Continuous groups of transversal gates for quantum error correcting codes from finite clock reference frames
Mischa P. Woods1 and Alvaro´ M. Alhambra2
1Institute for Theoretical Physics, ETH Zurich, Switzerland 2Perimeter Institute for Theoretical Physics, Waterloo, Canada
Following the introduction of the task of ref- ply logical gates transversally, which one can imple- erence frame error correction [1], we show ment while still being able to correct for local errors. how, by using reference frame alignment with The framework for error correction is based on con- clocks, one can add a continuous Abelian sidering three spaces — a logical HL, physical HP 1 group of transversal logical gates to any error- and a code HCo ⊆ HP space. Logical states ρL correcting code. With this we further explore containing quantum information are encoded via an a way of circumventing the no-go theorem of encoding map E : B(HL) → B(HCo) onto the code Eastin and Knill, which states that if local er- space, which is a subspace of some larger physical rors are correctable, the group of transversal space where errors — represented via error maps gates must be of finite order. We are able to {Ej}j : B(HCo) → B(HP) — can occur. Decoding do this by introducing a small error on the de- maps {Dj}j : B(HP) → B(HL) can then retrieve the coding procedure that decreases with the di- information while correcting for errors; outputting the mension of the frames used. Furthermore, we logical state ρL. That is: show that there is a direct relationship be- tween how small this error can be and how ρL E Ej Dj ρL, (1) accurate quantum clocks can be: the more ac- for all j and for all states ρ ∈ S (H ). Depending curate the clock, the smaller the error; and the L L on the error model, the index j indicating which error no-go theorem would be violated if time could occurred may or may not be known. If it is unknown, be measured perfectly in quantum mechanics. the decoding map D cannot depend on j. We say The asymptotic scaling of the error is stud- j that a logical gate V can be applied transversally if ied under a number of scenarios of reference L for any state ρ, the encoder E is such that frames and error models. The scheme is also † ⊗K †⊗K extended to errors at unknown locations, and E(VLρVL ) = VCo E(ρ)VCo , (2) we show how to achieve this by simple major- ity voting related error correction schemes on where the tensor product structure “⊗K” represents the reference frames. In the Outlook, we dis- the division of the code into different subsystems or cuss our results in relation to the AdS/CFT “blocks” in which errors can be independently cor- correspondence and the Page-Wooters mecha- rected. This condition means that the action of the nism. encoding map commutes with the action of the logical ⊗K gate VL, which is represented by VCo in the physi- cal space. An interesting case to consider is that of codes E and groups G for which all group elements 1 Introduction and Overview of Re- (indexed by g) can be applied transversally using a sults unitary group representation UL(g),
† ⊗K †⊗K E(UL(g)ρUL(g) ) = UCo(g) E(ρ)UCo(g) ∀g ∈ G. arXiv:1902.07725v4 [quant-ph] 19 Mar 2020 In order to build a functional universal quantum com- (3) puter, full fault-tolerance must be achieved. The idea We will refer to codes whose encoding has this prop- behind fault-tolerance is that the errors that occur erty as covariant codes. There are a number of results at particular points during the computation do not that restrict the existence of such codes, in particu- propagate or amplify along the whole computation to lar for stabilizer codes [2–6]. Most notably, the no-go the point of being uncorrectable. Due to fundamental theorem of Eastin and Knill [7] states that in any physical constraints such as no-cloning, achieving this finite-dimensional code (not necessarily stabilizer) in is a notoriously challenging task, with a number of dif- which local errors can be corrected, the groups of log- ferent requirements on how to prepare, manipulate, ical gates that can be applied transversally must be and protect the quantum states with error-correcting codes. One of the most desirable features of the codes 1Some authors use the convention of not considering the used in fault-tolerant computation is the ability to ap- code space explicitly, in which case one sets HCo = HP.
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 1 finite. This thus excludes dense sets of logical gates, cannot exist as they require infinite energy.2 These as well as any continuous Lie subgroup of U(d). are known as Idealised clocks. However, this does not Since this no-go result imposes a fundamental limi- rule out the existence of approximate time operators tˆ tation on the possible transversal gates, it is interest- and initial clock states |ψi which serve as a reference ing to find ways of circumventing it, via schemes that frame for the observable t,[19–21] either in the form do not satisfy all of the assumptions. A number of of a stopwatch [22] or ticking clock [23–25] alternatives have been thoroughly explored, includ- Here we explore how certain finite-sized reference ing the protocols of magic state distillation [8], and frames (which we call “clocks”) can be used to build other more specific schemes (see for instance [9–14]), imperfect covariant codes, and we give upper bounds many of which propose a relaxation of the transver- to the errors induced by their finite size. We use the sality condition in some fault-tolerant way. construction of Quasi-Ideal clocks [21] and Salecker- Recently, a new kind of circumvention was put for- Wigner-Peres (SWP) clocks [19, 20], to provide sim- ward in [1], where they show examples of codes with ple encoding and decoding protocols based on the task physical spaces of infinite dimension that allow for of reference frame alignment. We show using Quasi- the transversal implementation of Lie groups. The Ideal clock states entangled over L subsystems, that need for infinite dimensions (and seemingly infinite the worst-case entanglement fidelity between the in- energy too, as we will soon discuss) limits their prac- put ρL and decoded output Dj(Ej (Ecov(ρL))) denoted tical relevance, but the idea motivates the following fworst, and defined in Section 2.2, in our protocol sat- question: do there exist large (but finite) covariant isfies (up to log factors) the lower bound 1 − fworst ≤ 2 codes in which approximate error correction can be O(1/(LdC) ) where L is the number of entangled performed? In other words, can we circumvent the Quasi-Ideal clocks and dC is their dimension. In [26] 2 no-go results by allowing for small errors that decrease the generic upper bound 1 − fworst ≥ O(1/(LdC) ) is with the size of the code? derived for all covariant encoding maps generated by Here we explore this question using the notion of isometries. A direct consequence of the combination reference frames and clocks. We construct imperfect of our results with those of [26] adapted to our setting, codes in which Abelian U(1) groups can be imple- is that all error correcting codes {E, {Ej, Dj}j}, can mented transversally. To that aim, we use a simple fi- be made covariant w.r.t. the U(1) groups considered nite dimensional version of the encoding map from [1], here with an optimal fidelity fworst (largest possible which shows that perfect covariant codes are possible value) satisfying provided one has access to a perfect reference frame. 6 A perfect reference frame [15] is defined as a quan- 1 ln (LdC) O 2 ≤ 1 − fworst ≤ O 2 , (6) tum system that encodes, without error, information (LdC) (LdC) about a particular group element. That is, given a group representation U(g), such that U(0) = 1, the for a large LdC. state |ψi is a perfect reference frame iff ∀ g In order to study the role of different resources in our protocols, we define t-incoherent clock states ρC as those for which there exits g ∈ G such that their hψ| U(g) |ψi = δ0,g, (4) † group evolved initial state, UC(g)ρCUC(g), commutes with the projective measurements used in our protocol where δ is a Kronecker delta for finite groups and 0,g to measure them.3 As we later explain, these states Dirac delta in the case of Lie groups. Hence, each require minimal coherent resources to be created in point of the orbit |ψ(g)i = U(g) |ψi is orthogonal to comparison with other clock states. We find that all all the others (and thus perfectly distinguishable). codes which use t-incoherent clock states satisfy the This connects with the work by Pauli on quan- upper bound 1 − f ≥ O(1/(Ld )). We then con- tum clocks in the case of an Abelian U(1) groups. worst C sider the more commonly used SWP clocks (see for If the group {U(g)} is a one-parameter compact Lie g instance [19, 20, 27–30] and references therein), which group generated by solving the Schr¨odingerequation, belong to this class, and show that they yield an er- namely U(g) = e−igHˆ for some Hamiltonian Hˆ , where ror of order 1−fworst = O(1/(LdC)) hence saturating g = t is the time transcribed, then the constraint Eq. the bound for t-incoherent clocks. However, we also (4) is analogous to requiring the existence of a perfect show that while coherent clock states are necessary to time operator tˆ. Indeed, defining achieve 1 − fworst ≤ O(1/(LdC)), they are not suffi- Z cient, since finite dimensional analogues of coherent tˆ= dg g |ψ(g)ihψ(g)|, (5) G 2The infinite energy manifests itself either with unbounded from below Hamiltonians (when t belongs to an unbounded in- where the integral is over the Haar measure, one finds terval) or infinitely strong potentials producing strict confine- tˆ|ψ(g)i = g |ψ(g)i for all g ∈ G. Pauli [16, 17] already ment of the wave function (for when t belongs to an bounded interval) [18]. concluded that such time operators require quantum systems that — while mathematically well defined — 3See text around Eq. (17) for full definition.
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 2 states can only achieve the same scaling as the SWP about which transversal gate is applied to it is en- clocks. coded in the reference frames, hence without knowl- The results discussed so far consider codes in which edge from the reference frames during the decoding, the error model on the clock is just erasure at known it would not be possible to discern which gates had locations. However, what if one cannot discern the been applied. If the reference frames are damaged via location at which the error occurred? Our final result an error (which is a reasonable assumption since they is to prove that one can also correct local unknown are now part of the extended code space), this will phase errors which occur at an unknown location in inhibit the ability to decode correctly resulting in a the clocks. For this case, we are able to achieve 1 − worse decoding of the logical information. fworst ≤ O(1/(LdC)) up to log factors. The protection of the information to be encoded re- lies on the channel E, which is arbitrary. On the other hand, the protection for the reference frame in the en- 2 Covariant codes based on reference conding of Eq. (8) will come merely from having a few frames copies of them which may or may not be entangled. In (M) ⊗M the case of no entanglement, ρF = ρF , the states We now outline the generic error correction scheme we are only classically correlated due to the twirling over consider, which is based on a generalisation of the ref- G in Eq. (4), and thus bears strong analogies with a erence frame-based scheme in [1]. Let {E, {Ej, Dj}j} classical repetition code. be any perfect error correcting code satisfying Eq. (1) The encoding-error-decoding procedure consists of (not necessarily covariant). the following steps: (M) Now, let ρF be a reference frame for a group 1) An arbitrary state ρL is encoded as Ecov(ρL). isomorphic to {UL(g)}g and {UCo(g)}g, with unitary ⊗M group representation {UF (g)}g. We define the fol- 2) Errors occur: The error maps considered here are lowing for all g ∈ G now of the form Ej,q = Ej ⊗ξq, with ξq acting on the reference frames and the index q — as with ⊗K † †⊗K Eg(·) := UCo(g) E(UL(g)(·)UL(g))UCo(g) . (7) j — may or may not be known depending on the error model. This may include the loss of up to The covariant code is then: M − 1 frames, or in the case of Theorem4, an Z unknown phase error at an unknown location. ⊗M (M) †⊗M Ecov(·) := dg Eg(·) ⊗ UF(g) ρF UF(g) , (8) G 3) Frames are measured: In the case of erasure er- where dg is the uniform or Haar measure over the rors at known locations of the reference frames, 4 only the N non erased clocks are measured. The group. Note that Ecov is from HL to HP ⊗ HF while usually the encoding map takes logical states to states remaining N frames are measured projectively in the physical space. As such, it is convenient to in some basis, and after tracing out the reference think of the reference frames as an extension of the frames, we write code space to H := HCo ⊗HF. Moreover, the chan- ˆ00 Coe trF[Ej,q (Ecov(ρL))] = Ej (Eg0 (ρL)) + Eg0 , (9) nel Ecov is now covariant in the sense of Eq. (3) if the symmetry group on the r.h.s. is defined in the ex- ˆ00 0 where Eg0 represents the error term and g is cho- ⊗K ⊗M tended physical space, namely UCo(g) ⊗ UF(g) , sen based on the measurement outcomes, the ini- so that UL(g) can be implemented transversally. This tial clock states and the error maps ξq. If the way, the notion of covariance defined in Eq. (3) is now 00 reference frames are good, the error Eˆ 0 will be over H rather than H alone. We note, however, g Co Co small since the measurements will be able to dis- that unlikee the code subspace, none of the logical in- tinguish approximately the group elements. In- formation is encoded directly into frames F, and they deed, in the case of perfect reference frames Eq. merely serve as a reference for g, for which both the (4) or equivalently the Idealised clock Eq. (5), ⊗M (M) group {U }g and initial frame state ρ can be 0 00 F F the optimal choice of g leads to no error, Eˆ 0 = 0. chosen at our convenience to optimise our protocol. g The purpose of the error maps Ej is that they take in- 4) Finally, we apply the decoding map D¯j,g0 defined formation from the code space and “mix” it with the as rest of physical space resulting in errors. On the other ¯ hand, the reference frames play the following role in Dj,g(·) = (10) the encoding map Ecov : the logical information is still −1 †⊗K ⊗K † UL(g)E U (g)E (Dj(·)) U (g) U (g), encoded into the code space, but now the information Co Co L −1 −1 4 where Dj (Ej(·)) = E (·), with E being the It is noteworthy that all our results hold for all K — the number of gates being applied transversally. In fact, one can inverse channel for the encoder E (that is, the choose K = 1 when considering a physical space in which the channel that undoes the encoding when no errors gates are not applied locally. occur).
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 3 This achieves have fixed gaps but arbitrary degeneracy, so that h ∈ {0, 1, 2,..., ∆h } with N 3 ∆h ≤ d . As ¯ ˆ S,n S S S Dj,g0 trF[Ej,q (Ecov(ρL))] = ρL + Eg0 , (11) we will see, the performance improves as the range ∆hCo decreases, so in fact the best choice is a trivial where Eˆg0 is the final error term. generator HˆCo ∝ 1, for which we can set ∆hCo = 0. The circuit diagram is as follows. As motivated by our discussion of Pauli’s findings, in this context, one can think of the group elements UF(g) as providing the dynamics of quantum clocks encoding error Decoding ρF where g = t is time. We will therefore refer to ρL the reference frame as a “clock” and use the labels F 0 ⊗K ¯ ⊗K−1 E Ej UCo(g ) Dj,g and C interchangeably in this context. The clock is |0i ρL +Eˆg0 chosen as the compact non-degenerate representation, −itHˆC PdC−1 namely UC(t) = e with HˆC = ωr|rihr|C | i Ecov r=0 where {|riC} is an arbitrary orthonormal basis. Phys- | i ically, energy gaps which are all integer multiples of ω are required to create degeneracies between systems | i L, Co, C. Technically, it means that the group repre- sentations on L, Co, C are compact, and that the ir- This scheme is closely related to the task of reps of U (g) contain those of U (g) and U (g). The reference frame alignment, in which the group of C L Co compactness allows replacement of the integration “transversal gates” corresponds to the unknown ro- range in Eq. (8) with [0,T ] where T = 2π/ω is the tation that happens between two parties, here the 0 0 recurrence time and the measure becomes dg = dt/T . encoder and decoder. This is such that the chan- 0 The main clocks we use in Eq. (8) are based upon nel connecting them is effectively a decoherence chan- the Quasi-Ideal clocks [21] and the SWP clocks [20]. nel. The unknown rotation is inferred by measuring They both share the same Hamiltonian Hˆ . The def- the frame (see [15, 31] for further details). Refer- C inition of SWP clock states are simple, they are any ence frame alignment can in fact be thought of as the one of the pure states of the Fourier-transformed basis particular case where the encoding, error and decod- of eigenbasis of Hˆ , namely ρ = |θ ihθ | with ing are identity channels. We discuss this connection C SWP k k further in Supplementary materialI, where we show 1 dC−1 that the error probability using the Quasi-Ideal clock X −i2πnj/dC |θki = √ e |jiC , (12) 3 2 dC is (ln dC) /dC — a quadratic improvement over the j=0 SWP clock, which only achieves ∝ 1/dC as shown in [31]. where |θki = |θk mod d.i, k ∈ Z; and is referred to as Another question of relevance is what happens the time basis. On the other hand, the Quasi-Ideal 0 0 if the original encoding E already had a group clock states ρQI = |Ψ(k1)ihΨ(k1)| are defined as a of transversal gates {VL,VCo} satisfying Eq. (2). coherent superposition of SWP clocks, If [V ,U (g)] = 0 and [V ,U (g)] = 0 for L L Co Co π 0 2 0 0 X − 2 (k−k1 ) i2πn0(k−k1 )/dC all g ∈ G then these gates are also transver- |Ψ(k1)i = Ae σ e |θki , 0 sal for Ecov. Moreover, while these gates are k∈SdC (k1 ) not transversal for Ecov in general, the gates 0 † 0 0 † 0 where A is a normalization constant, S (k0) is the {UL(g )VLUL(g ),UCo(g )VCoUCo(g )}, which can be dC 1 0 R viewed as merely a change of basis on the original set of dC consecutive integers centred about k1 ∈ 00 and ωn ∈ (0, ωd ) is approximately the mean energy gates, are — up to a small error Eg0 — pairs of 0 C 0 transversal gates on Ecov after the reference frames of the clock. k1 can be thought of as an approximate 0 have been measured and a value g has been discerned initial time marked by the clock. The parameters n0, 0 in step 3); which is performed before decoding. See k1 and σ ∈ (0, dC) can be tuned to our convenience. Supplementary materialA for details. Both the Quasi-Ideal and SWP clocks are usually associated with the same projective operators in the 2.1 Finite-sized clocks “time” basis, defined as We now detail the unitary group representations to dC−1 ˆ X T0 which our results apply to. For the logical and phys- tC = k |θkihθk|. (13) dC ical spaces, we consider all compact representations k=0 of the Abelian U(1) group. These can be written in When measuring individual clocks, we will do so in −itHˆL ⊗K −itHˆCo the form UL(t) = e , UCo (t) = e respec- this time basis. When the clocks are entangled, we tively, where using the shorthand S ∈ {L, Co}, the will use a time operator of this form but with the ˆ PdS−1 generators are HS = n=0 ωhS,n|nihn|S for a dS di- projectors |θkihθk| replaced with non-local projectors mensional space, for some frequency ω > 0. They over the multiple entangled clocks, as explained later.
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 4 For a detailed description of the measurement proto- {E, {Ej, Dj}j}, there exists decoding channels D˜j,q for cols, see Supplementary materialB. Ecov such that the worst-case entanglement fidelity of The Quasi-Ideal clock states have been shown to the covariant encoding satisfies yield a good performance in the context of quantum √ 3 2 control [21] and measurement of time [25]. On the 3π dLdP ln (dC) 2 fworst ≥ 1 − (∆hL + ∆hCo) other hand, in [21, 25] the SWP clocks appeared to 4 dC be suboptimal. For the task at hand, we will prove 3/2 ! p ln (dC) that this difference of performance still occurs. + O dLdP 3 . (16) dC 2.2 Entanglement fidelity For the proof, we need to write the encoding- error-decoding scheme in the form described in The figure of merit we will use for quantifying the supplementary materialB when we have a single clock performance of codes which cannot decode perfectly unaffected by errors. After working out the decod- is the worst-case entanglement fidelity. Given a se- ing protocol explicitly, we find a bound that, to- quence of encoding, error and decoding which we la- gether with the results on the entanglement fidelity bel as the channel K : HL → HL, the entanglement of supplementary materialC allows us to derive the fidelity is defined as Theorem in supplementary materialD, after choos- 3 ing σ = ln (dC) for the single clock we measure. fworst(K) = min hφ| K ⊗ I(|φi hφ|) |φi , (14) φ In order to study the role that the different re- sources play in the current scheme, consider the fol- where I is an identity channel acting on a copy of HL, lowing definitions. We call a clock state ρinc ∈ S(HL), and the optimization is over all bipartite states on with time operator tˆC and unitary group representa- 5 which the map K ⊗ I acts. Having a perfect code as tion {UC(t)}t∈R, t-incoherent if there exists a state those satisfying Eq. (1), is equivalent to fworst(K) = in its periodic orbit which commutes with the time 1, which is achieved with perfect reference frames or operator, namely if there exists t0 ∈ R such that Idealised clocks. For a justification of why this is a † ˆ good measure of approximate codes, see for instance [UC(t0)ρincUC(t0), tC] = 0, (17) [32, 33]. where tˆC is the operator used in step 3) to measure The channel K that we consider here is for the error 6 ˜ the clock. Conversely, clock states which are not t- correction codes {Ecov, {Ej,q, Dj,q}j,q} as described in incoherent are called t-coherent. section2, in which we use clocks that are not idealised. Observe that if one can construct the code E and (M) decoders Dj, then for a given initial clock state ρC , 3 Results in order to construct the covariant code Ecov in Eq. (8), one needs to be able to apply the transversal gates For simplicity, we will only state our bounds to lead- to the clock and code E, and create classical correla- ing order in d , d , d ,L. Here d ≥ d is the di- tions (a separable state) between them. For the de- C P L P Co ˜ mension of the physical space and L is introduced coders Dj, the only additional resource required to later. Except for Theorem4, explicit bounds — apply them is the ability to measure the clocks pro- not just the leading order terms — can be found in jectively in the time basis. The ability to perform such the supplementary material. Furthermore, in all the- operations is always required for the construction of ˜ orems and corollaries in which the Quasi-Ideal clock is any error correction code {Ecov, {Ej,q, Dj,q}j,q}. In involved, the width σ scales logarithmically with dC. the case of t-incoherent clocks, the initial clock state (M) The exact value can be found in the proofs. ρC can then easily be constructed by simply measur- Our first result covers the case in which at least one ing any state on the clock Hilbert space and applying of the clocks is left untouched by erasure errors. the appropriate traversal gate. However, in the case (M) that the initial clock state ρC is t-coherent (such Theorem 1. Consider the covariant code Ecov in Eq. as in the case of Quasi-Ideal clock states in Theorem (8), with M Quasi-Ideal clocks, namely 1), one cannot constructed it with any of the above mentioned operations since they do not allow for the 1 Z T0 E (·) = dt E (·) ⊗ U (t)⊗M ρ⊗M U (t)†⊗M , creation of the necessary coherence (that is, with re- cov T t C QI C 0 0 spect to the basis of tˆ ). Therefore, from a resource- (15) C theoretic standpoint, it is interesting to characterise with error channels {E = E ⊗ ξ } , where {ξ } j,q j q j,q q q how good codes can be if they only use t-incoherent are erasure at known locations of at most M −1 clocks clocks: and {Ej}j are the error channels for the code E. Then + for all M ∈ N , and for all error correcting codes 6Note that in the case of time operators which are not pro- jective POVMs, t-incoherent clocks can still be defined by re- 5 Note that it is sufficient to take an ancillary space of size placing tˆC by the 1st moment operator of the POVM. We do dL. not need to consider such generalisations here however.
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 5 Theorem 2. Consider the covariant code Ecov in Eq. to leading order in dC for all Quasi-Ideal clock states. (8), with one dC dimensional t-incoherent clock ρinc, They are thus approximately minimum√ uncertainty with time operator tˆC defined in Eq. (13), states. By changing the value of σ/ dC from small to large one can achieve the limiting cases of a time Z T0 1 † eigenstate ∆E ∆t, and an energy eigenstate ∆E Ecov(·) = dt Et(·) ⊗ UC(t) ρinc UC(t). (18) T0 0 ∆t. Eq. (16) in Theorem1 corresponds to the opti- 3 mal value of σ = ln (dC), which corresponds to states Allow for no errors on the clock, {Ej,q = Ej ⊗ which are time squeezed (∆E ≥ ∆t), but not by too ξq = Ej ⊗ I}j,q. Then for all error correcting codes much — the states do not become (t-incoherent) time {E, {Ej, Dj}j}, the entanglement fidelity that can be eigenstates. On the other hand, Quasi-Ideal clock achieved is upper bounded by states which are energy squeezed (∆E ≤ ∆t), yield C an entanglement fidelity fworst which scales with dC fworst ≤ 1 − , (19) even worse than t-incoherent states. In-between, one dC finds the non squeezed (∆E = ∆t) Quasi-Ideal states where C > 0 is independent of d . Moreover, −1 C which have the same dC scaling as the t-incoherent there exists a scheme using the Salecker-Wigner-Peres SWP clock. clock, ρinc = ρSWP that achieves The latter Quasi-Ideal clock states behave anal- C∗ ogously to “classical” coherent states — their ex- fworst = 1 − , (20) pectation values in the time and energy bases oscil- d C late like simple harmonic oscillators, and they min- ∗ where C ≥ C is also independent of dC. imize the Heisenberg uncertainty with equal uncer- tainty in each basis. However, the analogy ends here. The full proof is shown in supplementary material The time squeezed Quasi-Ideal clock states remain E and it goes as follows: we write explicitly the state time squeezed under the application of UC(t) for all of the code after the clock has been measured, and t ∈ R, while squeezed coherent states in one quadra- we apply an arbitrary decoder. Then we write the ture (e.g. position) become squeezed in the comple- entanglement fidelity explicitly and show that the er- mentary quadrature (e.g. momentum) under evolu- ror term decays at best linearly with the dimension tion of its Hamiltonian — broadening in the initial of the clock. The performance achieved by the SWP quadrature basis. Intuitively, this is expected to be clock is calculated by looking at the scaling of the an important difference between squeezed coherent errors in the decoding scheme of Section2. states and squeezed Quasi-Ideal clock states, at least The setup in the above Theorem is the same as in regarding the present task. This is because good de- Theorem1 in the special case that M = 1 and one ex- coding maps would require the states to be squeezed changes the Quasi-Ideal clock for a t-incoherent one. during the entire periodic orbit in the basis in which So by comparing Eqs. (16) and (19) we see that there they are measured in step 3) of the decoding protocol. is essentially a quadratic improvement in the scaling We also find a significant improvement to the en- w.r.t. the clock dimension d . This demonstrates the C tanglement fidelity when one has access to a larger necessity of t-coherent clock states to achieve the im- number of clocks. To achieve it, we embed a large proved scaling in our protocols. Furthermore, in all entangled clock within the Hilbert space of L ∈ N+ our protocols, the final state of the clock after apply- smaller ones, effectively creating a clock of dimension ing a decoder D˜ is t-incoherent and thus in protocols j d(L) := L(d − 1) + 1. in which the initial clock state was t-coherent, the C coherence was “used up” in the process. Theorem 3. Given a covariant error correction code Interestingly, we have observed the same effec- {Ecov, {Ej,q, D˜j,q}j,q} as described in section2, with tive quadratic advantage by using the Quasi-Ideal 0 entanglement fidelity f(dC) ≤ fworst ≤ f (dC) in clock rather than the SWP clock for the related + which a single dC ∈ SN ⊆ N dimensional clock task of reference frame alignment (See Section2 and is used, there exists another covariant error correc- Supplementary materialI) and ticking clocks [25]. tion code with the same error channels {E } in While t-coherent clock states are necessary to j,q j,q which L clocks of dimension dC are entangled, such achieve the improved scaling, they are clearly not suf- 0 that f(L(dC − 1) + 1) ≤ fworst ≤ f (L(dC − 1) + 1), ficient. A case in point are clock states which are for all L, d ∈ N+, s.t. L(d − 1) + 1 ∈ S . incoherent in the energy basis. Indeed, by inverting C C N Eq. (12) one observes that they are t-coherent yet The embedding needed for this theorem leads natu- since they do not evolve in time are useless for this rally to an entangled discrete Fourier transform basis task. on the Hilbert space of L clocks Changing the width σ of the Quasi-Ideal clock state allows one to understand these differences better. The d(L) uncertainty in both the energy and time basis, de- 1 X −i2πnk/d(L) |θk(L)i = p e |En,1i , (21) noted ∆E and ∆t respectively, satisfy ∆E∆t = 1/2 d(L) n=0
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 6 where |En,1i are a non-degenerate set of L For the details about how this inequality follows from LL ˆ 7 the results of [26] see Supplementary materialG. 8 eigenvectors of the generator i=1 HC (see supplementary materialF for details). If we keep the code parameters ∆hCo, ∆hL, dP, dL When this embedding is applied to the SWP clock fixed and scale up the clock size and the number of and Quasi-Ideal clock, it gives rise to a L-site SWP clocks, the combination of lower and upper bounds Entangled clock state, ρSWPE,L = |θk(L)ihθk(L)| Eqs. 23, 25 prove that our construction achieves an and an L-site Quasi-Ideal Entangled clock, ρQIE,L = optimal scaling with both the dimension of the clock L 0 L 0 d and the number of them L, up to the logarithmic |Ψ (k1)ihΨ (k1)|, C factors. Furthermore, this proves that the bound is (k−k0) π 0 2 1 L 0 X − 2 (k−k1 ) i2πn0 tight for all choices of {E, {Ej, Dj}j}. |Ψ (k )i = Ae σ e d(L) |θk(L)i , 1 So far we have only considered erasure errors at k∈S (k0) d(L) 1 known locations on the clock. However, what if one with the new time operator, cannot detect where the error occurred without dam- aging the code? This is the case in the most elemen- dC−1 X T0 tary error correcting codes. If one has many clocks tˆC(L) = k |θk(L)ihθk(L)|. (22) dC and the error occurs with an approximately uniform k=0 error probability distribution over the clock locations, The combination of Theorem3 with Theorems1, one simple approach would be to choose one of the 2, yields an important corollary: clocks, erase the other clocks, and perform error cor- rection with this clock. If the probability of the error Corollary 1. Consider the setup in Theorem1, but M occurring on this clock is low, then this would work with ML-site Quasi-Ideal Entangled clocks ρ⊗ , QIE,L well on average. However, this approach is wasteful rather than M Quasi-Ideal clocks and the erasure now since it does not use the encoded information in the being on at most M − 1 of the L-site Quasi-Ideal En- other clocks and requires a low probability of error on tangled clocks. The worst-case entanglement fidelity a particular clock. Now we will investigate how well of the covariant encoding now satisfies we can recover in the case of unknown phase errors at √ 2 3π d d ln3(L d ) unknown locations which also works well for a small f ≥ 1 − L P C (∆h + ∆h )2 worst 4 L d L Co number of clocks. Consider the case in which one C clock (or an entangled block of L clocks in the sense 3/2 ! p ln (L dC) of Theorem3) whose location is unknown has a ran- + O dLdP 3 . (23) (L dC) dom phase applied to it (i.e. an un-known group ele- ⊗L R ment UC (tph), tph ∈ ). We call this a 2-unknown Similarly, consider the setup in Theorem2, but with a N phase error and denote it ξph,q(tph), where q ∈ and dC dimensional t-incoherent clock state ρinc,L, with a t ∈ R are the unknown site location and phase re- ˆ ph time operator tC(L), rather than a SWP clock with spectively. The following result shows that such errors ˆ time operator tC. The worst-case entanglement fi- are correctable up to an arbitrarily small error. delity of the covariant encoding now satisfies Theorem 4. Consider the covariant code Ecov in C Eq. (8), with 3 blocks of L-site Quasi-Ideal Entan- fworst ≤ 1 − , (24) L dC gled clocks, namely T where C is independent of dC, L; and equality is ob- 1 Z 0 E (·) = dt E (·)⊗U (t)⊗3L ρ⊗3 U (t)†⊗3L, tained for the L-site SWP Entangled clock ρSWPE,L. cov t C QIE,L C T0 0 If one compares the scaling with the number of (26) copies L in Eqs. (23),(24) one finds effectively a with error channels {Ej,q = Ej ⊗ ξph,q(tph)}j,q, q ∈ quadratic advantage in the case of the t-coherent 1, 2, 3 where {Ej}j are the error channels for the code states. The difference in scaling between the two cases E, and ξph,q is a 2-unknown phase error acting on is the same as that found in metrology when compar- one of the three L-site Quasi-Ideal Entangled clocks, N+ R ing the classical shot noise scaling with the quantum ρQIE,L. Then for all L ∈ , q ∈ {1, 2, 3}, tph ∈ Heisenberg scaling [34]. and error correcting codes {E, {Ej, Dj}j}, there exists ˜ The bound Eq. (23) in Corollary1 effectively satu- a decoding channel Dj for Ecov, which is independent rates the upper bound derived in [26], which is proven of the unknown block q and phase tph, such that to hold for all covariant error correction codes gener- 7 p 10π(∆hL + ∆hCo) ln (L dC) ated by isometries. Applying it to our constructions, fworst ≥ 1− dLdP √ 3 L dC it takes the form 11 ln (L dC) 2 p ∆h + O dLdP 2 . (27) L (L dC) fworst ≤ 1 − 2 . (25) 16(∆hCo + LdC) 8 Note that the extra additive factor ∆hP in Eq. (25) is to 7The symbol L denotes the Kronecker sum. be expected since the code E could itself contain a clock.
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 7 ment of the qth clock, is thus incorrect. Since the value of q is also unknown, one cannot simply ignore the corresponding measurement outcome, so our pro- tocol is to order the three measured elapsed times in ascending order and apply a unitary corresponding to the elapsed time which is neither the smallest nor the largest out of the three. There are two possibilities: 1) there was no phase error on this clock, in which case the marked elapsed time is approximately cor- rect. In this case, the phase error could have been large. 2) the phase error occurred on this clock. In this case, the phase error must have been small, since the (incorrect) measured elapsed time is upper and lower bounded by that of the other two clocks (which must both be correct, since there is at most one 2- Figure 1: Illustration of 3 clocks superimposed with a unknown phase error). This corresponds to the case 2-unknown phase error. All clocks are set to have the of Fig.1. 0 0 0 same initial time, k1 = k2 = k3 (red glowing hand). This processing of the measurement outcomes is The three measurement outcomes of the three clocks (black very closely related to majority voting used in a clas- hands) attain similar values with high probability. The yel- sical repetition code. Here the main difference is that low shaded region represents possible values of kα for this 0 0 the outcomes of the clocks are not binary and are un- example, where kα = g (dC − 1)/(2πT0), and g is described in step 3) of the decoding protocol in Section2. An un- likely to agree exactly. known phase error occurs on an unknown clock (for the Note how our protocol does not rely on any assump- purpose of illustration, this is the 2nd clock). It has the tions about the probability distributions over blocks nd effect of shifting the initial time of the 2 clock by an un- q = 1, 2, 3 and phases tph ∈ R over which the 2- known amount kph. The apparent elapsed times are ∆t1 = unknown phase error occurs. However, if one does 0 0 2π(k1 −k1)T0/(dC −1), ∆t2 = 2π(k2 −k2 −kph)T0/(dC −1), assume that the probability of the 2-unknown phase 0 ∆t3 = 2π(k3 − k3)T0/(dC − 1), however, due to the 2- error ξph,q(tph) is small and allows for an arbitrary unknown phase error, ∆t2 will give the incorrect prediction. number of 2-unknown phase errors to occur in an in- Nevertheless, in this example, the phase error is small and no dependent and identically distributed manner, then correction is needed. the above protocol will also work with high fidelity since the probability of two or more phase errors oc- curring on two or three clocks will be very small. This result extends trivially to the more general Finally, what about infinite dimensional covariant case in which one has M blocks (rather than 3) of codes of finite energy? We leave the motivation to the L-site Quasi-Ideal Entangled clocks in the covari- Outlook (Section4) and state our conclusions here. ant code and has erasure errors at up to M − 3 One can embed our finite dimensional clock into an known locations, and the 2-unknown phase error on infinite dimensional space, and express d in terms one of the 3 blocks of the remaining copies. See C of the mean energy of the clock, denoted hHˆ i. For supplementary materialH for proof. C all the clocks considered here, this corresponds to the To gain an intuitive picture of how the protocol mapping works, it is best to consider the case L = 1 (the gen- d 7→ 2hHˆ i/ω + 1, (28) eral L case is then a direct consequence of Theorem C C 3). For L = 1 the protocol is similar to our previous (up to additive higher order corrections in hHˆCi, ones: we measure the 3 clocks locally in the time basis, for the case of Quasi-Ideal clocks). Our theorems and based upon the information from the 3 measure- and corollary; when framed in this context, provide ment outcomes, we calculate a time g0 = t0 [step 3)] bounds as a function of energy for how well the errors and apply a corresponding decoding map D¯ j,t0 [step on covariant codes can be corrected. In this context, 4)] on the physical space. Due to the classical corre- due to the infinite dimensions of the physical space, lations between the code and clocks, the outcomes of the Eastin-Knill no-go theorem does not apply, so in the 3 clocks are correlated. This is such that, if there principle one could have perfect covariant error cor- were no 2-unknown phase errors, the clocks would all recting codes. However, as we have seen in Section2, indicate approximately the same “elapsed time” and due to the insights of Pauli, covariant error correcting one could correct the code up to an error of order codes based on reference frames can only be decodable Eq. (27) with the knowledge of only one of the 3 without errors (i.e. fworst = 1) iff they use Idealised measurement outcomes. However, when a phase er- clocks which necessitate infinite energy. We conjec- th 0 ror occurs in the q clock, its initial time kq shifts by ture that this is true in general. Specifically, that an unknown phase, making it an unknown variable all error correcting codes which are covariant w.r.t. and the reported elapsed time by the clock measure- any faithful representation of a non-trivial Lie group,
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 8 necessitate infinite energy. This would be an exten- ment fidelity fworst for finite dC have been derived in sion of the Eastin-Knill no-go theorem since all finite the supplementary material which can be evaluated dimensional systems have finite energy but not vice- numerically for experimentally feasible parameters. versa. Were this the case, we would hope that the reference frames used here might be useful in some near-term applications of quantum technologies in which error 4 Outlook correction has started playing a role, such as quan- tum metrology [37–39]. In particular, given Eq. (25), Given any error correcting code, we have seen how the Quasi-Ideal clock states appear to be almost op- to construct simple classes of approximate codes in timally distiguishable along a whole U(1) orbit. This which compact U(1) groups can be implemented suggests that a setting like that of Theorem4 could transversally. We study a specific scheme using Quasi- be of use in the construction of a metrological scheme Ideal clocks [21] that saturates optimal bounds, ex- aiming to determine unknown parameters (such as the plore the performance of alternative schemes, and also time t of the operator UC (t)). extend to an error model beyond errors at known lo- Covariant infinite dimensional error correcting cations. The present codes are based on the task codes are also of interest. Perhaps most prominently of reference frame alignment, which has been stud- is the example of the hypothesized AdS/CFT dual- ied quite extensively [15] and also formalized within ity between quantum gravity in asymptotically AdS the resource theory of asymmetry [35, 36], which we space (known as the bulk) and a conformal field the- hope will be of further use in the context of error cor- ory on the boundary, where the theory on the bulk rection [1, 26]. Furthermore, since the clocks need to and boundary are related via quantum error correct- be measured projectively in our protocols, a preferred ing codes [40]. Specifically, the bulk constitutes the basis naturally arises and necessary conditions w.r.t. logical space while the boundary is the physical/code this basis for a quadratic advantage are identified. space. Global symmetries in the bulk should cor- An obvious extension of our results is to groups be- respond to symmetries on the boundary which con- yond U(1). This requires the construction of more serve the local structure of the theory — in a simi- involved reference frames, such as finite-sized quan- lar spirit to how transversal gates act globally in the tum “gyroscopes” (for the case of SU(2)). We hope logical space while locally in the physical space [c.f. that our techniques may serve as a starting point for Eq. (3)]. It is argued that variants of the Eastin- generalising the results found here in this direction Knill no-go theorem have important interpretations — perhaps together with the construction of approx- in AdS/CFT: all global symmetries in the bulk (both imate frames for general groups from [31]. continuous and discrete) are ruled out, since their An important question is to understand and char- existence would be in contradiction with the struc- acterize the sort of error models and implementations ture of the correspondence9 [41, 42]. A related is- for which the present scheme is adequate. We have sue is time dynamics which is given by a U(1) sym- mostly explored the case of erasure errors at known ˆ ˆ metry with representations e−itHblk and e−itHbdy for locations, and a type of dephasing errors on the clocks Hamiltonians Hˆblk, Hˆbdy on the bulk and boundary at unknown locations. While these are quite natural ˆ ˆ error models, it may well be that with more involved respectively. Often Hblk, Hbdy are quasi-local and schemes of codes involving clocks, other types of er- thus the corresponding U(1) group action has to also rors can be dealt with. preserve this local structure. An approximate U(1) Also, the results of [26] show tight bounds that can- covariant code with these properties for finite dimen- not be overcome only for erasure errors at known lo- sional Hamiltonians has been developed in [43] us- cations, and it would be interesting to know if their ing techniques from [44]. By choosing the number bounds are also tight for other error models. We of code blocks to be one i.e. K = 1, our protocols suspect that the error scaling in Theorem4 is op- allow for such bulk-boundary time dynamics covari- timal, even though it is only as good as that of the t- ance for arbitrary (e.g. quasi-local) finite dimensional incoherent clock states when the error model was that Hamiltonians on HL and HCo. An open question is of erasure at know locations. Intuitively, the limiting whether further work may allow for clocks with inter- factor in this case is that the 3 blocks of clocks are acting quasi-local Hamiltonians too. only classically correlated (separable states). While Since both theories of the duality are infinite- one can easily construct entangled counterparts, it is dimensional but of finite energy locally, further quan- not clear how this can help when the errors occur over titative variants of the Eastin-Knill no-go theorem for the unknown blocks. infinite dimensional physical spaces, seem more ap- One key point to be determined is whether the er- 9 ror bounds shown here, even if they are essentially Local CFT operators acting on a spatial region R in the boundary, can only access information in a limited region in optimal, are not too large to be useful in practice for the bulk via entanglement wedge reconstruction. This is in- some type of architecture. In the case of Theorem compatible with the existence of charged localised objects in 1 and Corollary1, explicit bounds on the entangle- the bulk.
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 9 propriate (for instance, by taking into account the Inf. Theory, 57(9):6272–6284, 2011. DOI: “average energy density” of the code space). Our re- 10.1109/TIT.2011.2161917. sults suggest that given sufficient energy, the preser- [3] Sergey Bravyi and Robert K¨onig.Classification vation of local symmetries in the boundary is at least of topologically protected gates for local stabi- approximately possible. lizer codes. Phys. Rev. Lett., 110(17):170503, Finally, it is worth noting that the extension of 2013. DOI: 10.1103/PhysRevLett.110.170503. a physical Hilbert space by including clocks has [4] Fernando Pastawski and Beni Yoshida. Fault- been proposed in a different context before. The tolerant logical gates in quantum error-correcting aim of the Wheeler-DeWit equation is to describe codes. Phys. Rev. A, 91(1):012305, 2015. DOI: a time-static theory of quantum gravity in which 10.1103/PhysRevA.91.012305. locally one finds dynamics [45]. This motivated [5] Tomas Jochym-O’Connor, Aleksander Kubica, the Page-Wooters mechanism for describing how a and Theodore J Yoder. Disjointness of stabi- quantum clock can allow for time evolution to follow lizer codes and limitations on fault-tolerant logi- from a static universe using Idealised clocks [46]. In cal gates. Phys. Rev. X, 8(2):021047, 2018. DOI: supplementary materialJ we show that when the 10.1103/PhysRevX.8.021047. logical space has the trivial group representation of [6] Benjamin J Brown, Daniel Loss, Jiannis K the U(1) symmetry, our formalism is an example Pachos, Chris N Self, and James R Woot- of an approximate Page-Wooters mechanism where ton. Quantum memories at finite temperature. the approximation comes from using non Idealised Rev. Mod. Phys., 88(4):045005, 2016. DOI: clocks. 10.1103/RevModPhys.88.045005. [7] Bryan Eastin and Emanuel Knill. Restric- tions on transversal encoded quantum gate sets. Note on Related Work: Around the time this Phys. Rev. Lett., 102(11):110502, 2009. DOI: work was being developed, it was realized by the au- 10.1103/PhysRevLett.102.110502. thors that a complementary approach to characteriz- [8] Sergey Bravyi and Alexei Kitaev. Universal ing how well the Eastin-Knill no-go theorem can be quantum computation with ideal clifford gates circumvented by allowing for a small error, was being and noisy ancillas. Phys. Rev. A, 71(2):022316, developed independently by the authors of [26]. We 2005. DOI: 10.1103/PhysRevA.71.022316. thank them for their community spirit. [9] Emanuel Knill, Raymond Laflamme, and W Zurek. Threshold accuracy for quantum com- putation. ArXiv:quant-ph/9610011, 1996. URL Acknowledgements https://arxiv.org/abs/quant-ph/9610011. [10] H´ector Bomb´ın and Miguel Angel´ Mart´ın- We thank useful conversations with Benjamin Brown, Delgado. Topological computation without Philippe Faist, Daniel Harlow, Tamara Kohler and braiding. Physical review letters, 98(16):160502, Rob Spekkens. This work was initiated at QIP 2018 2007. DOI: 10.1103/PhysRevLett.98.160502. hosted by QuTech at Delft University of Technol- ogy. M.P.W. acknowledges funding from the Swiss [11] Adam Paetznick and Ben W Reichardt. Uni- National Science Foundation (AMBIZIONE Fellow- versal fault-tolerant quantum computation with ship PZ00P2 179914) in addition to the NCCR QSIT. only transversal gates and error correction. This research was supported in part by Perimeter In- Phys. Rev. Lett., 111(9):090505, 2013. DOI: stitute for Theoretical Physics. Research at Perimeter 10.1103/PhysRevLett.111.090505. Institute is supported by the Government of Canada [12] Tomas Jochym-O’Connor and Raymond through the Department of Innovation, Science and Laflamme. Using concatenated quantum Economic Development and by the Province of On- codes for universal fault-tolerant quantum gates. tario through the Ministry of Research, Innovation Phys. Rev. Lett., 112(1):010505, 2014. DOI: and Science. 10.1103/PhysRevLett.112.010505. [13] H´ector Bomb´ın. Gauge color codes: optimal transversal gates and gauge fixing in topologi- References cal stabilizer codes. New J. Phys., 17(8):083002, 2015. DOI: 10.1088/1367-2630/17/8/083002. [1] Patrick Hayden, Sepehr Nezami, Sandu Popescu, [14] Theodore J Yoder, Ryuji Takagi, and Isaac L and Grant Salton. Error correction of quantum Chuang. Universal fault-tolerant gates on reference frame information. ArXiv:1709.04471, concatenated stabilizer codes. Phys. Rev. 2017. URL https://arxiv.org/abs/1709. X, 6(3):031039, 2016. DOI: 10.1103/Phys- 04471. RevX.6.031039. [2] Bei Zeng, Andrew Cross, and Isaac L [15] Stephen D Bartlett, Terry Rudolph, and Chuang. Transversality versus universality Robert W Spekkens. Reference frames, su- for additive quantum codes. IEEE Trans. perselection rules, and quantum information.
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A Compatibility with the transversal gates of E
In our schemes we start with a code E(·) which is in principle arbitrary. We can ask what happens if this code already has a group of transversal or covariant gates (possibly of finite order as granted by [7]). Does that covariance remain after the reference frame is added? Let {VL,VCo,VF} be an element of a representation of the group of transversal gates of E on the logical, physical and reference frame spaces. Thus:
† ⊗K †⊗K E VL(·)VL = VCo E(·)VCo , (29) where ⊗K represents the tensor product structure of the physical space of E. Does the same symmetry hold for E ? Let us write cov Z † † ⊗M (M) †⊗M Ecov(VL(·)VL ) = dg Eg(VL(·)VL ) ⊗ UF(g) ρC UF(g) , (30) G whereas we have, on the other hand
Z ⊗K †⊗K † ⊗K †⊗K ⊗M (M) †⊗M † VCo ⊗ VF Ecov(·) VCo ⊗ VF = dg VCo Eg(·)VCo ⊗ VF(UF(g) ρC UF(g) )VF , (31) G
⊗K It is clear that Eqs. (30) and (31) coincide when i) both commutations [VCo,UCo(g) ] = 0 and [VL,UL(g)] = 0 hold for all g ∈ G and ii) VF acts trivially on the clocks. Otherwise, the covariance/transversality is lost. While the latter can be obtained by choosing VF to act trivially on the clocks, the former seems much more restrictive. However, there is a sense in which we might still have transversal gates in the code, if we are able to set the ⊗K representation UCo(g) on the physical space to the trivial case. After measuring the clocks and obtaining 0 ⊗K some outcome g , one can apply the gates VP ⊗ VF. Then, applying the decoder, the resulting state is
† 0 0 † VLUL(g )ρLUL(g ))VL . (32)
If [VL,UL(g)] = 0 we may just apply UL(g) and end up with the desired state to which the gate has been applied † 0 transversally. Otherwise, what has happened is that we have applied the gate VLUL(g ). We have knowledge
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 12 0 † 0 † of g , and so to end up with VLρLVL we may just apply the unitary VLUL(g )VL . This assumes that one can apply the logical gate both at the logical and the physical level. This discussion gives a further example, together with the errors of the main results, of why it is advantageous to choose the generator HˆCo to be trivial HˆCo ∝ 1P, if possible.
B General encoding-decoding error with finite clocks
Here we explain the form for the encoding-error-decoding protocol for all the schemes of the present work. We refer to this discussion repeatedly in the different proofs. We will here assume that the M clocks are of product form. We will see later that this construction is general enough for our purposes even when the clock are entangled, by considering further divisions of the local sites considered here.
We define the dimensions of the input and output of the error correcting code E to be dL, dP. The dimension of the ith clock is di. If all clocks have the same dimension we use the notation dC := d1 = d2 = .... If we do not write the range over a summation, it will be over the full range.
−itHˆC For our case, the unitary representation is UC(t) = e where HˆC is defined in Section 2.1. The integral measure over the group is dg = dt/T0 on the interval [0,T0]. The encoded state in which M clocks in states ρC,i with i ∈ {1, ..M} are used has the form of Eq. (8)
M 1 Z T0 O E (ρ ) = dt E (ρ ) U (t)ρ U † (t). (33) cov L T t L C C,i C 0 0 i=1
Let us first calculate the integral over t by writing the unitary operators UC(t), UL(t), UCo(t) in their eigenbasis:
dL−1 † X −iωt(hL,n−hL,n0 ) 0 0 E UL(t)ρLUL(t) = e E (L hn | ρL |niL |n ihn|) , (34) n,n0=0 and thus,
dP−1 dL−1 X X −iωt(hCo,q −h 0 +hL,n−h 0 ) 0 Et (ρL) = e Co,q L,n Eq,q0,n,n0 (ρL) |qihq |P, (35) q,q0=0 n,n0=0 with 0 0 0 Eq,q0,n,n0 (ρL) := P hq| E (L hn | ρL |niL |n ihn|) |q iP . (36)
For simplicity, let us define Q := hCo,q − hCo,q0 + hL,n − hL,n0 . Therefore
1 Z T0 Ecov(ρL) = dt Et (·) ⊗ ρC,1(t) ⊗ ρC,2(t) ⊗ ... ⊗ ρC,M(t), (37) T0 0
dP−1 dL−1 T0 1 Z 0 0 X X X −iωt(Q+r1−r +...+rM −r ) 0 = dt e 1 M Eq,q0,n,n0 (ρL) |qihq | (38) T0 q,q0=0 n,n0=0 0 0 0 ~rM ,~rM
⊗ hr1| ρC,1 |r1i ⊗ ... ⊗ hrM | ρC,M |rM i (39)
dP−1 dL−1 X X X 0 = δ 0 0 E 0 0 (ρ ) |qihq | (40) Q+r1−r1+...+rM −rM ,0 q,q ,n,n L q,q0=0 n,n0=0 0 ~rM ,~rM 0 0 0 0 ⊗ hr1| ρC,1 |r1i |r1ihr1| ⊗ ... ⊗ hrM | ρC,M |rM i |rM ihrM |, (41)
ˆ where {|rii} is the eigenbasis of the generator HC of the i-th clock, δ(·,·) is the Kronecker-Delta function and
d −1 d −1 X X1 XM = ... . (42) 0 0 0 ~rM ,~rM r1,r1,=0 rM ,rM ,=0
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 13 Since by assumption the last N + 1,...,M clocks may be lost due to erasure errors, we can trace them out:
dP−1 dL−1 X X X 0 tr [E (ρ )] = δ 0 0 E 0 0 (ρ ) |qihq | (43) CN+1...CM cov L Q+r1−r1+...+rN −rN ,0 q,q ,n,n L q,q0=0 n,n0=0 0 ~rM ,~rM 0 0 0 0 ⊗ hr1| ρC,1 |r1i|r1ihr1| ⊗ ... ⊗ hrN | ρC,N |rN i |rN ihrN | (hrN+1| ρC,N+1 |rN+1i ... hrM | ρC,M |rM i) (44)
dP−1 dL−1 X X X 0 = δ 0 0 E 0 0 (ρ ) |qihq | (45) Q+r1−r1+...+rN −rN ,0 q,q ,n,n L q,q0=0 n,n0=0 0 ~rN ,~rN 0 0 0 0 ⊗ hr1| ρC,1 |r1i|r1ihr1| ⊗ ... ⊗ hrN | ρC,N |rN i |rN ihrN |. (46) So by comparing Eqs. (46), (41), we observe that after tracing out the additional clocks, the resultant channel is of the same form as the original channel, when evaluated for the renaming number of clocks. We now assume that an error due to the environment occurs. This means that we apply a CPTP error map Ej : HP → HP corresponding to an error j. We thus denote
j 0 0 0 Eq,q0,n,n0 (ρL) := P hq| Ej (E (L hn | ρL |niL |n ihn|)) |q iP . (47) We now measure the remaining clocks, performing projective measurements in the “time” basis
( d −1 )dm 1 m X −i2πnk/dm |θkim = √ e |nim (48) dm n=0 k=0 on the mth clock. Let us drop the m subindex for simplicity of notation. The state after the outcome ~k := k1, k2, . . . , kN is:
~k ρP ⊗ |θk1 ihθk1 | ⊗ ... ⊗ |θkN ihθkN | := (49) |θ ihθ | ⊗ ... ⊗ |θ ihθ | tr [E E (ρ )] |θ ihθ | ⊗ ... ⊗ |θ ihθ | k1 k1 kN kN CN+1...CM j cov L k1 k1 kN kN (50) p~k
dP−1 dL−1 1 X X X j 0 = δQ+r −r0 +...+r −r0 ,0 E 0 0 (ρL) |qihq | (51) p 1 1 N N q,q ,n,n ~k q,q0=0 n,n0=0 0 ~rN ,~rN ! 0 0 0 0 hr1| ρC,1 |r1i hθk1 |r1i hr1|θk1 i ... hrN | ρC,N |rN i hθkN |rN i hrN |θkN i ⊗ |θk1 ihθk1 | ⊗ ... ⊗ |θkN ihθkN |. (52)
Thus, after postselecting on a particular outcome represented with the vector ~k, we obtain the following state on the Hilbert space of the output of EjE(·)
dP−1 dL−1 ~k 1 X X X j 0 ρ = δQ+r −r0 +...+r −r0 ,0 E 0 0 (ρL) |qihq | (53) P p 1 1 N N q,q ,n,n ~k q,q0=0 n,n0=0 0 ~rN ,~rN 0 0 0 0 hr1| ρC,1 |r1i hθk1 |r1i hr1|θk1 i ... hrN | ρC,N |rN i hθkN |rN i hrN |θkN i . (54) An outcome labeled with ~k happens with a probability given by " #
p~k = tr |θk1 ihθk1 | ⊗ ... ⊗ |θkN ihθkN | trCN+1...CM [EjEcov(ρin)] |θk1 ihθk1 | ⊗ ... ⊗ |θkN ihθkN | (55)
1 Z T0+t0 = dt tr [EjEt (ρL)] hθk1 |ρC,1(t)|θk1 i ... hθkN |ρC,N(t)|θkN i (56) T0 t0 Z T0+t0 1 R = dt hθk1 |ρC,1(t)|θk1 i ... hθkN |ρC,N(t)|θkN i ∀ t0 ∈ . (57) T0 t0 Now, let us define the following function.
Z T0+t0 ~ 1 −iωQt R Z FQ(k) := dt e hθk1 |ρC,1(t)|θk1 i ... hθkN |ρC,N(t)|θkN i , ∀ t0 ∈ ,Q ∈ , (58) T0 t0 where for simplicity we will assume that all the clock dimensions are equal d1 = d2 = ... = dN =: dC. This definition has the following properties:
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 14 ~ 1) Since the integrand has period T0, FQ(k) is independent of t0 and we can set it to any preferred real number to help perform the calculations. 2) We can perform the change of variable t = t0 + a, a = −l 2π , l ∈ Z, to show ωdC
2π i2πlQ/d Z T0+t0−l ωd ~ e C 0 −iωQt FQ(k) = dt e hθk1+l|ρC,1(t)|θk1+li ... hθkN +l|ρC,N(t)|θkN +li (59) 2π T0 t0−l ωdC i2πlQ/d ~ = e FQ(k + l), (60) ~ ~ ~ where the jth vector component of k+l is defined by [k+l]j := [k]j +l for all vector component j. Note how ~ ~ this expression is invariant under l 7→ l + jdC, j ∈ Z. So w.l.o.g. we can exchange k + l with [k + l](mod. d), where the map acts element-wise on vectors and (mod. d) denotes modular d arithmetic.
3) By inspection, we see that FQ is invariant under any pairwise interchanges
kq ↔ kr and ρC,q(t) ↔ ρC,r(t), q, r ∈ 1,...,N, (61) ~ where kq and kr are the qth and pth vector elements of k.
4) By Eq. (57), it follows that FQ encodes the measurement outcome probabilities, ~ p~k = F0(k). (62)
This has important consequences when property 2) is taken into account. For example, in the case of one clock, it implies that all measurement outcomes are equally likely, so 1 p~k = ∀ k1 = 0, . . . , dC − 1. (63) dC
d −1 5) By making the substitution U (t) = P m e−iωrmt|r ihr |, we find m rm=0 m m X F (~k) = δ 0 0 (64) Q Q+r1−r1+...+rN −rN ,0 0 ~rN ,~rN 0 0 0 0 hr1| ρC,1 |r1i hθk1 |r1i hr1|θk1 i ... hrN | ρC,N |rN i hθkN |rN i hrN |θkN i . (65)
~k Thus using property 5), we can write ρP in Eq. 52 as
dP−1 dL−1 ~k 1 X X X j 0 ρ = δQ+r −r0 +...+r −r0 ,0 E 0 0 (ρL) |qihq | (66) P p 1 1 N N q,q ,n,n ~k q,q0=0 n,n0=0 0 ~rN ,~rN 0 0 0 0 hr1| ρC,1 |r1i hθk1 |r1i hr1|θk1 i ... hrN | ρC,N |rN i hθkN |rN i hrN |θkN i . (67) dP−1 dL−1 ~ X X FQ(k) j 0 = E 0 0 (ρ ) |qihq |. (68) ~ q,q ,n,n L q,q0=0 n,n0=0 F0(k)
It is convenient to introduce an arbitrary phase kα ∈ R which for our purposes has to be defined modulo dC. It will depend on ~k, the measurement outcomes. We will choose it later depending on the particular covariant error correcting code set-up and protocol. We can now write
dP−1 dL−1 ~ ~k X X FQ(k) j 0 ρ = E 0 0 (ρ ) |qihq |. (69) P ~ q,q ,n,n L q,q0=0 n,n0=0 F0(k) dP−1 dL−1 " ~ # ! X X FQ(k) = e2πikαQ/dC − 1 + 1 (70) ~ q,q0=0 n,n0=0 F0(k)
⊗K† j † 0 ⊗K UP (tα)Eq,q0,n,n0 UL(tα)ρLUL(tα) |qihq |UP (tα) (71) =U ⊗K†(t ) Eˆ0 (˜ρ ) + Ej(˜ρ ) U ⊗K (t ), (72) P α ~k L L P α
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 15 where † T0 ρ˜L := UL(tα)ρLUL(tα), tα := kα , (73) dC and dP−1 dL−1 " ~ # FQ(k) ˆ0 X X 2πikαQ/dC j 0 E (·) := e − 1 E 0 0 (·)|qihq | (74) ~k ~ q,q ,n,n q,q0=0 n,n0=0 F0(k) In order to proceed with the decoding, let us define the function p(Q,~k) as: ~ FQ(k) p(Q,~k) = 1 − e2πikαQ/dC , (75) ~ F0(k) where p(Q,~k) is a complex number for which we expect |p(Q,~k)| 1 (how small will determine the size of the error of the particular sheme). The phase kα determines the group elements we should apply in the decoding procedure, as per Eq. (73). ⊗K 1 Since by assumption the group action only acts non-trivially in the physical space, UP (tα) = UCo(tα)⊕ P/Co, the decoder may take the form
¯ −1 † Dj,tα (·) = UL(tα)E (UCo(tα)E (Dj(·)) UCo(tα)) UL(tα), (76)
−1 where E (·) = Dj (Ej(·)) is the inverse channel for the encoder E and Dj the decoding map of E. ~k With it we see that if we apply the decoder to the state ρP, we obtain
~k ˆ ρP = ρL − E~k(ρL), (77) where we define
dP−1 dL−1 ˆ X X ~ ¯ j †⊗K 0 ⊗K E~k(ρL) = p(Q, k) Dj,tα Eq,q0,n,n0 (ρL) UP (tα)|qihq |UP (tα) . (78) q,q0=0 n,n0=0
~ ~ Since each of the outcomes k occurred with probability F0(k), the final decoded state, averaged over all mea- surement outcomes, is of the form X ~ ˆ K(ρL) = ρL − F0(k)E~k(ρL). (79) ~k In AppendixC we show how a bound on the entanglement fidelity of the code follows from this expression. The last fact that then needs to be shown is the form of the RHS of Eq. (75) for particular cases of clocks.
C Calculation of the entanglement fidelity
We here give the bounds on the entanglement fidelity which will be used to prove the main results. Again, it is defined as fworst(K) = min hφ| K ⊗ I(|φi hφ|) |φi , (80) φ where the minimization is over all the pure bipartite states |φi. Motivated by the discussion in AppendixB leading to Eq. (79), let us start with the assumption that after the encoding, error and decoding steps, the map has the following form when applied to a state ρ.
K(ρL) = ρL − Eˆ(ρL), (81)
A result from [32] allows us to lower bound the entanglement fidelity in terms of Eˆ(ρL). If for all pure states on a single system on Hdin the following holds hφ| K(|φi hφ|) |φi ≥ 1 − , (82)
3 ˆ ˆ then we have that fworst(K) ≥ 1 − 2 . Given that hφ| E(|φi hφ|) |φi ≤ ||E(|φi hφ|)||1, we can choose = ˆ max|φihφ| ||E(|φi hφ|)||1, where the optimization is over all pure states, thus obtaining 3 fworst(K) ≥ 1 − max ||Eˆ(|φi hφ|)||1. (83) 2 |φihφ|
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 16 The next step is to give an upper bound to the 1-norm of Eˆ that holds for any pure state. First, by the triangle inequality ˆ X ~ ˆ X ~ ˆ ||E||1 = || F0(k)E~k||1 ≤ F0(k)||E~k||1. (84) ~k ~k As seen in AppendixB, in all of the cases considered here, the operator Eˆ is defined as Eˆ = D¯ Eˆ0 where ~k ~k j,tα ~k ¯ Dj,tα is the decoder, and
dout−1 din−1 X X K Eˆ0 = U †⊗ (t )|qihq0|U ⊗K (t ) hq| E E (|ni hn| hn| ρ |n0i) |q0i p(Q,~k), (85) ~k Co α Co α j 0 L q,q0=0 n,n0=0 where p(Q,~k) is in principle constrained by complete positivity and trace preservation (as defined in Eq. (78)). By contractivity of CPTP maps, ||Eˆ || ≤ ||Eˆ0 || . Now, we can write ~k 1 ~k 1
din−1 ˆ0 X X 0 0 0 ~ ||E~ ||1 = max | hq| Ej(|ni hn | hn| ρL |n i) |q i p(Q, k)| (86) k q0 q n,n0=0 din−1 X 0 X 0 0 ~ = max tr |q i hq| Ej(|ni hn | hn| ρL |n i)p(Q, k) (87) q0 q n,n0=0
din−1 X X 0 0 ~ ≤ max ||Ej( |ni hn | hn| ρL |n i p(Q, k))||1 (88) q0 q n,n0=0
din−1 X X 0 0 ~ ≤ ||Ej||1−1 max || |ni hn | hn| ρL |n i p(Q, k)||1 (89) q0 q n,n0=0 where the third line follows from the inequality [47],
† |tr[BA ]| ≤ ||A||p||B||r, (90) with 1 = 1/p + 1/r and choosing p = 1, r = ∞, with B = |q0i hq| and A the rest. The fourth line follows from ||Ej (X)||1 the definition of the 1 − 1 norm for CPTP maps, which is ||Ej||1−1 = sup , where the optimization is X ||X||1 over operators on the Hilbert space of the input of Ej .√ By contractivity, we have that ||Ej||1−1 ≤ 1. The last step is to bound the left-over 1-norm. By using ||A||1 ≤ din||A||2 we can bound the 2 norm instead, as 2 din−1 din−1 X 0 ~ 2 X 0 ~ || |ni hn| hn| ρL |n i p(Q, k)||2 = tr |ni hn| hn| ρL |n i p(Q, k) (91) n,n0=0 n,n0=0
din−1 X 00 00 ~ ~ = hn| ρL |n i hn | ρL |ni p(hCo,q − hCo,q0 + hL,n − hL,n00 , k)p(hCo,q − hCo,q0 + hL,n − hL,n00 , k) (92) n,n00=0
din−1 ~ 2 X 00 00 ~ 2 2 ~ 2 ≤ max |p(Q, k)| hn| ρL |n i hn | ρL |ni = max |p(Q, k)| tr[ρL] = max |p(Q, k)| , Q Q Q n,n00=0 since ρL = |φihφ|. Generically in our examples the optimization is over the range Q ∈ {−(∆hL + † ∆hCo),..., ∆hL + ∆hCo} as defined in Sec. 2.1, but if the representation UCo(t) is trivial (that is, the generator is the identity) then Q ∈ {−∆hL, ∆hL}, which yields the best performance. Finally we have ˆ p X ~ p ~ ||E~ ||1 ≤ din max max |p(Q, k)| = dindout max |p(Q, k)|, (93) k q0 Q Q q ~ ~ which holds for any |φihφ|. Since outcome k occurs with probability p~k = F0(k), we have 3p X ~ ~ fworst(K) ≥ 1 − dindout F0(k) max |p(Q, k)|. (94) 2 Q ~k ~ ~ For particular sets of clocks and schemes, we will give bounds for F0(k) max |p(Q, k)|, and then use Eq. (94) to Q estimate the entanglement fidelity.
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 17 D Proof of Theorem1, a bound for a single remaining clock
Following the discussion of appendicesB andC, here we provide the proof of the bound on the quantity that we use to bound the entanglement fidelity for the case in which, after erasure errors, only a single clock is ensured not to be erased. For simplicity of notation, let us use the shorthand d = dC. The first step is to notice that the discussion of AppendicesB andC shows we only have to compute a bound on max |p(Q,~k)|, where Q
~ FQ(k) −p(Q,~k) = e2πikαQ/d − 1, (95) ~ F0(k) as defined in Eq. (75). Then, any upper bound on |p(Q,~k)| ∀ Q,~k will yield a lower bound on the worst-case entanglement fidelity as per Eq. (94). We now compute this ratio explicitly for a single Quasi-Ideal clock, which we do following the notation of AppendixB. Let us recall that
Z T0+t0 ~ 1 −iωQt R Z FQ(k) = dt e hθk1 |ρC,1(t)|θk1 i , ∀ t0 ∈ ,Q ∈ . (96) T0 t0
0 In this case of this proof, we let kα = k1 − k1. After measuring the single clock, and right before applying the decoding, the state is that of Eq. (72), that is
dP−1 dL−1 " ~ # ! ~ X X FQ(k) ρk = e2πikαQ/d − 1 + 1 (97) P ~ q,q0=0 n,n0=0 F0(k)
⊗K† j † 0 ⊗K UCo (tα)Eq,q0,n,n0 UL(tα)ρLUL(tα) |qihq |UCo (tα). (98)
~ Using property 2) of FQ(k) (see Eq. (60)), we observe that the first line of Eq. (98) is invariant under the ~ −i2πlQ/d ~ change of variable k1 7→ k1 + l (Since FQ(k) maps to e FQ(k) while kα to kα + l). Thus the situation is the same for all measurement outcomes k1. As such we will only need to concern ourselves with one of the 0 measurement outcome k1, which we choose for convenience to be k1 = kMa := max{Sd1 (k1)}, where the set 0 Sd(k1) is described in the main text is defined to be n d do S (k0) = k : k ∈ Z, − ≤ k0 − k < , (99) d 1 2 1 2 0 R 0 0 for k1 ∈ . Thus kMa = k1 + d/2 if k1 + d/2 is integer (we will assume this is the case here, but one can find analogous results for when it is half integer)10 We are now interested in bounding the overlap
−itHˆc 0 hθkMa |e |ψnor(k1)i . (100)
This can be bounded with the results in Theorem 8.1 on page 151 of [21]. The theorem tells us that for all t ∈ R d −itHˆc 0 0 e |Ψnor(k1)i = |Ψnor(k1 + t )i + |εi , (101) T0 where 0 X 0 |Ψnor(k1)i = ψnor(k1; k) |θki , (102) 0 k∈Sd(k1 ) with k−k0 2 2 1 π 0 i2πn1 d 0 −( σ ) (k−k1 ) ψnor(k1; k) = Ae e . (103)
The error term εc := |||εi||2 satisfies
d d εc(t) < |t| εtotal + |t| + 1 εstep + εnor, (104) T0 T0
10 0 Recall that k1 is the value at which the Gaussian amplitude of the initial Quasi-Ideal clock state is centred.
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 18 where ! ! 2 2 α0 1 1 − πσ α2 1 1 d 1 − πd ε = 2πAd 2σ + + e 4 0 + + + + e 4σ2 total 2 −πσ2α πd πd2 2 2 2πσ 1 − e 0 − 2 − 2σ 2πd 1 − e σ 1 − e σ2 (105) and A is defined in Eq. (124), and α0 ∈ (0, 1] is defined in [21] to be:
Definition 1. (Distance of the mean energy from the edge of the spectrum) We define the parameter α0 ∈ (0, 1] as a measure of how close n0 ∈ (0, d − 1) is to the edge of the energy spectrum, namely 2 α = min{n , (d − 1) − n } (106) 0 d − 1 0 0 2 = 1 − 1 − n0 ∈ (0, 1]. (107) d − 1
The maximum value α0 = 1 is obtained for n0 = (d − 1)/2 when the mean energy is at the mid point of the energy spectrum, while α0 → 0 as n0 approaches the edge values 0 or d − 1. Furthermore,
2 − πd εstep < 2Ae 4σ2 (108)
√ πd2 2 − − πσ 40 2 e 2σ2 σ e 2 εnor ≤ + √ (109) − 2πd −πσ2 3σ 1 − e σ2 2 1 − e where on the r.h.s. of the inequality in Eq. (109) we have assumed σ ≥ 1 and d = 2, 3, 4,... (tighter bounds can be found in Section E.A.2 of [21]). We can now get back to estimating the overlap Eq. (100). We find that for all t ∈ [0,T0],
−itHˆc 0 −itHˆc 0 hθkMa |e |ψnor(k1)i = hθkMa |e |ψnor(k1)i + hθkMa |ε(t)i (110) X 0 hθkMa | ψnor(k1 + td/T0; k)|θki + hθkMa |ε(t)i (111) 0 k∈Sd(k1 ) 0 =ψnor(k1 + td/T0; kMa) + hθkMa |ε(t)i . (112) 0 0 Thus when ρC,1 = |ψnor(k1)ihψnor(k1)|, and t ∈ [0,T0],
−itHˆc 0 0 −itHˆc hθkMa |ρC,1(t)|θkMa i = hθkMa |e |ψnor(k1)i hψnor(k1)|e |θkMa i (113) 0 2 2 =|ψnor(k1 + td/T0; kMa)| + | hθkMa |ε(t)i | (114) 0 + 2 Re ψnor(k1 + td/T0; kMa) hε(t)|θkMa i (115) 0 2 =|ψnor(k1 + td/T0; kMa)| + ε1(t/T0) (116) 2 d 2 t 1 t 1 −π( σ ) T − 2 −i2πn1 T − 2 2 =|Ae 0 e 0 | + ε1(t/T0) (117) 2 d 2 t 1 2 −2π( σ ) T − 2 =A e 0 + ε1(t/T0). (118)
Thus using ω = 2π/T0 and the change of variable x = t/T0 − 1/2, and setting t0 = 0 such that integral is over t ∈ [0,T0], we find
Z T0 ~ 1 −iωQt FQ(k) = dt e hθkMa |ρC,1(t)|θkMa i (119) T0 0 T 2 1 Z 0 d 2 t 1 −iωQt 2 −2π( σ ) T − 2 = dt e A e 0 + ε1(t/T0) (120) T0 0 1 Z 2 2 −πiQ −i2πQx 2 −2π( d ) x2 = e dx e A e σ + ε1(x + 1/2) (121) 1 − 2 Z ∞ 2 −πiQ −i2πQx 2 −2π( d ) x2 = e dx e A e σ + ε2 (122) −∞ 2 −πiQ 2 σ − π ( σ ) Q2 = e A √ e 2 d + ε2, (123) 2d
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 19 ~ Recalling that F0(k) = 1/d and that, following Section E.1.1 of [21] we have √ 2 A = 2/σ + εA, (124)
εA is specified later in Eq. (131), we can write
~ 2 FQ(k) 2πik Q/d 2 σ − π σ Q2 πi(2k −d)Q/d e α = A √ e 2 ( d ) + dε e α (125) ~ 2 F0(k) 2 σ π σ 2 2 − ( ) Q πi(2kα−d)Q/d = (1 + √ εA)e 2 d + dε2 e (126) 2 2 σ − π ( σ ) Q2 = (1 + √ εA)e 2 d + dε2, (127) 2 0 where in the last line we have used kα = k1 − k1 = d/2 in order to get rid of the phase. Finally, we need to find bounds for both ε2 and εA. Let us start with ε2, defined as
1 Z 2 π d2 2 − 2 2 ε2 = ε1(x + 1/2)dx + A e σ , (128) 1 − 2 where ε1 is defined in Eq. (118). By inspection, we have 2 ε1(t) ≤ 2εc(t) + εc(t) (129) where εc is reproduced in Eq. (104). Hence going back to the definition of 2 in Eq. (128), we can then conclude that π d2 2 2 − 2 2 |ε2| ≤ 2 (dεtotal + (d + 1)εstep + εnor) + (dεtotal + (d + 1)εstep + εnor) + A e σ (130)
To bound the error term εA, we use the results from Eq. (477-483) from Section E.1.1 on page 84 of [21]. The bound is
ε¯1 +ε ¯2 |εA| ≤ , (131) √σ √σ − ε¯ − ε¯ 2 2 1 2 where
2 2 − πd − πσ 2e 2σ2 σ 2e 2 ε¯1 := , ε¯2 := √ . (132) − 2πd −πσ2 1 − e σ2 2 1 − e
Thus, the leading contribution to εA comes from ε¯2, and the leading contribution to ε2 comes from the first term of εtotal and the last of εnor. It can be seen in Eq. (105) that the first term of the sum only decays as 2 √ − πσ α2 σde 4 0 . Thus, we can write
˜ ~ 2 2 2 2 FQ(k) 2πik Q/d − π σ Q2 − πσ −d2 3 − πsσ − πσ −d2 e α = e 2 ( d ) 1 + O e 2 + O(e ) + O(d e 4 ) + O(e 2 ) + O(e ) . (133) ~ F0(k) Going back to the definition of Eq. (75), this gives the following bound on max |p(Q,~k)|, Q
2 2 2 2 − π σ Q2 − πσ −d2 3 − πsσ − πσ −d2 max |p(Q,~k)| ≤ 1 − min e 2 ( d ) 1 + O e 2 + O(e ) + O(d e 4 ) + O(e 2 ) + O(e ) , Q Q (134)
2 2 2 2 − π σ (∆h +∆h )2 − πσ −d2 3 − πsσ − πσ −d2 ≤ 1 − e 2 ( d ) L Co 1 + O e 2 + O(e ) + O(d e 4 ) + O(e 2 ) + O(e ) , (135) from which, given the discussion of AppendixC, the bound on the entanglement fidelity follows. To finalise the proof, we need to pick an optimal value of σ. Choosing σ = ln3(d), we obtain the best scaling of the leading error term in d, which gives
2 3 π ln (d) 2 3/2 ! − 2 d Q ln (d) max |p(Q,~k)| ≤ 1 − min e + O (136) Q Q d3 2 ! π ln3(d) ln3/2(d) = (∆h + ∆h )2 + O , (137) 2 d L Co d3
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 20 from which, given the discussion of AppendixC, the bound on the entanglement fidelity follows. The choice σ = ln3(d) corresponds to time squeezed Quasi-Ideal lock state (i.e. ∆t < ∆E, where ∆t and ∆E are the standard deviation in the time and energy bases as described in the main text).
E Proof of bound for clocks diagonal in the time eigenbasis
We here give a proof of Theorem2, which is a bound on the entanglement fidelity of clocks which are, at some point in their periodic orbit, diagonal in the basis in which the are measured — the time eigenbasis {|θki}, conjugate to the energy eigenbasis. That is, we assume that there exits t0 ∈ R such that the initial clock state ρinc satisfies dC−1 † X 2 UC(t0)ρincUC(t0) = |Ak| |θkihθk| :=ρ ˜C,1, (138) k=0
dC−1 for some probability amplitudes { |Ak| }k=0 . Therefore,
dC−1 dC−1 2 |Ak| 0 0 X 2 X −i2πk(r1−r1)/dC hr1|ρ˜C,1|r1i = |Ak| hr1|θki hθk|r1i = e . (139) dC k=0 k=0
0 Unlike in the previous case of an optimal clock, the above equation only depends on the difference r1 −r1 rather 0 than r1, r1 individually (c.f. the Quasi-Ideal clock case). Before preceding, we need to write the covariant encoding channel in a way which reflects the form of Eq. (138). Note that Eq. (18) in the theorem has the property 0 Z T0 Z T0+t 1 † 1 † Ecov(·) = dt Et(·) ⊗ UC(t) ρinc UC(t) = dt Et(·) ⊗ UC(t) ρinc UC(t), (140) T0 0 T0 t0 for all t0 ∈ R. This is easily provable via a change of variable and is a consequence of the fact that the integrand 0 is periodic and we are integrating over one period. Hence via the change x = t − t0 and setting t = t0, we find
Z T0 Z T0 1 † 1 † Ecov(ρL) = dt Et(·) ⊗ UC(t) ρinc UC(t) = dt Et+t0 (˜ρL) ⊗ UC(t)ρ ˜C,1 UC(t), (141) T0 0 T0 0
† where ρ˜L = UL(t0)ρLUL(t0) ∈ HL. The above equation shows how to write the covariant encoding channel in terms of the clock state ρ˜C,1 which is diagonal in the time basis. Since our results are stated in terms of the entanglement fidelity which is independent of any particular input, the change in inputs ρL to ρ˜L in the above equation is irrelevant and we will thus hence ignore this difference. The only relevant difference is thus that the encoding map Et is shifted to Et+t0 . This small difference can easily be accounted for at the decoding stage without extra complication.
0 0 From Eq. (35), we see that changing Et for Et+t0 is equivalent to changing Eq,q ,n,n to −iωt0(hCo,q −hCo,q0 +hL,n−hL,n0 ) j e Eq,q0,n,n0 or equivalently, changing Eq,q0,n,n0 to
˜j −iωt0(hCo,q −hCo,q0 +hL,n−hL,n0 ) j Eq,q0,n,n0 := e Eq,q0,n,n0 (142)
j ˜j Hence we can use Eq. 52 by making the replacements Eq,q0,n,n0 (defined in Eq. (47)) with Eq,q0,n,n0 (·) and ρC,1 with ρ˜C,1, followed by plugging in Eq. (139). Hence recalling the short hand notation Q := hCo,q − hCo,q0 + hL,n − hL,n0 , we find
dP−1 dL−1 dC−1 ~k 1 X X X ˜j 0 ρ = δ 0 E 0 0 (ρ ) |qihq | (143) P Q+r1−r1,0 q,q ,n,n L p~k 0 0 0 q,q =0 n,n =0 r1,r1=0 0 0 hr1| ρ˜C,1 |r1i hθk1 |r1i hr1|θk1 i (144)
dP−1 dL−1 dC−1 1 X X X ˜j 0 = δ 0 E 0 0 (ρ ) |qihq | (145) Q+r1−r1,0 q,q ,n,n L p~k 0 0 0 q,q =0 n,n =0 r1,r1=0
dC−1 2 X |Ak| −i2π(k −k)(r −r0 )/d e 1 1 1 C . (146) d2 k=0 C
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 21 Now applying d−1 d−1 X X f(r − r0) = (d − |x|)f(x) ∀f : R → R (147) r,r0=0 x=−(d−1) to Eq. (146), we have
dP−1 dL−1 dC−1 dC−1−|x1| ~k 1 X X X X ˜j 0 ρP = δQ+x1,0 Eq,q0,n,n0 (ρL) |qihq | (148) p~k 0 0 q,q =0 n,n =0 x1=−(dC−1) p1=0
dC−1 2 X |Ak| e−i2π(k1−k)x1/dC (149) d2 k=0 C
dP−1 dL−1 dC−1 1 X X X ˜j 0 = (dC − |x1|) δQ+x1+...+xN ,0 Eq,q0,n,n0 (ρL) |qihq | (150) p~k 0 0 q,q =0 n,n =0 x1=−(dC−1)
dC−1 2 X |Ak| e−i2π(k1−k)x1/dC . (151) d2 k=0 C
dP−1 dL−1 1 X X ˜j 0 = (d − |Q|) E 0 0 (ρ ) |qihq | (152) p C q,q ,n,n L ~k q,q0=0 n,n0=0
dC−1 2 X |Ak| e−i2π(k1−k)Q/dC . (153) d2 k=0 C
As all the outcomes are equally likely, we have that p~k = 1/dC. Hence
dP−1 dL−1 dC−1 ~k X X |Q| X 2 ˆ 0 0 ρP = 1 − |Ak| Oq,q ,n,n (tk−k1 ), (154) dC q,q0=0 n,n0=0 k=0 where we have defined
⊗K† j † ⊗K ˆ 0 0 ˜ Oq,q ,n,n (tk−k1 ) := UCo (tk−k1 ) Eq,q0,n,n0 UL(tk−k1 )ρLUL(tk−k1 ) UCo (tk−k1 ) (155)
2π with tk−k1 = ω (k − k1). It is convenient to write this as
dC−1 ~k X 2 1 ˆ ρP = |Ak| ρP(tk−k1 ) + δ(tk−k1 ) , (156) dC k=0 where
dP−1 dL−1 X X ˆ ⊗K† † ⊗K ρP(t) := Oq,q0,n,n0 (t) = UCo (t + t0) EjE UL(t)ρLUL(t) UCo (t + t0), (157) q,q0=0 n,n0=0
dP−1 dL−1 ˆ X X δ(t) := − |Q| Oˆq,q0,n,n0 (t). (158) q,q0=0 n,n0=0
Observe that if we can apply the map
† ⊗K ⊗K† UL(tk−k1 )Dj UCo (tk−k1 + t0)(·)UCo (tk−k1 + t0) UL(tk−k1 ) (159)
to ρP(tk−k1 ), we have perfect error correction, i.e. † ⊗K ⊗K† R UL(tk−k1 )Dj UCo (tk−k1 + t0)ρP(tk−k1 )UCo (tk−k1 + t0) UL(tk−k1 ) = ρL ∀ t0, tk−k1 ∈ . (160) as such we define the error term ˆ † ⊗K ⊗K† E(t) := UL(t)Dj UCo (t + t0)δ(t)UCo (t + t0) UL(t). (161)
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 22 ~k Let us assume we apply an arbitrary decoder D to ρP. The fidelity with an arbitrary initial pure state |ψi hψ| is
dC−1 X 2 1 ˆ 1 ˆ hψ| |Ak| D ρP(tk−k1 ) + δ(tk−k1 ) |ψi ≤ max hψ| D ρP(tk−k1 ) + δ(tk−k1 ) |ψi (162) dC k dC k=0 1 ˆ ≤ 1 − min hψ| D δ(tk−k1 ) |ψi (163) dC k 2 which shows that a the Salecker-Wigner-Peres clock with |Ak| = δk,k0 is the optimal choice. ˆ Crucially, the term in the optimization hψ| D δ(tk−k1 ) |ψi now only depends on parameters of the encoding E and decoding D independently of the clock and its dimension dC. Now, let us assume there exists a sequence of encoding-decoding schemes such that for some fixed dP, ˆ lim min hψ| Dl δl(tk−k ) |ψi = 0. (164) l→∞ k 1 If this were true, one could achieve an arbitrarily large entanglement fidelity for all pure states without increasing the size of the clock. This contradicts the existing no-go results [7, 26], so there must exist a constant C, such ˆ that for all D and δ(tk−k1 ) with fixed dP ˆ min hψ| D δ(tk−k ) |ψi ≥ C > 0, (165) k 1 ˆ which can be chosen such that the inequality is saturated for some D and δ(tk−k1 ). Hence, we have that C fworst(K) ≤ 1 − . (166) dC On the other hand, since the Salecker-Wigner-Peres clock saturates the inequalities (162) and (163) we can † apply the decoder UL(t)DjUL(t) in (159) to obtain C∗ fworst(K) = 1 − , (167) dC ∗ 1 ˆ for some C ≥ C, as the only dependence with the dimension of the clock is in the term δ(tk−k ). dC 1
F Proof of Theorem3
We just need to show that with L dC-dimensional clocks we can construct a clock state with the same properties as a single clock of dimension L(dC −1)+1. Let us take the Hamiltonian of L non-interacting clocks of dimension dC, L L(dC−1) M X X Htot = HC = ωr |Er,αihEr,α| (168) l=1 r=0 α which has energy levels {0,L(dC − 1)}, and α is the degeneracy index, as this new Hamiltonian has a very large degeneracy. Let us choose an arbitrary non-degenerate subspace of maximal dimension d(L) := L(dC − 1) + 1, 11 such that Htot = Hclock ⊕ˆ H⊥. This can be done for instance by choosing all the eigenvectors with a fixed α = 1, in which case d −1 XL Hclock = ωr|Er,1ihEr,1|. (169) r=0 This defines a subspace with dimension d(L) and with a Hamiltonian with equally-spaced energy levels with gap ω. Now given any single clock state ρ = PdC−1 A |r ihr | ∈ S(H ) in a d dimensional space, we can C r1,r2=0 r1,r2 1 2 C C C construct a d(L) dimensional space via the mappings d 7→ d(L) and ρ 7→ ρ0 := Pd(L)−1 A |E ihE | ∈ C C r1,r2=0 r1,r2 r1,1 r2,1 ⊗L S(HC ). This large dimensional clock state will now be a superposition of product states (the energy eigenstates) and will thus be entangled. Thus, in any scheme that uses a clock with dimension dC, such that it achieves a fidelity bounded by f(dC) (either from above or below), one can now use this d(L) dimensional clock, to achieve a fidelity bounded by f(d(L)) (again, either from above or below). This way, we can use a large amount of clocks to vastly improve the performance of the codes.
11Here ⊕ˆ denotes the Direct sum.
Accepted in Quantum 2020-02-22, click title to verify. Published under CC-BY 4.0. 23 G The converse bound from [26]
Here we show how to adapt the bound from [26] to our setting 12. To understand why the bound cannot be straightforwardly applied to our setting, first recall our definition of the covariant code Ecov(·). For all t ∈ R, ⊗K and a given encoding E(·) and group representations UL(t),UCo(t) , we define
⊗K † †⊗K Et(·) := UCo(t) E(UL(t)(·)UL(t))UCo(t) . (170) The covariant encoding that we use throughout our work is then the CPTP map:
Z T0 1 ⊗M (M) †⊗M Ecov(·) := dt Et(·) ⊗ UC(t) ρC UC(t) . (171) T0 0
This construction is by definition not an isometry, and in general the output Ecov(·) is a mixed state even for pure inputs. However, the theorem of [26] assumes that the encoding map is an isometry, and as such it does not directly apply to our results. However, since in our setup we assume that the encoding of Eq. (171) is covariant, it is possible to construct a Stinespring dilation with an isometry to which the bound of [26] can be directly applied. We can construct the Stinespring dilation with an isometry directly for Eq. (171). However, since in our set-up M − N clocks are lost due to erasure errors, and the erased clocks are inaccessible, we can trace out M −N clocks and work with the resultant effective encoding map instead. Since we also assumed no correlations between the erased and non-erased clocks, this leads to the effective channel
Z T0 1 ⊗N (N) †⊗N trCN+1...CM [Ecov(·)] = dt Et(·) ⊗ UC(t) ρC UC(t) . (172) T0 0 Finally, since in some instances the generator of the unitary group on the clock can be exchanged for an effective generator w.l.o.g. (noticeably Theorem3), we will assume in Eq. (172) that the unitary representation of the ⊗N ⊗N −itH¯C compact U(1) group on the clock UC(t) , takes on the generic form UC(t) = e and specialise it later in this section to specific cases. We can now proceed with the isometry. Notice that E(·) can be dilated to an isometry VL→CoA defined such (N) that the representation of the symmetry group acts trivially on system A. Also, the state ρC may not be a (N) pure state, but it can also be dilated to |ΨCC¯ i hΨCC¯ | , again such that the symmetry group again acts trivially on system C.¯ We thus define 1 Z T0 E¯ (·) := dtV (·) ⊗ U (t)⊗N ⊗ 1⊗N |Ψ ihΨ | U (t)†⊗N ⊗ 1⊗N , (173) cov t C C¯ CC¯ CC¯ C C¯ T0 0 where now we have