Bin packing and unbounded configuration-LP gaps

Rounding up the fractional bin count can be wrong by any fixed number of bins.

1 paper September 24, 2026 Explained by AI

Bin packing asks how few bins of size one can hold a list of items. A fractional relaxation, the configuration LP, gives a lower bound. It was conjectured to be off by at most one bin beyond rounding up. This paper proves the true count can exceed a whole-number LP value by any fixed amount. It also proves that staying within a fixed number of extra bins is NP-hard.

First step
1995
Scheithauer and Terno, modified round-up bound
Significance
Major
If it holds, it settles a named conjecture and a textbook open problem on bin packing.
Trust
Formal proof listed
Field
Theoretical computer science
1 paper

The explanation

Take five items, each filling 0.4 of a bin. A bin holds a total of at most 1. Two items fit, using 0.8. Three do not, since they need 1.2. So the five items need three bins: two full pairs and one lone item. Packing items into as few bins as possible is called bin packing.

Now pretend bins could be shared out in fractions. Each bin carries a pair, so five items need two and a half bins. This pretend count has a name, the configuration LP (a linear program over bin patterns). List every way to fill one bin, called a pattern. Give each pattern a weight, which may be a fraction. Every item must be covered, and the total weight is kept as small as possible. The result never exceeds the true number of bins. Here it is 2.5, and rounding up gives exactly 3.

The idea goes back to cutting stock, with Gilmore and Gomory's method from 1961. People asked whether rounding up always gives the true answer. Odile Marcotte found an instance where it fails, in papers from 1985 and 1986. Guntram Scheithauer and Johannes Terno then studied a weaker bound. It allows one bin more than the rounded-up value. This is now called the Modified Integer Round-Up Conjecture. For the five items, it would allow up to four bins.

Fast methods show the same pattern. Here "fast" means a running time that grows like a fixed power of the input's length. Karmarkar and Karp in 1982 got within an extra amount growing like the square of the logarithm of the optimum. Hoberg and Rothvoss in 2017 cut this to an amount growing like the logarithm. Their method flips coins, and its bound is measured against the configuration LP. Williamson and Shmoys's 2011 textbook listed an open question. Can one fast method always stay within a fixed number of extra bins?

This paper answers both questions with no. Pick any whole number c, such as 1 or 100. It builds an instance whose configuration LP equals a whole number B exactly. Yet no packing fits into B plus c bins. Taking c equal to 1 breaks the conjecture. Every item is larger than 1/6, so no bin holds more than five. The LP value also stays B for a stricter LP whose patterns use each physical item copy at most once.

The second result concerns fast methods. Fix any c. Telling instances that fit in B bins from those needing more than B plus c is NP-hard. NP-hard means a fast method for it would give fast methods for every problem in a large class called NP. So a fast method with a fixed allowance of extra bins exists exactly when P equals NP. Whether P equals NP is itself unproved.

The obstacle was that a real packing may use any pattern at all. Earlier constructions only blocked methods that round the patterns the LP happened to choose. A true gap must defeat every possible packing. The paper encodes a network problem into item sizes near 1/5. The problem is vertex cover: choosing points in a network so that every link has at least one chosen end. Any packing into few bins can be read back as a small such choice. For the gap, the network is four points all joined. Covering every link needs three points, but a tight packing would yield fewer. So no tight packing exists.

The gap comes at a price in size. The instances can grow very rapidly as c grows. The paper does not give a matching logarithmic lower bound in terms of instance size. So the logarithmic upper bounds above remain consistent with it. The gap result needs no unproved assumption, while the hardness result is about methods that do not flip coins.

How sure is this? A computer proof checker called Lean has checked formal versions of the main statements. They cover the gap for both LPs, the hardness for each c, and the link to P versus NP. The Lean statement is matched against a fixed reference statement by a tool called Comparator. No specialist review of the paper has been published.

What it doesn't show. This does not contradict the known methods that stay within a logarithmic number of extra bins.

Where it came from

This result comes from an unreleased OpenAI model, published in the openai/math release on 6 October 2026.

Hype check

Major if the proof holds. Lean checks formal versions of the main statements. No specialist review is published. The instances are very large, and hardness says nothing unless P differs from NP.

Words used

Bin packing
Putting items of given sizes into as few bins of size one as possible.
Configuration LP
A relaxed count of bins that lets bin patterns be used in fractional amounts.
Pattern
One way to fill a single bin with items whose sizes add up to at most one.
Modified Integer Round-Up Conjecture
The guess that the true bin count is at most the rounded-up LP value plus one.
NP-hard
At least as hard as every problem in the class NP, so a fast method would give fast methods for all of them.
P equals NP
The unproved possibility that every problem whose answers are quick to check is also quick to solve.
Vertex cover
A set of points in a network that includes at least one end of every link.

The original paper

All quoted lines (13)

  1. For every integer c≥0c\ge0, there is a finite rational bin-packing instance II and an integer BB such that every item size exceeds 1/61/6 and \LP(I)=B,\OPT(I)>B+c.\LP(I)=B, \qquad \OPT(I)>B+c.
    Additive hardness and unbounded configuration gaps in bin packing Back to text
  2. Taking c=1c=1 contradicts Equation (…), so Theorem … disproves the Modified Integer Round-Up Conjecture.
    Additive hardness and unbounded configuration gaps in bin packing Back to text
  3. All constructions use sizes greater than 1/61/6, so each feasible bin contains at most five items.
    Additive hardness and unbounded configuration gaps in bin packing Back to text
  4. The equality for the fractional optimum also holds for the configuration LP whose patterns are subsets of the individual item copies.
    Additive hardness and unbounded configuration gaps in bin packing Back to text
  5. For every fixed integer c≥0c\ge0, it is NP-hard to distinguish pairs (I,B)(I,B) such that II packs into BB bins from pairs such that II cannot be packed into B+cB+c bins.
    Additive hardness and unbounded configuration gaps in bin packing Back to text
  6. A deterministic polynomial-time algorithm that always uses at most \OPT(I)+C\OPT(I)+C bins for some absolute constant CC exists if and only if \classP=\classNP\classP=\classNP.
    Additive hardness and unbounded configuration gaps in bin packing Back to text
  7. Newman, Neiman, and Nikolov, and Eisenbrand, P\'alv\"olgyi, and Rothvoss used discrepancy constructions to prove logarithmic obstructions for algorithms restricted to rounding a supplied fractional support.
    Additive hardness and unbounded configuration gaps in bin packing Back to text
  8. A gap for the full configuration LP must therefore control all such packings, rather than only the chosen support.
    Additive hardness and unbounded configuration gaps in bin packing Back to text
  9. All coordinates and subclass constraints are encoded in ordinary scalar sizes near 1/51/5. An arbitrary feasible packing need not consist of the intended bins.
    Additive hardness and unbounded configuration gaps in bin packing Back to text
  10. The minimum vertex cover of this graph has size three, whereas k+ρn=2+48=52<3.k+\rho n=2+\frac48=\frac52<3.
    Additive hardness and unbounded configuration gaps in bin packing Back to text
  11. These logarithmic upper bounds are compatible with Theorem …: the constructed instances can grow very rapidly with the prescribed gap. We do not obtain a matching logarithmic lower bound as a function of their size.
    Additive hardness and unbounded configuration gaps in bin packing Back to text
  12. Theorem … assumes no separation of complexity classes.
    Additive hardness and unbounded configuration gaps in bin packing Back to text
  13. We consider deterministic algorithms whose running time is polynomial in the length of this explicit encoding.
    Additive hardness and unbounded configuration gaps in bin packing Back to text

Other sources

  1. P. C. Gilmore and R. E. Gomory, “A linear programming approach to the cutting-stock problem”, Operations Research 9(6) (1961), 849–859
  2. O. Marcotte, “An instance of the cutting stock problem for which the rounding property does not hold”, Operations Research Letters 4(5) (1986), 239–243
  3. G. Scheithauer and J. Terno, “The modified integer round-up property of the one-dimensional cutting stock problem”, European Journal of Operational Research 84(3) (1995), 562–571
  4. N. Karmarkar and R. M. Karp, “An efficient approximation scheme for the one-dimensional bin-packing problem”, FOCS (1982), 312–320
  5. R. Hoberg and T. Rothvoss, “A logarithmic additive integrality gap for bin packing”, SODA (2017), 2616–2625
  6. D. P. Williamson and D. B. Shmoys, The Design of Approximation Algorithms, Cambridge University Press (2011), Chapter 17, Problem 3
  7. openai/math, “Additive hardness and unbounded configuration gaps in bin packing” (September 24, 2026) Taking c=1c=1 contradicts Equation (…), so