisfies a subvolume law: Connection of amount of entanglement in groundstate and computational complexity of the model X1X1 X3X3 X2X2 m < O(log(n))

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New Classical Algorithms for Quantum Hamiltonians Following same approach we also obtain polynomial time algorithms for approximating the groundstate energy of 1.Planar Hamiltonians, improving on (Bansal, Bravyi, Terhal ‘07) 2.Dense Hamiltonians, improving on (Gharibian, Kempe ‘10) 3.Hamiltonians on graphs with low threshold rank, building on (Barak, Raghavendra, Steurer ‘10) In all cases we prove that a product state does a good job and use efficient algorithms for CSPs.

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Proof Idea: Monogamy of Entanglement Cannot be highly entangled with too many neighbors Entropy quantifies how entangled can be Proof uses information-theoretic techniques (chain rule of conditional mutual information, informationally complete POVMs, etc) to make this intuition precise Inspired by classical information-theoretic ideas for bounding convergence of SoS hierarchy for CSPs (Tan, Raghavendra ‘10, Barak, Raghavendra, Steurer ‘10)

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Quantum Information Method Condensed Matter Physics: Tensor Network States (Cirac, Hastings, Verstraete, Vidal, …) Mathematical Physics: Area Law from Exponential Decay of Correlations (B., Horodecki ‘12) Computational Complexity: Lower bounds on LP extensions for Travel Salesman Problem (Fiorini et al ‘11) Compressed Sensing : Better low rank matrix recovery methods (Gross et al ‘10) Etc, see (Drucker, de Wolf ‘09) for more

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Conclusions QIT useful to bound SoS hierarchy - Quasi-polynomial algorithm for deciding entanglement - Connections 2->4 norm, Small Set Expansion - New approach to resolve UGC (improve quantum SoS bound and/or quantum hardness) QIT useful to bound efficiency of mean-field theory - Cornering quantum PCP - Poly-time algorithms for planar and dense Hamiltonians

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Thank you!

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